{- (c) The AQUA Project, Glasgow University, 1993-1998 \section[Simplify]{The main module of the simplifier} -} {-# LANGUAGE CPP #-} module Simplify ( simplTopBinds, simplExpr, simplRules ) where #include "HsVersions.h" import DynFlags import SimplMonad import Type hiding ( substTy, substTyVar, extendTvSubst, extendCvSubst ) import SimplEnv import SimplUtils import FamInstEnv ( FamInstEnv ) import Literal ( litIsLifted ) --, mkMachInt ) -- temporalily commented out. See #8326 import Id import MkId ( seqId, voidPrimId ) import MkCore ( mkImpossibleExpr, castBottomExpr ) import IdInfo import Name ( Name, mkSystemVarName, isExternalName, getOccFS ) import Coercion hiding ( substCo, substCoVar ) import OptCoercion ( optCoercion ) import FamInstEnv ( topNormaliseType_maybe ) import DataCon ( DataCon, dataConWorkId, dataConRepStrictness , isMarkedStrict, dataConRepArgTys ) --, dataConTyCon, dataConTag, fIRST_TAG ) --import TyCon ( isEnumerationTyCon ) -- temporalily commented out. See #8326 import CoreMonad ( Tick(..), SimplifierMode(..) ) import CoreSyn import Demand ( StrictSig(..), dmdTypeDepth, isStrictDmd ) import PprCore ( pprCoreExpr ) import CoreUnfold import CoreUtils import CoreArity --import PrimOp ( tagToEnumKey ) -- temporalily commented out. See #8326 import Rules ( mkRuleInfo, lookupRule, getRules ) import TysPrim ( voidPrimTy ) --, intPrimTy ) -- temporalily commented out. See #8326 import BasicTypes ( TopLevelFlag(..), isTopLevel, RecFlag(..) ) import MonadUtils ( foldlM, mapAccumLM, liftIO ) import Maybes ( orElse ) --import Unique ( hasKey ) -- temporalily commented out. See #8326 import Control.Monad import Outputable import FastString import Pair import Util import ErrUtils {- The guts of the simplifier is in this module, but the driver loop for the simplifier is in SimplCore.hs. ----------------------------------------- *** IMPORTANT NOTE *** ----------------------------------------- The simplifier used to guarantee that the output had no shadowing, but it does not do so any more. (Actually, it never did!) The reason is documented with simplifyArgs. ----------------------------------------- *** IMPORTANT NOTE *** ----------------------------------------- Many parts of the simplifier return a bunch of "floats" as well as an expression. This is wrapped as a datatype SimplUtils.FloatsWith. All "floats" are let-binds, not case-binds, but some non-rec lets may be unlifted (with RHS ok-for-speculation). ----------------------------------------- ORGANISATION OF FUNCTIONS ----------------------------------------- simplTopBinds - simplify all top-level binders - for NonRec, call simplRecOrTopPair - for Rec, call simplRecBind ------------------------------ simplExpr (applied lambda) ==> simplNonRecBind simplExpr (Let (NonRec ...) ..) ==> simplNonRecBind simplExpr (Let (Rec ...) ..) ==> simplify binders; simplRecBind ------------------------------ simplRecBind [binders already simplfied] - use simplRecOrTopPair on each pair in turn simplRecOrTopPair [binder already simplified] Used for: recursive bindings (top level and nested) top-level non-recursive bindings Returns: - check for PreInlineUnconditionally - simplLazyBind simplNonRecBind Used for: non-top-level non-recursive bindings beta reductions (which amount to the same thing) Because it can deal with strict arts, it takes a "thing-inside" and returns an expression - check for PreInlineUnconditionally - simplify binder, including its IdInfo - if strict binding simplStrictArg mkAtomicArgs completeNonRecX else simplLazyBind addFloats simplNonRecX: [given a *simplified* RHS, but an *unsimplified* binder] Used for: binding case-binder and constr args in a known-constructor case - check for PreInLineUnconditionally - simplify binder - completeNonRecX ------------------------------ simplLazyBind: [binder already simplified, RHS not] Used for: recursive bindings (top level and nested) top-level non-recursive bindings non-top-level, but *lazy* non-recursive bindings [must not be strict or unboxed] Returns floats + an augmented environment, not an expression - substituteIdInfo and add result to in-scope [so that rules are available in rec rhs] - simplify rhs - mkAtomicArgs - float if exposes constructor or PAP - completeBind completeNonRecX: [binder and rhs both simplified] - if the the thing needs case binding (unlifted and not ok-for-spec) build a Case else completeBind addFloats completeBind: [given a simplified RHS] [used for both rec and non-rec bindings, top level and not] - try PostInlineUnconditionally - add unfolding [this is the only place we add an unfolding] - add arity Right hand sides and arguments ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ In many ways we want to treat (a) the right hand side of a let(rec), and (b) a function argument in the same way. But not always! In particular, we would like to leave these arguments exactly as they are, so they will match a RULE more easily. f (g x, h x) g (+ x) It's harder to make the rule match if we ANF-ise the constructor, or eta-expand the PAP: f (let { a = g x; b = h x } in (a,b)) g (\y. + x y) On the other hand if we see the let-defns p = (g x, h x) q = + x then we *do* want to ANF-ise and eta-expand, so that p and q can be safely inlined. Even floating lets out is a bit dubious. For let RHS's we float lets out if that exposes a value, so that the value can be inlined more vigorously. For example r = let x = e in (x,x) Here, if we float the let out we'll expose a nice constructor. We did experiments that showed this to be a generally good thing. But it was a bad thing to float lets out unconditionally, because that meant they got allocated more often. For function arguments, there's less reason to expose a constructor (it won't get inlined). Just possibly it might make a rule match, but I'm pretty skeptical. So for the moment we don't float lets out of function arguments either. Eta expansion ~~~~~~~~~~~~~~ For eta expansion, we want to catch things like case e of (a,b) -> \x -> case a of (p,q) -> \y -> r If the \x was on the RHS of a let, we'd eta expand to bring the two lambdas together. And in general that's a good thing to do. Perhaps we should eta expand wherever we find a (value) lambda? Then the eta expansion at a let RHS can concentrate solely on the PAP case. ************************************************************************ * * \subsection{Bindings} * * ************************************************************************ -} simplTopBinds :: SimplEnv -> [InBind] -> SimplM SimplEnv simplTopBinds env0 binds0 = do { -- Put all the top-level binders into scope at the start -- so that if a transformation rule has unexpectedly brought -- anything into scope, then we don't get a complaint about that. -- It's rather as if the top-level binders were imported. -- See note [Glomming] in OccurAnal. ; env1 <- simplRecBndrs env0 (bindersOfBinds binds0) ; env2 <- simpl_binds env1 binds0 ; freeTick SimplifierDone ; return env2 } where -- We need to track the zapped top-level binders, because -- they should have their fragile IdInfo zapped (notably occurrence info) -- That's why we run down binds and bndrs' simultaneously. -- simpl_binds :: SimplEnv -> [InBind] -> SimplM SimplEnv simpl_binds env [] = return env simpl_binds env (bind:binds) = do { env' <- simpl_bind env bind ; simpl_binds env' binds } simpl_bind env (Rec pairs) = simplRecBind env TopLevel pairs simpl_bind env (NonRec b r) = do { (env', b') <- addBndrRules env b (lookupRecBndr env b) ; simplRecOrTopPair env' TopLevel NonRecursive b b' r } {- ************************************************************************ * * \subsection{Lazy bindings} * * ************************************************************************ simplRecBind is used for * recursive bindings only -} simplRecBind :: SimplEnv -> TopLevelFlag -> [(InId, InExpr)] -> SimplM SimplEnv simplRecBind env0 top_lvl pairs0 = do { (env_with_info, triples) <- mapAccumLM add_rules env0 pairs0 ; env1 <- go (zapFloats env_with_info) triples ; return (env0 `addRecFloats` env1) } -- addFloats adds the floats from env1, -- _and_ updates env0 with the in-scope set from env1 where add_rules :: SimplEnv -> (InBndr,InExpr) -> SimplM (SimplEnv, (InBndr, OutBndr, InExpr)) -- Add the (substituted) rules to the binder add_rules env (bndr, rhs) = do { (env', bndr') <- addBndrRules env bndr (lookupRecBndr env bndr) ; return (env', (bndr, bndr', rhs)) } go env [] = return env go env ((old_bndr, new_bndr, rhs) : pairs) = do { env' <- simplRecOrTopPair env top_lvl Recursive old_bndr new_bndr rhs ; go env' pairs } {- simplOrTopPair is used for * recursive bindings (whether top level or not) * top-level non-recursive bindings It assumes the binder has already been simplified, but not its IdInfo. -} simplRecOrTopPair :: SimplEnv -> TopLevelFlag -> RecFlag -> InId -> OutBndr -> InExpr -- Binder and rhs -> SimplM SimplEnv -- Returns an env that includes the binding simplRecOrTopPair env top_lvl is_rec old_bndr new_bndr rhs = do { dflags <- getDynFlags ; trace_bind dflags $ if preInlineUnconditionally dflags env top_lvl old_bndr rhs -- Check for unconditional inline then do tick (PreInlineUnconditionally old_bndr) return (extendIdSubst env old_bndr (mkContEx env rhs)) else simplLazyBind env top_lvl is_rec old_bndr new_bndr rhs env } where trace_bind dflags thing_inside | not (dopt Opt_D_verbose_core2core dflags) = thing_inside | otherwise = pprTrace "SimplBind" (ppr old_bndr) thing_inside -- trace_bind emits a trace for each top-level binding, which -- helps to locate the tracing for inlining and rule firing {- simplLazyBind is used for * [simplRecOrTopPair] recursive bindings (whether top level or not) * [simplRecOrTopPair] top-level non-recursive bindings * [simplNonRecE] non-top-level *lazy* non-recursive bindings Nota bene: 1. It assumes that the binder is *already* simplified, and is in scope, and its IdInfo too, except unfolding 2. It assumes that the binder type is lifted. 3. It does not check for pre-inline-unconditionally; that should have been done already. -} simplLazyBind :: SimplEnv -> TopLevelFlag -> RecFlag -> InId -> OutId -- Binder, both pre-and post simpl -- The OutId has IdInfo, except arity, unfolding -> InExpr -> SimplEnv -- The RHS and its environment -> SimplM SimplEnv -- Precondition: rhs obeys the let/app invariant simplLazyBind env top_lvl is_rec bndr bndr1 rhs rhs_se = -- pprTrace "simplLazyBind" ((ppr bndr <+> ppr bndr1) $$ ppr rhs $$ ppr (seIdSubst rhs_se)) $ do { let rhs_env = rhs_se `setInScope` env (tvs, body) = case collectTyAndValBinders rhs of (tvs, [], body) | surely_not_lam body -> (tvs, body) _ -> ([], rhs) surely_not_lam (Lam {}) = False surely_not_lam (Tick t e) | not (tickishFloatable t) = surely_not_lam e -- eta-reduction could float surely_not_lam _ = True -- Do not do the "abstract tyyvar" thing if there's -- a lambda inside, because it defeats eta-reduction -- f = /\a. \x. g a x -- should eta-reduce. ; (body_env, tvs') <- simplBinders rhs_env tvs -- See Note [Floating and type abstraction] in SimplUtils -- Simplify the RHS ; let rhs_cont = mkRhsStop (substTy body_env (exprType body)) ; (body_env1, body1) <- simplExprF body_env body rhs_cont -- ANF-ise a constructor or PAP rhs ; (body_env2, body2) <- prepareRhs top_lvl body_env1 bndr1 body1 ; (env', rhs') <- if not (doFloatFromRhs top_lvl is_rec False body2 body_env2) then -- No floating, revert to body1 do { rhs' <- mkLam tvs' (wrapFloats body_env1 body1) rhs_cont ; return (env, rhs') } else if null tvs then -- Simple floating do { tick LetFloatFromLet ; return (addFloats env body_env2, body2) } else -- Do type-abstraction first do { tick LetFloatFromLet ; (poly_binds, body3) <- abstractFloats tvs' body_env2 body2 ; rhs' <- mkLam tvs' body3 rhs_cont ; env' <- foldlM (addPolyBind top_lvl) env poly_binds ; return (env', rhs') } ; completeBind env' top_lvl bndr bndr1 rhs' } {- A specialised variant of simplNonRec used when the RHS is already simplified, notably in knownCon. It uses case-binding where necessary. -} simplNonRecX :: SimplEnv -> InId -- Old binder -> OutExpr -- Simplified RHS -> SimplM SimplEnv -- Precondition: rhs satisfies the let/app invariant simplNonRecX env bndr new_rhs | isDeadBinder bndr -- Not uncommon; e.g. case (a,b) of c { (p,q) -> p } = return env -- Here c is dead, and we avoid creating -- the binding c = (a,b) | Coercion co <- new_rhs = return (extendCvSubst env bndr co) | otherwise = do { (env', bndr') <- simplBinder env bndr ; completeNonRecX NotTopLevel env' (isStrictId bndr) bndr bndr' new_rhs } -- simplNonRecX is only used for NotTopLevel things completeNonRecX :: TopLevelFlag -> SimplEnv -> Bool -> InId -- Old binder -> OutId -- New binder -> OutExpr -- Simplified RHS -> SimplM SimplEnv -- Precondition: rhs satisfies the let/app invariant -- See Note [CoreSyn let/app invariant] in CoreSyn completeNonRecX top_lvl env is_strict old_bndr new_bndr new_rhs = do { (env1, rhs1) <- prepareRhs top_lvl (zapFloats env) new_bndr new_rhs ; (env2, rhs2) <- if doFloatFromRhs NotTopLevel NonRecursive is_strict rhs1 env1 then do { tick LetFloatFromLet ; return (addFloats env env1, rhs1) } -- Add the floats to the main env else return (env, wrapFloats env1 rhs1) -- Wrap the floats around the RHS ; completeBind env2 NotTopLevel old_bndr new_bndr rhs2 } {- {- No, no, no! Do not try preInlineUnconditionally in completeNonRecX Doing so risks exponential behaviour, because new_rhs has been simplified once already In the cases described by the folowing commment, postInlineUnconditionally will catch many of the relevant cases. -- This happens; for example, the case_bndr during case of -- known constructor: case (a,b) of x { (p,q) -> ... } -- Here x isn't mentioned in the RHS, so we don't want to -- create the (dead) let-binding let x = (a,b) in ... -- -- Similarly, single occurrences can be inlined vigourously -- e.g. case (f x, g y) of (a,b) -> .... -- If a,b occur once we can avoid constructing the let binding for them. Furthermore in the case-binding case preInlineUnconditionally risks extra thunks -- Consider case I# (quotInt# x y) of -- I# v -> let w = J# v in ... -- If we gaily inline (quotInt# x y) for v, we end up building an -- extra thunk: -- let w = J# (quotInt# x y) in ... -- because quotInt# can fail. | preInlineUnconditionally env NotTopLevel bndr new_rhs = thing_inside (extendIdSubst env bndr (DoneEx new_rhs)) -} ---------------------------------- prepareRhs takes a putative RHS, checks whether it's a PAP or constructor application and, if so, converts it to ANF, so that the resulting thing can be inlined more easily. Thus x = (f a, g b) becomes t1 = f a t2 = g b x = (t1,t2) We also want to deal well cases like this v = (f e1 `cast` co) e2 Here we want to make e1,e2 trivial and get x1 = e1; x2 = e2; v = (f x1 `cast` co) v2 That's what the 'go' loop in prepareRhs does -} prepareRhs :: TopLevelFlag -> SimplEnv -> OutId -> OutExpr -> SimplM (SimplEnv, OutExpr) -- Adds new floats to the env iff that allows us to return a good RHS prepareRhs top_lvl env id (Cast rhs co) -- Note [Float coercions] | Pair ty1 _ty2 <- coercionKind co -- Do *not* do this if rhs has an unlifted type , not (isUnliftedType ty1) -- see Note [Float coercions (unlifted)] = do { (env', rhs') <- makeTrivialWithInfo top_lvl env (getOccFS id) sanitised_info rhs ; return (env', Cast rhs' co) } where sanitised_info = vanillaIdInfo `setStrictnessInfo` strictnessInfo info `setDemandInfo` demandInfo info info = idInfo id prepareRhs top_lvl env0 id rhs0 = do { (_is_exp, env1, rhs1) <- go 0 env0 rhs0 ; return (env1, rhs1) } where go n_val_args env (Cast rhs co) = do { (is_exp, env', rhs') <- go n_val_args env rhs ; return (is_exp, env', Cast rhs' co) } go n_val_args env (App fun (Type ty)) = do { (is_exp, env', rhs') <- go n_val_args env fun ; return (is_exp, env', App rhs' (Type ty)) } go n_val_args env (App fun arg) = do { (is_exp, env', fun') <- go (n_val_args+1) env fun ; case is_exp of True -> do { (env'', arg') <- makeTrivial top_lvl env' (getOccFS id) arg ; return (True, env'', App fun' arg') } False -> return (False, env, App fun arg) } go n_val_args env (Var fun) = return (is_exp, env, Var fun) where is_exp = isExpandableApp fun n_val_args -- The fun a constructor or PAP -- See Note [CONLIKE pragma] in BasicTypes -- The definition of is_exp should match that in -- OccurAnal.occAnalApp go n_val_args env (Tick t rhs) -- We want to be able to float bindings past this -- tick. Non-scoping ticks don't care. | tickishScoped t == NoScope = do { (is_exp, env', rhs') <- go n_val_args env rhs ; return (is_exp, env', Tick t rhs') } -- On the other hand, for scoping ticks we need to be able to -- copy them on the floats, which in turn is only allowed if -- we can obtain non-counting ticks. | not (tickishCounts t) || tickishCanSplit t = do { (is_exp, env', rhs') <- go n_val_args (zapFloats env) rhs ; let tickIt (id, expr) = (id, mkTick (mkNoCount t) expr) floats' = seFloats $ env `addFloats` mapFloats env' tickIt ; return (is_exp, env' { seFloats = floats' }, Tick t rhs') } go _ env other = return (False, env, other) {- Note [Float coercions] ~~~~~~~~~~~~~~~~~~~~~~ When we find the binding x = e `cast` co we'd like to transform it to x' = e x = x `cast` co -- A trivial binding There's a chance that e will be a constructor application or function, or something like that, so moving the coercion to the usage site may well cancel the coercions and lead to further optimisation. Example: data family T a :: * data instance T Int = T Int foo :: Int -> Int -> Int foo m n = ... where x = T m go 0 = 0 go n = case x of { T m -> go (n-m) } -- This case should optimise Note [Preserve strictness when floating coercions] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ In the Note [Float coercions] transformation, keep the strictness info. Eg f = e `cast` co -- f has strictness SSL When we transform to f' = e -- f' also has strictness SSL f = f' `cast` co -- f still has strictness SSL Its not wrong to drop it on the floor, but better to keep it. Note [Float coercions (unlifted)] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ BUT don't do [Float coercions] if 'e' has an unlifted type. This *can* happen: foo :: Int = (error (# Int,Int #) "urk") `cast` CoUnsafe (# Int,Int #) Int If do the makeTrivial thing to the error call, we'll get foo = case error (# Int,Int #) "urk" of v -> v `cast` ... But 'v' isn't in scope! These strange casts can happen as a result of case-of-case bar = case (case x of { T -> (# 2,3 #); F -> error "urk" }) of (# p,q #) -> p+q -} makeTrivialArg :: SimplEnv -> ArgSpec -> SimplM (SimplEnv, ArgSpec) makeTrivialArg env (ValArg e) = do { (env', e') <- makeTrivial NotTopLevel env (fsLit "arg") e ; return (env', ValArg e') } makeTrivialArg env arg = return (env, arg) -- CastBy, TyArg makeTrivial :: TopLevelFlag -> SimplEnv -> FastString -- ^ a "friendly name" to build the new binder from -> OutExpr -> SimplM (SimplEnv, OutExpr) -- Binds the expression to a variable, if it's not trivial, returning the variable makeTrivial top_lvl env context expr = makeTrivialWithInfo top_lvl env context vanillaIdInfo expr makeTrivialWithInfo :: TopLevelFlag -> SimplEnv -> FastString -- ^ a "friendly name" to build the new binder from -> IdInfo -> OutExpr -> SimplM (SimplEnv, OutExpr) -- Propagate strictness and demand info to the new binder -- Note [Preserve strictness when floating coercions] -- Returned SimplEnv has same substitution as incoming one makeTrivialWithInfo top_lvl env context info expr | exprIsTrivial expr -- Already trivial || not (bindingOk top_lvl expr expr_ty) -- Cannot trivialise -- See Note [Cannot trivialise] = return (env, expr) | otherwise -- See Note [Take care] below = do { uniq <- getUniqueM ; let name = mkSystemVarName uniq context var = mkLocalIdOrCoVarWithInfo name expr_ty info ; env' <- completeNonRecX top_lvl env False var var expr ; expr' <- simplVar env' var ; return (env', expr') } -- The simplVar is needed becase we're constructing a new binding -- a = rhs -- And if rhs is of form (rhs1 |> co), then we might get -- a1 = rhs1 -- a = a1 |> co -- and now a's RHS is trivial and can be substituted out, and that -- is what completeNonRecX will do -- To put it another way, it's as if we'd simplified -- let var = e in var where expr_ty = exprType expr bindingOk :: TopLevelFlag -> CoreExpr -> Type -> Bool -- True iff we can have a binding of this expression at this level -- Precondition: the type is the type of the expression bindingOk top_lvl _ expr_ty | isTopLevel top_lvl = not (isUnliftedType expr_ty) | otherwise = True {- Note [Cannot trivialise] ~~~~~~~~~~~~~~~~~~~~~~~~ Consider tih f :: Int -> Addr# foo :: Bar foo = Bar (f 3) Then we can't ANF-ise foo, even though we'd like to, because we can't make a top-level binding for the Addr# (f 3). And if so we don't want to turn it into foo = let x = f 3 in Bar x because we'll just end up inlining x back, and that makes the simplifier loop. Better not to ANF-ise it at all. A case in point is literal strings (a MachStr is not regarded as trivial): foo = Ptr "blob"# We don't want to ANF-ise this. ************************************************************************ * * \subsection{Completing a lazy binding} * * ************************************************************************ completeBind * deals only with Ids, not TyVars * takes an already-simplified binder and RHS * is used for both recursive and non-recursive bindings * is used for both top-level and non-top-level bindings It does the following: - tries discarding a dead binding - tries PostInlineUnconditionally - add unfolding [this is the only place we add an unfolding] - add arity It does *not* attempt to do let-to-case. Why? Because it is used for - top-level bindings (when let-to-case is impossible) - many situations where the "rhs" is known to be a WHNF (so let-to-case is inappropriate). Nor does it do the atomic-argument thing -} completeBind :: SimplEnv -> TopLevelFlag -- Flag stuck into unfolding -> InId -- Old binder -> OutId -> OutExpr -- New binder and RHS -> SimplM SimplEnv -- completeBind may choose to do its work -- * by extending the substitution (e.g. let x = y in ...) -- * or by adding to the floats in the envt -- -- Precondition: rhs obeys the let/app invariant completeBind env top_lvl old_bndr new_bndr new_rhs | isCoVar old_bndr = case new_rhs of Coercion co -> return (extendCvSubst env old_bndr co) _ -> return (addNonRec env new_bndr new_rhs) | otherwise = ASSERT( isId new_bndr ) do { let old_info = idInfo old_bndr old_unf = unfoldingInfo old_info occ_info = occInfo old_info -- Do eta-expansion on the RHS of the binding -- See Note [Eta-expanding at let bindings] in SimplUtils ; (new_arity, final_rhs) <- tryEtaExpandRhs env new_bndr new_rhs -- Simplify the unfolding ; new_unfolding <- simplLetUnfolding env top_lvl old_bndr final_rhs old_unf ; dflags <- getDynFlags ; if postInlineUnconditionally dflags env top_lvl new_bndr occ_info final_rhs new_unfolding -- Inline and discard the binding then do { tick (PostInlineUnconditionally old_bndr) ; return (extendIdSubst env old_bndr (DoneEx final_rhs)) } -- Use the substitution to make quite, quite sure that the -- substitution will happen, since we are going to discard the binding else do { let info1 = idInfo new_bndr `setArityInfo` new_arity -- Unfolding info: Note [Setting the new unfolding] info2 = info1 `setUnfoldingInfo` new_unfolding -- Demand info: Note [Setting the demand info] -- -- We also have to nuke demand info if for some reason -- eta-expansion *reduces* the arity of the binding to less -- than that of the strictness sig. This can happen: see Note [Arity decrease]. info3 | isEvaldUnfolding new_unfolding || (case strictnessInfo info2 of StrictSig dmd_ty -> new_arity < dmdTypeDepth dmd_ty) = zapDemandInfo info2 `orElse` info2 | otherwise = info2 final_id = new_bndr `setIdInfo` info3 ; -- pprTrace "Binding" (ppr final_id <+> ppr new_unfolding) $ return (addNonRec env final_id final_rhs) } } -- The addNonRec adds it to the in-scope set too ------------------------------ addPolyBind :: TopLevelFlag -> SimplEnv -> OutBind -> SimplM SimplEnv -- Add a new binding to the environment, complete with its unfolding -- but *do not* do postInlineUnconditionally, because we have already -- processed some of the scope of the binding -- We still want the unfolding though. Consider -- let -- x = /\a. let y = ... in Just y -- in body -- Then we float the y-binding out (via abstractFloats and addPolyBind) -- but 'x' may well then be inlined in 'body' in which case we'd like the -- opportunity to inline 'y' too. -- -- INVARIANT: the arity is correct on the incoming binders addPolyBind top_lvl env (NonRec poly_id rhs) = do { unfolding <- simplLetUnfolding env top_lvl poly_id rhs noUnfolding -- Assumes that poly_id did not have an INLINE prag -- which is perhaps wrong. ToDo: think about this ; let final_id = setIdInfo poly_id $ idInfo poly_id `setUnfoldingInfo` unfolding ; return (addNonRec env final_id rhs) } addPolyBind _ env bind@(Rec _) = return (extendFloats env bind) -- Hack: letrecs are more awkward, so we extend "by steam" -- without adding unfoldings etc. At worst this leads to -- more simplifier iterations {- Note [Arity decrease] ~~~~~~~~~~~~~~~~~~~~~~~~ Generally speaking the arity of a binding should not decrease. But it *can* legitimately happen because of RULES. Eg f = g Int where g has arity 2, will have arity 2. But if there's a rewrite rule g Int --> h where h has arity 1, then f's arity will decrease. Here's a real-life example, which is in the output of Specialise: Rec { $dm {Arity 2} = \d.\x. op d {-# RULES forall d. $dm Int d = $s$dm #-} dInt = MkD .... opInt ... opInt {Arity 1} = $dm dInt $s$dm {Arity 0} = \x. op dInt } Here opInt has arity 1; but when we apply the rule its arity drops to 0. That's why Specialise goes to a little trouble to pin the right arity on specialised functions too. Note [Setting the demand info] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ If the unfolding is a value, the demand info may go pear-shaped, so we nuke it. Example: let x = (a,b) in case x of (p,q) -> h p q x Here x is certainly demanded. But after we've nuked the case, we'll get just let x = (a,b) in h a b x and now x is not demanded (I'm assuming h is lazy) This really happens. Similarly let f = \x -> e in ...f..f... After inlining f at some of its call sites the original binding may (for example) be no longer strictly demanded. The solution here is a bit ad hoc... ************************************************************************ * * \subsection[Simplify-simplExpr]{The main function: simplExpr} * * ************************************************************************ The reason for this OutExprStuff stuff is that we want to float *after* simplifying a RHS, not before. If we do so naively we get quadratic behaviour as things float out. To see why it's important to do it after, consider this (real) example: let t = f x in fst t ==> let t = let a = e1 b = e2 in (a,b) in fst t ==> let a = e1 b = e2 t = (a,b) in a -- Can't inline a this round, cos it appears twice ==> e1 Each of the ==> steps is a round of simplification. We'd save a whole round if we float first. This can cascade. Consider let f = g d in \x -> ...f... ==> let f = let d1 = ..d.. in \y -> e in \x -> ...f... ==> let d1 = ..d.. in \x -> ...(\y ->e)... Only in this second round can the \y be applied, and it might do the same again. -} simplExpr :: SimplEnv -> CoreExpr -> SimplM CoreExpr simplExpr env expr = simplExprC env expr (mkBoringStop expr_out_ty) where expr_out_ty :: OutType expr_out_ty = substTy env (exprType expr) simplExprC :: SimplEnv -> CoreExpr -> SimplCont -> SimplM CoreExpr -- Simplify an expression, given a continuation simplExprC env expr cont = -- pprTrace "simplExprC" (ppr expr $$ ppr cont {- $$ ppr (seIdSubst env) -} $$ ppr (seFloats env) ) $ do { (env', expr') <- simplExprF (zapFloats env) expr cont ; -- pprTrace "simplExprC ret" (ppr expr $$ ppr expr') $ -- pprTrace "simplExprC ret3" (ppr (seInScope env')) $ -- pprTrace "simplExprC ret4" (ppr (seFloats env')) $ return (wrapFloats env' expr') } -------------------------------------------------- simplExprF :: SimplEnv -> InExpr -> SimplCont -> SimplM (SimplEnv, OutExpr) simplExprF env e cont = {- pprTrace "simplExprF" (vcat [ ppr e , text "cont =" <+> ppr cont , text "inscope =" <+> ppr (seInScope env) , text "tvsubst =" <+> ppr (seTvSubst env) , text "idsubst =" <+> ppr (seIdSubst env) , text "cvsubst =" <+> ppr (seCvSubst env) {- , ppr (seFloats env) -} ]) $ -} simplExprF1 env e cont simplExprF1 :: SimplEnv -> InExpr -> SimplCont -> SimplM (SimplEnv, OutExpr) simplExprF1 env (Var v) cont = simplIdF env v cont simplExprF1 env (Lit lit) cont = rebuild env (Lit lit) cont simplExprF1 env (Tick t expr) cont = simplTick env t expr cont simplExprF1 env (Cast body co) cont = simplCast env body co cont simplExprF1 env (Coercion co) cont = simplCoercionF env co cont simplExprF1 env (Type ty) cont = ASSERT( contIsRhsOrArg cont ) rebuild env (Type (substTy env ty)) cont simplExprF1 env (App fun arg) cont = simplExprF env fun $ case arg of Type ty -> ApplyToTy { sc_arg_ty = substTy env ty , sc_hole_ty = substTy env (exprType fun) , sc_cont = cont } _ -> ApplyToVal { sc_arg = arg, sc_env = env , sc_dup = NoDup, sc_cont = cont } simplExprF1 env expr@(Lam {}) cont = simplLam env zapped_bndrs body cont -- The main issue here is under-saturated lambdas -- (\x1. \x2. e) arg1 -- Here x1 might have "occurs-once" occ-info, because occ-info -- is computed assuming that a group of lambdas is applied -- all at once. If there are too few args, we must zap the -- occ-info, UNLESS the remaining binders are one-shot where (bndrs, body) = collectBinders expr zapped_bndrs | need_to_zap = map zap bndrs | otherwise = bndrs need_to_zap = any zappable_bndr (drop n_args bndrs) n_args = countArgs cont -- NB: countArgs counts all the args (incl type args) -- and likewise drop counts all binders (incl type lambdas) zappable_bndr b = isId b && not (isOneShotBndr b) zap b | isTyVar b = b | otherwise = zapLamIdInfo b simplExprF1 env (Case scrut bndr _ alts) cont = simplExprF env scrut (Select { sc_dup = NoDup, sc_bndr = bndr , sc_alts = alts , sc_env = env, sc_cont = cont }) simplExprF1 env (Let (Rec pairs) body) cont = do { env' <- simplRecBndrs env (map fst pairs) -- NB: bndrs' don't have unfoldings or rules -- We add them as we go down ; env'' <- simplRecBind env' NotTopLevel pairs ; simplExprF env'' body cont } simplExprF1 env (Let (NonRec bndr rhs) body) cont = simplNonRecE env bndr (rhs, env) ([], body) cont --------------------------------- simplType :: SimplEnv -> InType -> SimplM OutType -- Kept monadic just so we can do the seqType simplType env ty = -- pprTrace "simplType" (ppr ty $$ ppr (seTvSubst env)) $ seqType new_ty `seq` return new_ty where new_ty = substTy env ty --------------------------------- simplCoercionF :: SimplEnv -> InCoercion -> SimplCont -> SimplM (SimplEnv, OutExpr) simplCoercionF env co cont = do { co' <- simplCoercion env co ; rebuild env (Coercion co') cont } simplCoercion :: SimplEnv -> InCoercion -> SimplM OutCoercion simplCoercion env co = let opt_co = optCoercion (getTCvSubst env) co in seqCo opt_co `seq` return opt_co ----------------------------------- -- | Push a TickIt context outwards past applications and cases, as -- long as this is a non-scoping tick, to let case and application -- optimisations apply. simplTick :: SimplEnv -> Tickish Id -> InExpr -> SimplCont -> SimplM (SimplEnv, OutExpr) simplTick env tickish expr cont -- A scoped tick turns into a continuation, so that we can spot -- (scc t (\x . e)) in simplLam and eliminate the scc. If we didn't do -- it this way, then it would take two passes of the simplifier to -- reduce ((scc t (\x . e)) e'). -- NB, don't do this with counting ticks, because if the expr is -- bottom, then rebuildCall will discard the continuation. -- XXX: we cannot do this, because the simplifier assumes that -- the context can be pushed into a case with a single branch. e.g. -- scc<f> case expensive of p -> e -- becomes -- case expensive of p -> scc<f> e -- -- So I'm disabling this for now. It just means we will do more -- simplifier iterations that necessary in some cases. -- | tickishScoped tickish && not (tickishCounts tickish) -- = simplExprF env expr (TickIt tickish cont) -- For unscoped or soft-scoped ticks, we are allowed to float in new -- cost, so we simply push the continuation inside the tick. This -- has the effect of moving the tick to the outside of a case or -- application context, allowing the normal case and application -- optimisations to fire. | tickish `tickishScopesLike` SoftScope = do { (env', expr') <- simplExprF env expr cont ; return (env', mkTick tickish expr') } -- Push tick inside if the context looks like this will allow us to -- do a case-of-case - see Note [case-of-scc-of-case] | Select {} <- cont, Just expr' <- push_tick_inside = simplExprF env expr' cont -- We don't want to move the tick, but we might still want to allow -- floats to pass through with appropriate wrapping (or not, see -- wrap_floats below) --- | not (tickishCounts tickish) || tickishCanSplit tickish -- = wrap_floats | otherwise = no_floating_past_tick where -- Try to push tick inside a case, see Note [case-of-scc-of-case]. push_tick_inside = case expr0 of Case scrut bndr ty alts -> Just $ Case (tickScrut scrut) bndr ty (map tickAlt alts) _other -> Nothing where (ticks, expr0) = stripTicksTop movable (Tick tickish expr) movable t = not (tickishCounts t) || t `tickishScopesLike` NoScope || tickishCanSplit t tickScrut e = foldr mkTick e ticks -- Alternatives get annotated with all ticks that scope in some way, -- but we don't want to count entries. tickAlt (c,bs,e) = (c,bs, foldr mkTick e ts_scope) ts_scope = map mkNoCount $ filter (not . (`tickishScopesLike` NoScope)) ticks no_floating_past_tick = do { let (inc,outc) = splitCont cont ; (env', expr') <- simplExprF (zapFloats env) expr inc ; let tickish' = simplTickish env tickish ; (env'', expr'') <- rebuild (zapFloats env') (wrapFloats env' expr') (TickIt tickish' outc) ; return (addFloats env env'', expr'') } -- Alternative version that wraps outgoing floats with the tick. This -- results in ticks being duplicated, as we don't make any attempt to -- eliminate the tick if we re-inline the binding (because the tick -- semantics allows unrestricted inlining of HNFs), so I'm not doing -- this any more. FloatOut will catch any real opportunities for -- floating. -- -- wrap_floats = -- do { let (inc,outc) = splitCont cont -- ; (env', expr') <- simplExprF (zapFloats env) expr inc -- ; let tickish' = simplTickish env tickish -- ; let wrap_float (b,rhs) = (zapIdStrictness (setIdArity b 0), -- mkTick (mkNoCount tickish') rhs) -- -- when wrapping a float with mkTick, we better zap the Id's -- -- strictness info and arity, because it might be wrong now. -- ; let env'' = addFloats env (mapFloats env' wrap_float) -- ; rebuild env'' expr' (TickIt tickish' outc) -- } simplTickish env tickish | Breakpoint n ids <- tickish = Breakpoint n (map (getDoneId . substId env) ids) | otherwise = tickish -- Push type application and coercion inside a tick splitCont :: SimplCont -> (SimplCont, SimplCont) splitCont cont@(ApplyToTy { sc_cont = tail }) = (cont { sc_cont = inc }, outc) where (inc,outc) = splitCont tail splitCont (CastIt co c) = (CastIt co inc, outc) where (inc,outc) = splitCont c splitCont other = (mkBoringStop (contHoleType other), other) getDoneId (DoneId id) = id getDoneId (DoneEx e) = getIdFromTrivialExpr e -- Note [substTickish] in CoreSubst getDoneId other = pprPanic "getDoneId" (ppr other) -- Note [case-of-scc-of-case] -- It's pretty important to be able to transform case-of-case when -- there's an SCC in the way. For example, the following comes up -- in nofib/real/compress/Encode.hs: -- -- case scctick<code_string.r1> -- case $wcode_string_r13s wild_XC w1_s137 w2_s138 l_aje -- of _ { (# ww1_s13f, ww2_s13g, ww3_s13h #) -> -- (ww1_s13f, ww2_s13g, ww3_s13h) -- } -- of _ { (ww_s12Y, ww1_s12Z, ww2_s130) -> -- tick<code_string.f1> -- (ww_s12Y, -- ww1_s12Z, -- PTTrees.PT -- @ GHC.Types.Char @ GHC.Types.Int wild2_Xj ww2_s130 r_ajf) -- } -- -- We really want this case-of-case to fire, because then the 3-tuple -- will go away (indeed, the CPR optimisation is relying on this -- happening). But the scctick is in the way - we need to push it -- inside to expose the case-of-case. So we perform this -- transformation on the inner case: -- -- scctick c (case e of { p1 -> e1; ...; pn -> en }) -- ==> -- case (scctick c e) of { p1 -> scc c e1; ...; pn -> scc c en } -- -- So we've moved a constant amount of work out of the scc to expose -- the case. We only do this when the continuation is interesting: in -- for now, it has to be another Case (maybe generalise this later). {- ************************************************************************ * * \subsection{The main rebuilder} * * ************************************************************************ -} rebuild :: SimplEnv -> OutExpr -> SimplCont -> SimplM (SimplEnv, OutExpr) -- At this point the substitution in the SimplEnv should be irrelevant -- only the in-scope set and floats should matter rebuild env expr cont = case cont of Stop {} -> return (env, expr) TickIt t cont -> rebuild env (mkTick t expr) cont CastIt co cont -> rebuild env (mkCast expr co) cont -- NB: mkCast implements the (Coercion co |> g) optimisation Select { sc_bndr = bndr, sc_alts = alts, sc_env = se, sc_cont = cont } -> rebuildCase (se `setFloats` env) expr bndr alts cont StrictArg info _ cont -> rebuildCall env (info `addValArgTo` expr) cont StrictBind b bs body se cont -> do { env' <- simplNonRecX (se `setFloats` env) b expr -- expr satisfies let/app since it started life -- in a call to simplNonRecE ; simplLam env' bs body cont } ApplyToTy { sc_arg_ty = ty, sc_cont = cont} -> rebuild env (App expr (Type ty)) cont ApplyToVal { sc_arg = arg, sc_env = se, sc_dup = dup_flag, sc_cont = cont} -- See Note [Avoid redundant simplification] | isSimplified dup_flag -> rebuild env (App expr arg) cont | otherwise -> do { arg' <- simplExpr (se `setInScope` env) arg ; rebuild env (App expr arg') cont } {- ************************************************************************ * * \subsection{Lambdas} * * ************************************************************************ -} simplCast :: SimplEnv -> InExpr -> Coercion -> SimplCont -> SimplM (SimplEnv, OutExpr) simplCast env body co0 cont0 = do { co1 <- simplCoercion env co0 ; cont1 <- addCoerce co1 cont0 ; simplExprF env body cont1 } where addCoerce co cont = add_coerce co (coercionKind co) cont add_coerce _co (Pair s1 k1) cont -- co :: ty~ty | s1 `eqType` k1 = return cont -- is a no-op add_coerce co1 (Pair s1 _k2) (CastIt co2 cont) | (Pair _l1 t1) <- coercionKind co2 -- e |> (g1 :: S1~L) |> (g2 :: L~T1) -- ==> -- e, if S1=T1 -- e |> (g1 . g2 :: S1~T1) otherwise -- -- For example, in the initial form of a worker -- we may find (coerce T (coerce S (\x.e))) y -- and we'd like it to simplify to e[y/x] in one round -- of simplification , s1 `eqType` t1 = return cont -- The coerces cancel out | otherwise = return (CastIt (mkTransCo co1 co2) cont) add_coerce co (Pair s1s2 _t1t2) cont@(ApplyToTy { sc_arg_ty = arg_ty, sc_cont = tail }) -- (f |> g) ty ---> (f ty) |> (g @ ty) -- This implements the PushT rule from the paper | isForAllTy s1s2 = do { cont' <- addCoerce new_cast tail ; return (cont { sc_cont = cont' }) } where new_cast = mkInstCo co (mkNomReflCo arg_ty) add_coerce co (Pair s1s2 t1t2) (ApplyToVal { sc_arg = arg, sc_env = arg_se , sc_dup = dup, sc_cont = cont }) | isFunTy s1s2 -- This implements the Push rule from the paper , isFunTy t1t2 -- Check t1t2 to ensure 'arg' is a value arg -- (e |> (g :: s1s2 ~ t1->t2)) f -- ===> -- (e (f |> (arg g :: t1~s1)) -- |> (res g :: s2->t2) -- -- t1t2 must be a function type, t1->t2, because it's applied -- to something but s1s2 might conceivably not be -- -- When we build the ApplyTo we can't mix the out-types -- with the InExpr in the argument, so we simply substitute -- to make it all consistent. It's a bit messy. -- But it isn't a common case. -- -- Example of use: Trac #995 = do { (dup', arg_se', arg') <- simplArg env dup arg_se arg ; cont' <- addCoerce co2 cont ; return (ApplyToVal { sc_arg = mkCast arg' (mkSymCo co1) , sc_env = arg_se' , sc_dup = dup' , sc_cont = cont' }) } where -- we split coercion t1->t2 ~ s1->s2 into t1 ~ s1 and -- t2 ~ s2 with left and right on the curried form: -- (->) t1 t2 ~ (->) s1 s2 [co1, co2] = decomposeCo 2 co add_coerce co _ cont = return (CastIt co cont) simplArg :: SimplEnv -> DupFlag -> StaticEnv -> CoreExpr -> SimplM (DupFlag, StaticEnv, OutExpr) simplArg env dup_flag arg_env arg | isSimplified dup_flag = return (dup_flag, arg_env, arg) | otherwise = do { arg' <- simplExpr (arg_env `setInScope` env) arg ; return (Simplified, zapSubstEnv arg_env, arg') } {- ************************************************************************ * * \subsection{Lambdas} * * ************************************************************************ Note [Zap unfolding when beta-reducing] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Lambda-bound variables can have stable unfoldings, such as $j = \x. \b{Unf=Just x}. e See Note [Case binders and join points] below; the unfolding for lets us optimise e better. However when we beta-reduce it we want to revert to using the actual value, otherwise we can end up in the stupid situation of let x = blah in let b{Unf=Just x} = y in ...b... Here it'd be far better to drop the unfolding and use the actual RHS. -} simplLam :: SimplEnv -> [InId] -> InExpr -> SimplCont -> SimplM (SimplEnv, OutExpr) simplLam env [] body cont = simplExprF env body cont -- Beta reduction simplLam env (bndr:bndrs) body (ApplyToTy { sc_arg_ty = arg_ty, sc_cont = cont }) = do { tick (BetaReduction bndr) ; simplLam (extendTvSubst env bndr arg_ty) bndrs body cont } simplLam env (bndr:bndrs) body (ApplyToVal { sc_arg = arg, sc_env = arg_se , sc_cont = cont }) = do { tick (BetaReduction bndr) ; simplNonRecE env' (zap_unfolding bndr) (arg, arg_se) (bndrs, body) cont } where env' | Coercion co <- arg = extendCvSubst env bndr co | otherwise = env zap_unfolding bndr -- See Note [Zap unfolding when beta-reducing] | isId bndr, isStableUnfolding (realIdUnfolding bndr) = setIdUnfolding bndr NoUnfolding | otherwise = bndr -- discard a non-counting tick on a lambda. This may change the -- cost attribution slightly (moving the allocation of the -- lambda elsewhere), but we don't care: optimisation changes -- cost attribution all the time. simplLam env bndrs body (TickIt tickish cont) | not (tickishCounts tickish) = simplLam env bndrs body cont -- Not enough args, so there are real lambdas left to put in the result simplLam env bndrs body cont = do { (env', bndrs') <- simplLamBndrs env bndrs ; body' <- simplExpr env' body ; new_lam <- mkLam bndrs' body' cont ; rebuild env' new_lam cont } simplLamBndrs :: SimplEnv -> [InBndr] -> SimplM (SimplEnv, [OutBndr]) simplLamBndrs env bndrs = mapAccumLM simplLamBndr env bndrs ------------- simplLamBndr :: SimplEnv -> Var -> SimplM (SimplEnv, Var) -- Used for lambda binders. These sometimes have unfoldings added by -- the worker/wrapper pass that must be preserved, because they can't -- be reconstructed from context. For example: -- f x = case x of (a,b) -> fw a b x -- fw a b x{=(a,b)} = ... -- The "{=(a,b)}" is an unfolding we can't reconstruct otherwise. simplLamBndr env bndr | isId bndr && hasSomeUnfolding old_unf -- Special case = do { (env1, bndr1) <- simplBinder env bndr ; unf' <- simplUnfolding env1 NotTopLevel bndr old_unf ; let bndr2 = bndr1 `setIdUnfolding` unf' ; return (modifyInScope env1 bndr2, bndr2) } | otherwise = simplBinder env bndr -- Normal case where old_unf = idUnfolding bndr ------------------ simplNonRecE :: SimplEnv -> InBndr -- The binder -> (InExpr, SimplEnv) -- Rhs of binding (or arg of lambda) -> ([InBndr], InExpr) -- Body of the let/lambda -- \xs.e -> SimplCont -> SimplM (SimplEnv, OutExpr) -- simplNonRecE is used for -- * non-top-level non-recursive lets in expressions -- * beta reduction -- -- It deals with strict bindings, via the StrictBind continuation, -- which may abort the whole process -- -- Precondition: rhs satisfies the let/app invariant -- Note [CoreSyn let/app invariant] in CoreSyn -- -- The "body" of the binding comes as a pair of ([InId],InExpr) -- representing a lambda; so we recurse back to simplLam -- Why? Because of the binder-occ-info-zapping done before -- the call to simplLam in simplExprF (Lam ...) -- First deal with type applications and type lets -- (/\a. e) (Type ty) and (let a = Type ty in e) simplNonRecE env bndr (Type ty_arg, rhs_se) (bndrs, body) cont = ASSERT( isTyVar bndr ) do { ty_arg' <- simplType (rhs_se `setInScope` env) ty_arg ; simplLam (extendTvSubst env bndr ty_arg') bndrs body cont } simplNonRecE env bndr (rhs, rhs_se) (bndrs, body) cont = do dflags <- getDynFlags case () of _ | preInlineUnconditionally dflags env NotTopLevel bndr rhs -> do { tick (PreInlineUnconditionally bndr) ; -- pprTrace "preInlineUncond" (ppr bndr <+> ppr rhs) $ simplLam (extendIdSubst env bndr (mkContEx rhs_se rhs)) bndrs body cont } | isStrictId bndr -- Includes coercions -> simplExprF (rhs_se `setFloats` env) rhs (StrictBind bndr bndrs body env cont) | otherwise -> ASSERT( not (isTyVar bndr) ) do { (env1, bndr1) <- simplNonRecBndr env bndr ; (env2, bndr2) <- addBndrRules env1 bndr bndr1 ; env3 <- simplLazyBind env2 NotTopLevel NonRecursive bndr bndr2 rhs rhs_se ; simplLam env3 bndrs body cont } {- ************************************************************************ * * Variables * * ************************************************************************ -} simplVar :: SimplEnv -> InVar -> SimplM OutExpr -- Look up an InVar in the environment simplVar env var | isTyVar var = return (Type (substTyVar env var)) | isCoVar var = return (Coercion (substCoVar env var)) | otherwise = case substId env var of DoneId var1 -> return (Var var1) DoneEx e -> return e ContEx tvs cvs ids e -> simplExpr (setSubstEnv env tvs cvs ids) e simplIdF :: SimplEnv -> InId -> SimplCont -> SimplM (SimplEnv, OutExpr) simplIdF env var cont = case substId env var of DoneEx e -> simplExprF (zapSubstEnv env) e cont ContEx tvs cvs ids e -> simplExprF (setSubstEnv env tvs cvs ids) e cont DoneId var1 -> completeCall env var1 cont -- Note [zapSubstEnv] -- The template is already simplified, so don't re-substitute. -- This is VITAL. Consider -- let x = e in -- let y = \z -> ...x... in -- \ x -> ...y... -- We'll clone the inner \x, adding x->x' in the id_subst -- Then when we inline y, we must *not* replace x by x' in -- the inlined copy!! --------------------------------------------------------- -- Dealing with a call site completeCall :: SimplEnv -> OutId -> SimplCont -> SimplM (SimplEnv, OutExpr) completeCall env var cont = do { ------------- Try inlining ---------------- dflags <- getDynFlags ; let (lone_variable, arg_infos, call_cont) = contArgs cont n_val_args = length arg_infos interesting_cont = interestingCallContext call_cont unfolding = activeUnfolding env var maybe_inline = callSiteInline dflags var unfolding lone_variable arg_infos interesting_cont ; case maybe_inline of { Just expr -- There is an inlining! -> do { checkedTick (UnfoldingDone var) ; dump_inline dflags expr cont ; simplExprF (zapSubstEnv env) expr cont } ; Nothing -> do -- No inlining! { rule_base <- getSimplRules ; let info = mkArgInfo var (getRules rule_base var) n_val_args call_cont ; rebuildCall env info cont }}} where dump_inline dflags unfolding cont | not (dopt Opt_D_dump_inlinings dflags) = return () | not (dopt Opt_D_verbose_core2core dflags) = when (isExternalName (idName var)) $ liftIO $ printOutputForUser dflags alwaysQualify $ sep [text "Inlining done:", nest 4 (ppr var)] | otherwise = liftIO $ printOutputForUser dflags alwaysQualify $ sep [text "Inlining done: " <> ppr var, nest 4 (vcat [text "Inlined fn: " <+> nest 2 (ppr unfolding), text "Cont: " <+> ppr cont])] rebuildCall :: SimplEnv -> ArgInfo -> SimplCont -> SimplM (SimplEnv, OutExpr) rebuildCall env (ArgInfo { ai_fun = fun, ai_args = rev_args, ai_strs = [] }) cont -- When we run out of strictness args, it means -- that the call is definitely bottom; see SimplUtils.mkArgInfo -- Then we want to discard the entire strict continuation. E.g. -- * case (error "hello") of { ... } -- * (error "Hello") arg -- * f (error "Hello") where f is strict -- etc -- Then, especially in the first of these cases, we'd like to discard -- the continuation, leaving just the bottoming expression. But the -- type might not be right, so we may have to add a coerce. | not (contIsTrivial cont) -- Only do this if there is a non-trivial = return (env, castBottomExpr res cont_ty) -- contination to discard, else we do it where -- again and again! res = argInfoExpr fun rev_args cont_ty = contResultType cont rebuildCall env info (CastIt co cont) = rebuildCall env (addCastTo info co) cont rebuildCall env info (ApplyToTy { sc_arg_ty = arg_ty, sc_cont = cont }) = rebuildCall env (info `addTyArgTo` arg_ty) cont rebuildCall env info@(ArgInfo { ai_encl = encl_rules, ai_type = fun_ty , ai_strs = str:strs, ai_discs = disc:discs }) (ApplyToVal { sc_arg = arg, sc_env = arg_se , sc_dup = dup_flag, sc_cont = cont }) | isSimplified dup_flag -- See Note [Avoid redundant simplification] = rebuildCall env (addValArgTo info' arg) cont | str -- Strict argument = -- pprTrace "Strict Arg" (ppr arg $$ ppr (seIdSubst env) $$ ppr (seInScope env)) $ simplExprF (arg_se `setFloats` env) arg (StrictArg info' cci cont) -- Note [Shadowing] | otherwise -- Lazy argument -- DO NOT float anything outside, hence simplExprC -- There is no benefit (unlike in a let-binding), and we'd -- have to be very careful about bogus strictness through -- floating a demanded let. = do { arg' <- simplExprC (arg_se `setInScope` env) arg (mkLazyArgStop (funArgTy fun_ty) cci) ; rebuildCall env (addValArgTo info' arg') cont } where info' = info { ai_strs = strs, ai_discs = discs } cci | encl_rules = RuleArgCtxt | disc > 0 = DiscArgCtxt -- Be keener here | otherwise = BoringCtxt -- Nothing interesting rebuildCall env (ArgInfo { ai_fun = fun, ai_args = rev_args, ai_rules = rules }) cont | null rules = rebuild env (argInfoExpr fun rev_args) cont -- No rules, common case | otherwise = do { -- We've accumulated a simplified call in <fun,rev_args> -- so try rewrite rules; see Note [RULEs apply to simplified arguments] -- See also Note [Rules for recursive functions] ; let env' = zapSubstEnv env -- See Note [zapSubstEnv]; -- and NB that 'rev_args' are all fully simplified ; mb_rule <- tryRules env' rules fun (reverse rev_args) cont ; case mb_rule of { Just (rule_rhs, cont') -> simplExprF env' rule_rhs cont' -- Rules don't match ; Nothing -> rebuild env (argInfoExpr fun rev_args) cont -- No rules } } {- Note [RULES apply to simplified arguments] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ It's very desirable to try RULES once the arguments have been simplified, because doing so ensures that rule cascades work in one pass. Consider {-# RULES g (h x) = k x f (k x) = x #-} ...f (g (h x))... Then we want to rewrite (g (h x)) to (k x) and only then try f's rules. If we match f's rules against the un-simplified RHS, it won't match. This makes a particularly big difference when superclass selectors are involved: op ($p1 ($p2 (df d))) We want all this to unravel in one sweeep. Note [Avoid redundant simplification] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Because RULES apply to simplified arguments, there's a danger of repeatedly simplifying already-simplified arguments. An important example is that of (>>=) d e1 e2 Here e1, e2 are simplified before the rule is applied, but don't really participate in the rule firing. So we mark them as Simplified to avoid re-simplifying them. Note [Shadowing] ~~~~~~~~~~~~~~~~ This part of the simplifier may break the no-shadowing invariant Consider f (...(\a -> e)...) (case y of (a,b) -> e') where f is strict in its second arg If we simplify the innermost one first we get (...(\a -> e)...) Simplifying the second arg makes us float the case out, so we end up with case y of (a,b) -> f (...(\a -> e)...) e' So the output does not have the no-shadowing invariant. However, there is no danger of getting name-capture, because when the first arg was simplified we used an in-scope set that at least mentioned all the variables free in its static environment, and that is enough. We can't just do innermost first, or we'd end up with a dual problem: case x of (a,b) -> f e (...(\a -> e')...) I spent hours trying to recover the no-shadowing invariant, but I just could not think of an elegant way to do it. The simplifier is already knee-deep in continuations. We have to keep the right in-scope set around; AND we have to get the effect that finding (error "foo") in a strict arg position will discard the entire application and replace it with (error "foo"). Getting all this at once is TOO HARD! ************************************************************************ * * Rewrite rules * * ************************************************************************ -} tryRules :: SimplEnv -> [CoreRule] -> Id -> [ArgSpec] -> SimplCont -> SimplM (Maybe (CoreExpr, SimplCont)) -- The SimplEnv already has zapSubstEnv applied to it tryRules env rules fn args call_cont | null rules = return Nothing {- Disabled until we fix #8326 | fn `hasKey` tagToEnumKey -- See Note [Optimising tagToEnum#] , [_type_arg, val_arg] <- args , Select dup bndr ((_,[],rhs1) : rest_alts) se cont <- call_cont , isDeadBinder bndr = do { dflags <- getDynFlags ; let enum_to_tag :: CoreAlt -> CoreAlt -- Takes K -> e into tagK# -> e -- where tagK# is the tag of constructor K enum_to_tag (DataAlt con, [], rhs) = ASSERT( isEnumerationTyCon (dataConTyCon con) ) (LitAlt tag, [], rhs) where tag = mkMachInt dflags (toInteger (dataConTag con - fIRST_TAG)) enum_to_tag alt = pprPanic "tryRules: tagToEnum" (ppr alt) new_alts = (DEFAULT, [], rhs1) : map enum_to_tag rest_alts new_bndr = setIdType bndr intPrimTy -- The binder is dead, but should have the right type ; return (Just (val_arg, Select dup new_bndr new_alts se cont)) } -} | otherwise = do { dflags <- getDynFlags ; case lookupRule dflags (getUnfoldingInRuleMatch env) (activeRule env) fn (argInfoAppArgs args) rules of { Nothing -> do { nodump dflags -- This ensures that an empty file is written ; return Nothing } ; -- No rule matches Just (rule, rule_rhs) -> do { checkedTick (RuleFired (ru_name rule)) ; let cont' = pushSimplifiedArgs env (drop (ruleArity rule) args) call_cont -- (ruleArity rule) says how many args the rule consumed ; dump dflags rule rule_rhs ; return (Just (rule_rhs, cont')) }}} where dump dflags rule rule_rhs | dopt Opt_D_dump_rule_rewrites dflags = log_rule dflags Opt_D_dump_rule_rewrites "Rule fired" $ vcat [ text "Rule:" <+> ftext (ru_name rule) , text "Before:" <+> hang (ppr fn) 2 (sep (map ppr args)) , text "After: " <+> pprCoreExpr rule_rhs , text "Cont: " <+> ppr call_cont ] | dopt Opt_D_dump_rule_firings dflags = log_rule dflags Opt_D_dump_rule_firings "Rule fired:" $ ftext (ru_name rule) | otherwise = return () nodump dflags | dopt Opt_D_dump_rule_rewrites dflags = liftIO $ dumpSDoc dflags alwaysQualify Opt_D_dump_rule_rewrites "" empty | dopt Opt_D_dump_rule_firings dflags = liftIO $ dumpSDoc dflags alwaysQualify Opt_D_dump_rule_firings "" empty | otherwise = return () log_rule dflags flag hdr details = liftIO . dumpSDoc dflags alwaysQualify flag "" $ sep [text hdr, nest 4 details] {- Note [Optimising tagToEnum#] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~ If we have an enumeration data type: data Foo = A | B | C Then we want to transform case tagToEnum# x of ==> case x of A -> e1 DEFAULT -> e1 B -> e2 1# -> e2 C -> e3 2# -> e3 thereby getting rid of the tagToEnum# altogether. If there was a DEFAULT alternative we retain it (remember it comes first). If not the case must be exhaustive, and we reflect that in the transformed version by adding a DEFAULT. Otherwise Lint complains that the new case is not exhaustive. See #8317. Note [Rules for recursive functions] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ You might think that we shouldn't apply rules for a loop breaker: doing so might give rise to an infinite loop, because a RULE is rather like an extra equation for the function: RULE: f (g x) y = x+y Eqn: f a y = a-y But it's too drastic to disable rules for loop breakers. Even the foldr/build rule would be disabled, because foldr is recursive, and hence a loop breaker: foldr k z (build g) = g k z So it's up to the programmer: rules can cause divergence ************************************************************************ * * Rebuilding a case expression * * ************************************************************************ Note [Case elimination] ~~~~~~~~~~~~~~~~~~~~~~~ The case-elimination transformation discards redundant case expressions. Start with a simple situation: case x# of ===> let y# = x# in e y# -> e (when x#, y# are of primitive type, of course). We can't (in general) do this for algebraic cases, because we might turn bottom into non-bottom! The code in SimplUtils.prepareAlts has the effect of generalise this idea to look for a case where we're scrutinising a variable, and we know that only the default case can match. For example: case x of 0# -> ... DEFAULT -> ...(case x of 0# -> ... DEFAULT -> ...) ... Here the inner case is first trimmed to have only one alternative, the DEFAULT, after which it's an instance of the previous case. This really only shows up in eliminating error-checking code. Note that SimplUtils.mkCase combines identical RHSs. So case e of ===> case e of DEFAULT -> r True -> r False -> r Now again the case may be elminated by the CaseElim transformation. This includes things like (==# a# b#)::Bool so that we simplify case ==# a# b# of { True -> x; False -> x } to just x This particular example shows up in default methods for comparison operations (e.g. in (>=) for Int.Int32) Note [Case elimination: lifted case] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ If a case over a lifted type has a single alternative, and is being used as a strict 'let' (all isDeadBinder bndrs), we may want to do this transformation: case e of r ===> let r = e in ...r... _ -> ...r... (a) 'e' is already evaluated (it may so if e is a variable) Specifically we check (exprIsHNF e). In this case we can just allocate the WHNF directly with a let. or (b) 'x' is not used at all and e is ok-for-speculation The ok-for-spec bit checks that we don't lose any exceptions or divergence. NB: it'd be *sound* to switch from case to let if the scrutinee was not yet WHNF but was guaranteed to converge; but sticking with case means we won't build a thunk or (c) 'x' is used strictly in the body, and 'e' is a variable Then we can just substitute 'e' for 'x' in the body. See Note [Eliminating redundant seqs] For (b), the "not used at all" test is important. Consider case (case a ># b of { True -> (p,q); False -> (q,p) }) of r -> blah The scrutinee is ok-for-speculation (it looks inside cases), but we do not want to transform to let r = case a ># b of { True -> (p,q); False -> (q,p) } in blah because that builds an unnecessary thunk. Note [Eliminating redundant seqs] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ If we have this: case x of r { _ -> ..r.. } where 'r' is used strictly in (..r..), the case is effectively a 'seq' on 'x', but since 'r' is used strictly anyway, we can safely transform to (...x...) Note that this can change the error behaviour. For example, we might transform case x of { _ -> error "bad" } --> error "bad" which is might be puzzling if 'x' currently lambda-bound, but later gets let-bound to (error "good"). Nevertheless, the paper "A semantics for imprecise exceptions" allows this transformation. If you want to fix the evaluation order, use 'pseq'. See Trac #8900 for an example where the loss of this transformation bit us in practice. See also Note [Empty case alternatives] in CoreSyn. Just for reference, the original code (added Jan 13) looked like this: || case_bndr_evald_next rhs case_bndr_evald_next :: CoreExpr -> Bool -- See Note [Case binder next] case_bndr_evald_next (Var v) = v == case_bndr case_bndr_evald_next (Cast e _) = case_bndr_evald_next e case_bndr_evald_next (App e _) = case_bndr_evald_next e case_bndr_evald_next (Case e _ _ _) = case_bndr_evald_next e case_bndr_evald_next _ = False (This came up when fixing Trac #7542. See also Note [Eta reduction of an eval'd function] in CoreUtils.) Note [Case elimination: unlifted case] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Consider case a +# b of r -> ...r... Then we do case-elimination (to make a let) followed by inlining, to get .....(a +# b).... If we have case indexArray# a i of r -> ...r... we might like to do the same, and inline the (indexArray# a i). But indexArray# is not okForSpeculation, so we don't build a let in rebuildCase (lest it get floated *out*), so the inlining doesn't happen either. This really isn't a big deal I think. The let can be Further notes about case elimination ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Consider: test :: Integer -> IO () test = print Turns out that this compiles to: Print.test = \ eta :: Integer eta1 :: Void# -> case PrelNum.< eta PrelNum.zeroInteger of wild { __DEFAULT -> case hPutStr stdout (PrelNum.jtos eta ($w[] @ Char)) eta1 of wild1 { (# new_s, a4 #) -> PrelIO.lvl23 new_s }} Notice the strange '<' which has no effect at all. This is a funny one. It started like this: f x y = if x < 0 then jtos x else if y==0 then "" else jtos x At a particular call site we have (f v 1). So we inline to get if v < 0 then jtos x else if 1==0 then "" else jtos x Now simplify the 1==0 conditional: if v<0 then jtos v else jtos v Now common-up the two branches of the case: case (v<0) of DEFAULT -> jtos v Why don't we drop the case? Because it's strict in v. It's technically wrong to drop even unnecessary evaluations, and in practice they may be a result of 'seq' so we *definitely* don't want to drop those. I don't really know how to improve this situation. -} --------------------------------------------------------- -- Eliminate the case if possible rebuildCase, reallyRebuildCase :: SimplEnv -> OutExpr -- Scrutinee -> InId -- Case binder -> [InAlt] -- Alternatives (inceasing order) -> SimplCont -> SimplM (SimplEnv, OutExpr) -------------------------------------------------- -- 1. Eliminate the case if there's a known constructor -------------------------------------------------- rebuildCase env scrut case_bndr alts cont | Lit lit <- scrut -- No need for same treatment as constructors -- because literals are inlined more vigorously , not (litIsLifted lit) = do { tick (KnownBranch case_bndr) ; case findAlt (LitAlt lit) alts of Nothing -> missingAlt env case_bndr alts cont Just (_, bs, rhs) -> simple_rhs bs rhs } | Just (con, ty_args, other_args) <- exprIsConApp_maybe (getUnfoldingInRuleMatch env) scrut -- Works when the scrutinee is a variable with a known unfolding -- as well as when it's an explicit constructor application = do { tick (KnownBranch case_bndr) ; case findAlt (DataAlt con) alts of Nothing -> missingAlt env case_bndr alts cont Just (DEFAULT, bs, rhs) -> simple_rhs bs rhs Just (_, bs, rhs) -> knownCon env scrut con ty_args other_args case_bndr bs rhs cont } where simple_rhs bs rhs = ASSERT( null bs ) do { env' <- simplNonRecX env case_bndr scrut -- scrut is a constructor application, -- hence satisfies let/app invariant ; simplExprF env' rhs cont } -------------------------------------------------- -- 2. Eliminate the case if scrutinee is evaluated -------------------------------------------------- rebuildCase env scrut case_bndr alts@[(_, bndrs, rhs)] cont -- See if we can get rid of the case altogether -- See Note [Case elimination] -- mkCase made sure that if all the alternatives are equal, -- then there is now only one (DEFAULT) rhs -- 2a. Dropping the case altogether, if -- a) it binds nothing (so it's really just a 'seq') -- b) evaluating the scrutinee has no side effects | is_plain_seq , exprOkForSideEffects scrut -- The entire case is dead, so we can drop it -- if the scrutinee converges without having imperative -- side effects or raising a Haskell exception -- See Note [PrimOp can_fail and has_side_effects] in PrimOp = simplExprF env rhs cont -- 2b. Turn the case into a let, if -- a) it binds only the case-binder -- b) unlifted case: the scrutinee is ok-for-speculation -- lifted case: the scrutinee is in HNF (or will later be demanded) | all_dead_bndrs , if is_unlifted then exprOkForSpeculation scrut -- See Note [Case elimination: unlifted case] else exprIsHNF scrut -- See Note [Case elimination: lifted case] || scrut_is_demanded_var scrut = do { tick (CaseElim case_bndr) ; env' <- simplNonRecX env case_bndr scrut ; simplExprF env' rhs cont } -- 2c. Try the seq rules if -- a) it binds only the case binder -- b) a rule for seq applies -- See Note [User-defined RULES for seq] in MkId | is_plain_seq = do { let scrut_ty = exprType scrut rhs_ty = substTy env (exprType rhs) out_args = [ TyArg { as_arg_ty = scrut_ty , as_hole_ty = seq_id_ty } , TyArg { as_arg_ty = rhs_ty , as_hole_ty = piResultTy seq_id_ty scrut_ty } , ValArg scrut] rule_cont = ApplyToVal { sc_dup = NoDup, sc_arg = rhs , sc_env = env, sc_cont = cont } env' = zapSubstEnv env -- Lazily evaluated, so we don't do most of this ; rule_base <- getSimplRules ; mb_rule <- tryRules env' (getRules rule_base seqId) seqId out_args rule_cont ; case mb_rule of Just (rule_rhs, cont') -> simplExprF env' rule_rhs cont' Nothing -> reallyRebuildCase env scrut case_bndr alts cont } where is_unlifted = isUnliftedType (idType case_bndr) all_dead_bndrs = all isDeadBinder bndrs -- bndrs are [InId] is_plain_seq = all_dead_bndrs && isDeadBinder case_bndr -- Evaluation *only* for effect seq_id_ty = idType seqId scrut_is_demanded_var :: CoreExpr -> Bool -- See Note [Eliminating redundant seqs] scrut_is_demanded_var (Cast s _) = scrut_is_demanded_var s scrut_is_demanded_var (Var _) = isStrictDmd (idDemandInfo case_bndr) scrut_is_demanded_var _ = False rebuildCase env scrut case_bndr alts cont = reallyRebuildCase env scrut case_bndr alts cont -------------------------------------------------- -- 3. Catch-all case -------------------------------------------------- reallyRebuildCase env scrut case_bndr alts cont = do { -- Prepare the continuation; -- The new subst_env is in place (env', dup_cont, nodup_cont) <- prepareCaseCont env alts cont -- Simplify the alternatives ; (scrut', case_bndr', alts') <- simplAlts env' scrut case_bndr alts dup_cont ; dflags <- getDynFlags ; let alts_ty' = contResultType dup_cont ; case_expr <- mkCase dflags scrut' case_bndr' alts_ty' alts' -- Notice that rebuild gets the in-scope set from env', not alt_env -- (which in any case is only build in simplAlts) -- The case binder *not* scope over the whole returned case-expression ; rebuild env' case_expr nodup_cont } {- simplCaseBinder checks whether the scrutinee is a variable, v. If so, try to eliminate uses of v in the RHSs in favour of case_bndr; that way, there's a chance that v will now only be used once, and hence inlined. Historical note: we use to do the "case binder swap" in the Simplifier so there were additional complications if the scrutinee was a variable. Now the binder-swap stuff is done in the occurrence analyer; see OccurAnal Note [Binder swap]. Note [knownCon occ info] ~~~~~~~~~~~~~~~~~~~~~~~~ If the case binder is not dead, then neither are the pattern bound variables: case <any> of x { (a,b) -> case x of { (p,q) -> p } } Here (a,b) both look dead, but come alive after the inner case is eliminated. The point is that we bring into the envt a binding let x = (a,b) after the outer case, and that makes (a,b) alive. At least we do unless the case binder is guaranteed dead. Note [Case alternative occ info] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ When we are simply reconstructing a case (the common case), we always zap the occurrence info on the binders in the alternatives. Even if the case binder is dead, the scrutinee is usually a variable, and *that* can bring the case-alternative binders back to life. See Note [Add unfolding for scrutinee] Note [Improving seq] ~~~~~~~~~~~~~~~~~~~ Consider type family F :: * -> * type instance F Int = Int ... case e of x { DEFAULT -> rhs } ... where x::F Int. Then we'd like to rewrite (F Int) to Int, getting case e `cast` co of x'::Int I# x# -> let x = x' `cast` sym co in rhs so that 'rhs' can take advantage of the form of x'. Notice that Note [Case of cast] (in OccurAnal) may then apply to the result. Nota Bene: We only do the [Improving seq] transformation if the case binder 'x' is actually used in the rhs; that is, if the case is *not* a *pure* seq. a) There is no point in adding the cast to a pure seq. b) There is a good reason not to: doing so would interfere with seq rules (Note [Built-in RULES for seq] in MkId). In particular, this [Improving seq] thing *adds* a cast while [Built-in RULES for seq] *removes* one, so they just flip-flop. You might worry about case v of x { __DEFAULT -> ... case (v `cast` co) of y { I# -> ... }} This is a pure seq (since x is unused), so [Improving seq] won't happen. But it's ok: the simplifier will replace 'v' by 'x' in the rhs to get case v of x { __DEFAULT -> ... case (x `cast` co) of y { I# -> ... }} Now the outer case is not a pure seq, so [Improving seq] will happen, and then the inner case will disappear. The need for [Improving seq] showed up in Roman's experiments. Example: foo :: F Int -> Int -> Int foo t n = t `seq` bar n where bar 0 = 0 bar n = bar (n - case t of TI i -> i) Here we'd like to avoid repeated evaluating t inside the loop, by taking advantage of the `seq`. At one point I did transformation in LiberateCase, but it's more robust here. (Otherwise, there's a danger that we'll simply drop the 'seq' altogether, before LiberateCase gets to see it.) -} simplAlts :: SimplEnv -> OutExpr -> InId -- Case binder -> [InAlt] -- Non-empty -> SimplCont -> SimplM (OutExpr, OutId, [OutAlt]) -- Includes the continuation -- Like simplExpr, this just returns the simplified alternatives; -- it does not return an environment -- The returned alternatives can be empty, none are possible simplAlts env scrut case_bndr alts cont' = do { let env0 = zapFloats env ; (env1, case_bndr1) <- simplBinder env0 case_bndr ; fam_envs <- getFamEnvs ; (alt_env', scrut', case_bndr') <- improveSeq fam_envs env1 scrut case_bndr case_bndr1 alts ; (imposs_deflt_cons, in_alts) <- prepareAlts scrut' case_bndr' alts -- NB: it's possible that the returned in_alts is empty: this is handled -- by the caller (rebuildCase) in the missingAlt function ; alts' <- mapM (simplAlt alt_env' (Just scrut') imposs_deflt_cons case_bndr' cont') in_alts ; -- pprTrace "simplAlts" (ppr case_bndr $$ ppr alts_ty $$ ppr alts_ty' $$ ppr alts $$ ppr cont') $ return (scrut', case_bndr', alts') } ------------------------------------ improveSeq :: (FamInstEnv, FamInstEnv) -> SimplEnv -> OutExpr -> InId -> OutId -> [InAlt] -> SimplM (SimplEnv, OutExpr, OutId) -- Note [Improving seq] improveSeq fam_envs env scrut case_bndr case_bndr1 [(DEFAULT,_,_)] | not (isDeadBinder case_bndr) -- Not a pure seq! See Note [Improving seq] , Just (co, ty2) <- topNormaliseType_maybe fam_envs (idType case_bndr1) = do { case_bndr2 <- newId (fsLit "nt") ty2 ; let rhs = DoneEx (Var case_bndr2 `Cast` mkSymCo co) env2 = extendIdSubst env case_bndr rhs ; return (env2, scrut `Cast` co, case_bndr2) } improveSeq _ env scrut _ case_bndr1 _ = return (env, scrut, case_bndr1) ------------------------------------ simplAlt :: SimplEnv -> Maybe OutExpr -- The scrutinee -> [AltCon] -- These constructors can't be present when -- matching the DEFAULT alternative -> OutId -- The case binder -> SimplCont -> InAlt -> SimplM OutAlt simplAlt env _ imposs_deflt_cons case_bndr' cont' (DEFAULT, bndrs, rhs) = ASSERT( null bndrs ) do { let env' = addBinderUnfolding env case_bndr' (mkOtherCon imposs_deflt_cons) -- Record the constructors that the case-binder *can't* be. ; rhs' <- simplExprC env' rhs cont' ; return (DEFAULT, [], rhs') } simplAlt env scrut' _ case_bndr' cont' (LitAlt lit, bndrs, rhs) = ASSERT( null bndrs ) do { env' <- addAltUnfoldings env scrut' case_bndr' (Lit lit) ; rhs' <- simplExprC env' rhs cont' ; return (LitAlt lit, [], rhs') } simplAlt env scrut' _ case_bndr' cont' (DataAlt con, vs, rhs) = do { -- Deal with the pattern-bound variables -- Mark the ones that are in ! positions in the -- data constructor as certainly-evaluated. -- NB: simplLamBinders preserves this eval info ; let vs_with_evals = add_evals (dataConRepStrictness con) ; (env', vs') <- simplLamBndrs env vs_with_evals -- Bind the case-binder to (con args) ; let inst_tys' = tyConAppArgs (idType case_bndr') con_app :: OutExpr con_app = mkConApp2 con inst_tys' vs' ; env'' <- addAltUnfoldings env' scrut' case_bndr' con_app ; rhs' <- simplExprC env'' rhs cont' ; return (DataAlt con, vs', rhs') } where -- add_evals records the evaluated-ness of the bound variables of -- a case pattern. This is *important*. Consider -- data T = T !Int !Int -- -- case x of { T a b -> T (a+1) b } -- -- We really must record that b is already evaluated so that we don't -- go and re-evaluate it when constructing the result. -- See Note [Data-con worker strictness] in MkId.hs add_evals the_strs = go vs the_strs where go [] [] = [] go (v:vs') strs | isTyVar v = v : go vs' strs go (v:vs') (str:strs) | isMarkedStrict str = eval v : go vs' strs | otherwise = zap v : go vs' strs go _ _ = pprPanic "cat_evals" (ppr con $$ ppr vs $$ ppr_with_length the_strs $$ ppr_with_length (dataConRepArgTys con) $$ ppr_with_length (dataConRepStrictness con)) where ppr_with_length list = ppr list <+> parens (text "length =" <+> ppr (length list)) -- NB: If this panic triggers, note that -- NoStrictnessMark doesn't print! zap v = zapIdOccInfo v -- See Note [Case alternative occ info] eval v = zap v `setIdUnfolding` evaldUnfolding addAltUnfoldings :: SimplEnv -> Maybe OutExpr -> OutId -> OutExpr -> SimplM SimplEnv addAltUnfoldings env scrut case_bndr con_app = do { dflags <- getDynFlags ; let con_app_unf = mkSimpleUnfolding dflags con_app env1 = addBinderUnfolding env case_bndr con_app_unf -- See Note [Add unfolding for scrutinee] env2 = case scrut of Just (Var v) -> addBinderUnfolding env1 v con_app_unf Just (Cast (Var v) co) -> addBinderUnfolding env1 v $ mkSimpleUnfolding dflags (Cast con_app (mkSymCo co)) _ -> env1 ; traceSmpl "addAltUnf" (vcat [ppr case_bndr <+> ppr scrut, ppr con_app]) ; return env2 } addBinderUnfolding :: SimplEnv -> Id -> Unfolding -> SimplEnv addBinderUnfolding env bndr unf | debugIsOn, Just tmpl <- maybeUnfoldingTemplate unf = WARN( not (eqType (idType bndr) (exprType tmpl)), ppr bndr $$ ppr (idType bndr) $$ ppr tmpl $$ ppr (exprType tmpl) ) modifyInScope env (bndr `setIdUnfolding` unf) | otherwise = modifyInScope env (bndr `setIdUnfolding` unf) zapBndrOccInfo :: Bool -> Id -> Id -- Consider case e of b { (a,b) -> ... } -- Then if we bind b to (a,b) in "...", and b is not dead, -- then we must zap the deadness info on a,b zapBndrOccInfo keep_occ_info pat_id | keep_occ_info = pat_id | otherwise = zapIdOccInfo pat_id {- Note [Add unfolding for scrutinee] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ In general it's unlikely that a variable scrutinee will appear in the case alternatives case x of { ...x unlikely to appear... } because the binder-swap in OccAnal has got rid of all such occcurrences See Note [Binder swap] in OccAnal. BUT it is still VERY IMPORTANT to add a suitable unfolding for a variable scrutinee, in simplAlt. Here's why case x of y (a,b) -> case b of c I# v -> ...(f y)... There is no occurrence of 'b' in the (...(f y)...). But y gets the unfolding (a,b), and *that* mentions b. If f has a RULE RULE f (p, I# q) = ... we want that rule to match, so we must extend the in-scope env with a suitable unfolding for 'y'. It's *essential* for rule matching; but it's also good for case-elimintation -- suppose that 'f' was inlined and did multi-level case analysis, then we'd solve it in one simplifier sweep instead of two. Exactly the same issue arises in SpecConstr; see Note [Add scrutinee to ValueEnv too] in SpecConstr HOWEVER, given case x of y { Just a -> r1; Nothing -> r2 } we do not want to add the unfolding x -> y to 'x', which might seem cool, since 'y' itself has different unfoldings in r1 and r2. Reason: if we did that, we'd have to zap y's deadness info and that is a very useful piece of information. So instead we add the unfolding x -> Just a, and x -> Nothing in the respective RHSs. ************************************************************************ * * \subsection{Known constructor} * * ************************************************************************ We are a bit careful with occurrence info. Here's an example (\x* -> case x of (a*, b) -> f a) (h v, e) where the * means "occurs once". This effectively becomes case (h v, e) of (a*, b) -> f a) and then let a* = h v; b = e in f a and then f (h v) All this should happen in one sweep. -} knownCon :: SimplEnv -> OutExpr -- The scrutinee -> DataCon -> [OutType] -> [OutExpr] -- The scrutinee (in pieces) -> InId -> [InBndr] -> InExpr -- The alternative -> SimplCont -> SimplM (SimplEnv, OutExpr) knownCon env scrut dc dc_ty_args dc_args bndr bs rhs cont = do { env' <- bind_args env bs dc_args ; env'' <- bind_case_bndr env' ; simplExprF env'' rhs cont } where zap_occ = zapBndrOccInfo (isDeadBinder bndr) -- bndr is an InId -- Ugh! bind_args env' [] _ = return env' bind_args env' (b:bs') (Type ty : args) = ASSERT( isTyVar b ) bind_args (extendTvSubst env' b ty) bs' args bind_args env' (b:bs') (Coercion co : args) = ASSERT( isCoVar b ) bind_args (extendCvSubst env' b co) bs' args bind_args env' (b:bs') (arg : args) = ASSERT( isId b ) do { let b' = zap_occ b -- Note that the binder might be "dead", because it doesn't -- occur in the RHS; and simplNonRecX may therefore discard -- it via postInlineUnconditionally. -- Nevertheless we must keep it if the case-binder is alive, -- because it may be used in the con_app. See Note [knownCon occ info] ; env'' <- simplNonRecX env' b' arg -- arg satisfies let/app invariant ; bind_args env'' bs' args } bind_args _ _ _ = pprPanic "bind_args" $ ppr dc $$ ppr bs $$ ppr dc_args $$ text "scrut:" <+> ppr scrut -- It's useful to bind bndr to scrut, rather than to a fresh -- binding x = Con arg1 .. argn -- because very often the scrut is a variable, so we avoid -- creating, and then subsequently eliminating, a let-binding -- BUT, if scrut is a not a variable, we must be careful -- about duplicating the arg redexes; in that case, make -- a new con-app from the args bind_case_bndr env | isDeadBinder bndr = return env | exprIsTrivial scrut = return (extendIdSubst env bndr (DoneEx scrut)) | otherwise = do { dc_args <- mapM (simplVar env) bs -- dc_ty_args are aready OutTypes, -- but bs are InBndrs ; let con_app = Var (dataConWorkId dc) `mkTyApps` dc_ty_args `mkApps` dc_args ; simplNonRecX env bndr con_app } ------------------- missingAlt :: SimplEnv -> Id -> [InAlt] -> SimplCont -> SimplM (SimplEnv, OutExpr) -- This isn't strictly an error, although it is unusual. -- It's possible that the simplifer might "see" that -- an inner case has no accessible alternatives before -- it "sees" that the entire branch of an outer case is -- inaccessible. So we simply put an error case here instead. missingAlt env case_bndr _ cont = WARN( True, text "missingAlt" <+> ppr case_bndr ) return (env, mkImpossibleExpr (contResultType cont)) {- ************************************************************************ * * \subsection{Duplicating continuations} * * ************************************************************************ -} prepareCaseCont :: SimplEnv -> [InAlt] -> SimplCont -> SimplM (SimplEnv, SimplCont, -- Dupable part SimplCont) -- Non-dupable part -- We are considering -- K[case _ of { p1 -> r1; ...; pn -> rn }] -- where K is some enclosing continuation for the case -- Goal: split K into two pieces Kdup,Knodup so that -- a) Kdup can be duplicated -- b) Knodup[Kdup[e]] = K[e] -- The idea is that we'll transform thus: -- Knodup[ (case _ of { p1 -> Kdup[r1]; ...; pn -> Kdup[rn] } -- -- We may also return some extra bindings in SimplEnv (that scope over -- the entire continuation) -- -- When case-of-case is off, just make the entire continuation non-dupable prepareCaseCont env alts cont | not (sm_case_case (getMode env)) = return (env, mkBoringStop (contHoleType cont), cont) | not (many_alts alts) = return (env, cont, mkBoringStop (contResultType cont)) | otherwise = mkDupableCont env cont where many_alts :: [InAlt] -> Bool -- True iff strictly > 1 non-bottom alternative many_alts [] = False -- See Note [Bottom alternatives] many_alts [_] = False many_alts (alt:alts) | is_bot_alt alt = many_alts alts | otherwise = not (all is_bot_alt alts) is_bot_alt (_,_,rhs) = exprIsBottom rhs {- Note [Bottom alternatives] ~~~~~~~~~~~~~~~~~~~~~~~~~~ When we have case (case x of { A -> error .. ; B -> e; C -> error ..) of alts then we can just duplicate those alts because the A and C cases will disappear immediately. This is more direct than creating join points and inlining them away; and in some cases we would not even create the join points (see Note [Single-alternative case]) and we would keep the case-of-case which is silly. See Trac #4930. -} mkDupableCont :: SimplEnv -> SimplCont -> SimplM (SimplEnv, SimplCont, SimplCont) mkDupableCont env cont | contIsDupable cont = return (env, cont, mkBoringStop (contResultType cont)) mkDupableCont _ (Stop {}) = panic "mkDupableCont" -- Handled by previous eqn mkDupableCont env (CastIt ty cont) = do { (env', dup, nodup) <- mkDupableCont env cont ; return (env', CastIt ty dup, nodup) } -- Duplicating ticks for now, not sure if this is good or not mkDupableCont env cont@(TickIt{}) = return (env, mkBoringStop (contHoleType cont), cont) mkDupableCont env cont@(StrictBind {}) = return (env, mkBoringStop (contHoleType cont), cont) -- See Note [Duplicating StrictBind] mkDupableCont env (StrictArg info cci cont) -- See Note [Duplicating StrictArg] = do { (env', dup, nodup) <- mkDupableCont env cont ; (env'', args') <- mapAccumLM makeTrivialArg env' (ai_args info) ; return (env'', StrictArg (info { ai_args = args' }) cci dup, nodup) } mkDupableCont env cont@(ApplyToTy { sc_cont = tail }) = do { (env', dup_cont, nodup_cont) <- mkDupableCont env tail ; return (env', cont { sc_cont = dup_cont }, nodup_cont ) } mkDupableCont env (ApplyToVal { sc_arg = arg, sc_dup = dup, sc_env = se, sc_cont = cont }) = -- e.g. [...hole...] (...arg...) -- ==> -- let a = ...arg... -- in [...hole...] a do { (env', dup_cont, nodup_cont) <- mkDupableCont env cont ; (_, se', arg') <- simplArg env' dup se arg ; (env'', arg'') <- makeTrivial NotTopLevel env' (fsLit "karg") arg' ; let app_cont = ApplyToVal { sc_arg = arg'', sc_env = se' , sc_dup = OkToDup, sc_cont = dup_cont } ; return (env'', app_cont, nodup_cont) } mkDupableCont env cont@(Select { sc_bndr = case_bndr, sc_alts = [(_, bs, _rhs)] }) -- See Note [Single-alternative case] -- | not (exprIsDupable rhs && contIsDupable case_cont) -- | not (isDeadBinder case_bndr) | all isDeadBinder bs -- InIds && not (isUnliftedType (idType case_bndr)) -- Note [Single-alternative-unlifted] = return (env, mkBoringStop (contHoleType cont), cont) mkDupableCont env (Select { sc_bndr = case_bndr, sc_alts = alts , sc_env = se, sc_cont = cont }) = -- e.g. (case [...hole...] of { pi -> ei }) -- ===> -- let ji = \xij -> ei -- in case [...hole...] of { pi -> ji xij } do { tick (CaseOfCase case_bndr) ; (env', dup_cont, nodup_cont) <- prepareCaseCont env alts cont -- NB: We call prepareCaseCont here. If there is only one -- alternative, then dup_cont may be big, but that's ok -- because we push it into the single alternative, and then -- use mkDupableAlt to turn that simplified alternative into -- a join point if it's too big to duplicate. -- And this is important: see Note [Fusing case continuations] ; let alt_env = se `setInScope` env' ; (alt_env', case_bndr') <- simplBinder alt_env case_bndr ; alts' <- mapM (simplAlt alt_env' Nothing [] case_bndr' dup_cont) alts -- Safe to say that there are no handled-cons for the DEFAULT case -- NB: simplBinder does not zap deadness occ-info, so -- a dead case_bndr' will still advertise its deadness -- This is really important because in -- case e of b { (# p,q #) -> ... } -- b is always dead, and indeed we are not allowed to bind b to (# p,q #), -- which might happen if e was an explicit unboxed pair and b wasn't marked dead. -- In the new alts we build, we have the new case binder, so it must retain -- its deadness. -- NB: we don't use alt_env further; it has the substEnv for -- the alternatives, and we don't want that ; (env'', alts'') <- mkDupableAlts env' case_bndr' alts' ; return (env'', -- Note [Duplicated env] Select { sc_dup = OkToDup , sc_bndr = case_bndr', sc_alts = alts'' , sc_env = zapSubstEnv env'' , sc_cont = mkBoringStop (contHoleType nodup_cont) }, nodup_cont) } mkDupableAlts :: SimplEnv -> OutId -> [InAlt] -> SimplM (SimplEnv, [InAlt]) -- Absorbs the continuation into the new alternatives mkDupableAlts env case_bndr' the_alts = go env the_alts where go env0 [] = return (env0, []) go env0 (alt:alts) = do { (env1, alt') <- mkDupableAlt env0 case_bndr' alt ; (env2, alts') <- go env1 alts ; return (env2, alt' : alts' ) } mkDupableAlt :: SimplEnv -> OutId -> (AltCon, [CoreBndr], CoreExpr) -> SimplM (SimplEnv, (AltCon, [CoreBndr], CoreExpr)) mkDupableAlt env case_bndr (con, bndrs', rhs') = do dflags <- getDynFlags if exprIsDupable dflags rhs' -- Note [Small alternative rhs] then return (env, (con, bndrs', rhs')) else do { let rhs_ty' = exprType rhs' scrut_ty = idType case_bndr case_bndr_w_unf = case con of DEFAULT -> case_bndr DataAlt dc -> setIdUnfolding case_bndr unf where -- See Note [Case binders and join points] unf = mkInlineUnfolding Nothing rhs rhs = mkConApp2 dc (tyConAppArgs scrut_ty) bndrs' LitAlt {} -> WARN( True, text "mkDupableAlt" <+> ppr case_bndr <+> ppr con ) case_bndr -- The case binder is alive but trivial, so why has -- it not been substituted away? used_bndrs' | isDeadBinder case_bndr = filter abstract_over bndrs' | otherwise = bndrs' ++ [case_bndr_w_unf] abstract_over bndr | isTyVar bndr = True -- Abstract over all type variables just in case | otherwise = not (isDeadBinder bndr) -- The deadness info on the new Ids is preserved by simplBinders ; (final_bndrs', final_args) -- Note [Join point abstraction] <- if (any isId used_bndrs') then return (used_bndrs', varsToCoreExprs used_bndrs') else do { rw_id <- newId (fsLit "w") voidPrimTy ; return ([setOneShotLambda rw_id], [Var voidPrimId]) } ; join_bndr <- newId (fsLit "$j") (mkPiTypes final_bndrs' rhs_ty') -- Note [Funky mkPiTypes] ; let -- We make the lambdas into one-shot-lambdas. The -- join point is sure to be applied at most once, and doing so -- prevents the body of the join point being floated out by -- the full laziness pass really_final_bndrs = map one_shot final_bndrs' one_shot v | isId v = setOneShotLambda v | otherwise = v join_rhs = mkLams really_final_bndrs rhs' join_arity = exprArity join_rhs join_call = mkApps (Var join_bndr) final_args ; env' <- addPolyBind NotTopLevel env (NonRec (join_bndr `setIdArity` join_arity) join_rhs) ; return (env', (con, bndrs', join_call)) } -- See Note [Duplicated env] {- Note [Fusing case continuations] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ It's important to fuse two successive case continuations when the first has one alternative. That's why we call prepareCaseCont here. Consider this, which arises from thunk splitting (see Note [Thunk splitting] in WorkWrap): let x* = case (case v of {pn -> rn}) of I# a -> I# a in body The simplifier will find (Var v) with continuation Select (pn -> rn) ( Select [I# a -> I# a] ( StrictBind body Stop So we'll call mkDupableCont on Select [I# a -> I# a] (StrictBind body Stop) There is just one alternative in the first Select, so we want to simplify the rhs (I# a) with continuation (StricgtBind body Stop) Supposing that body is big, we end up with let $j a = <let x = I# a in body> in case v of { pn -> case rn of I# a -> $j a } This is just what we want because the rn produces a box that the case rn cancels with. See Trac #4957 a fuller example. Note [Case binders and join points] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Consider this case (case .. ) of c { I# c# -> ....c.... If we make a join point with c but not c# we get $j = \c -> ....c.... But if later inlining scrutines the c, thus $j = \c -> ... case c of { I# y -> ... } ... we won't see that 'c' has already been scrutinised. This actually happens in the 'tabulate' function in wave4main, and makes a significant difference to allocation. An alternative plan is this: $j = \c# -> let c = I# c# in ...c.... but that is bad if 'c' is *not* later scrutinised. So instead we do both: we pass 'c' and 'c#' , and record in c's inlining (a stable unfolding) that it's really I# c#, thus $j = \c# -> \c[=I# c#] -> ...c.... Absence analysis may later discard 'c'. NB: take great care when doing strictness analysis; see Note [Lamba-bound unfoldings] in DmdAnal. Also note that we can still end up passing stuff that isn't used. Before strictness analysis we have let $j x y c{=(x,y)} = (h c, ...) in ... After strictness analysis we see that h is strict, we end up with let $j x y c{=(x,y)} = ($wh x y, ...) and c is unused. Note [Duplicated env] ~~~~~~~~~~~~~~~~~~~~~ Some of the alternatives are simplified, but have not been turned into a join point So they *must* have an zapped subst-env. So we can't use completeNonRecX to bind the join point, because it might to do PostInlineUnconditionally, and we'd lose that when zapping the subst-env. We could have a per-alt subst-env, but zapping it (as we do in mkDupableCont, the Select case) is safe, and at worst delays the join-point inlining. Note [Small alternative rhs] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~ It is worth checking for a small RHS because otherwise we get extra let bindings that may cause an extra iteration of the simplifier to inline back in place. Quite often the rhs is just a variable or constructor. The Ord instance of Maybe in PrelMaybe.hs, for example, took several extra iterations because the version with the let bindings looked big, and so wasn't inlined, but after the join points had been inlined it looked smaller, and so was inlined. NB: we have to check the size of rhs', not rhs. Duplicating a small InAlt might invalidate occurrence information However, if it *is* dupable, we return the *un* simplified alternative, because otherwise we'd need to pair it up with an empty subst-env.... but we only have one env shared between all the alts. (Remember we must zap the subst-env before re-simplifying something). Rather than do this we simply agree to re-simplify the original (small) thing later. Note [Funky mkPiTypes] ~~~~~~~~~~~~~~~~~~~~~~ Notice the funky mkPiTypes. If the contructor has existentials it's possible that the join point will be abstracted over type variables as well as term variables. Example: Suppose we have data T = forall t. C [t] Then faced with case (case e of ...) of C t xs::[t] -> rhs We get the join point let j :: forall t. [t] -> ... j = /\t \xs::[t] -> rhs in case (case e of ...) of C t xs::[t] -> j t xs Note [Join point abstraction] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Join points always have at least one value argument, for several reasons * If we try to lift a primitive-typed something out for let-binding-purposes, we will *caseify* it (!), with potentially-disastrous strictness results. So instead we turn it into a function: \v -> e where v::Void#. The value passed to this function is void, which generates (almost) no code. * CPR. We used to say "&& isUnliftedType rhs_ty'" here, but now we make the join point into a function whenever used_bndrs' is empty. This makes the join-point more CPR friendly. Consider: let j = if .. then I# 3 else I# 4 in case .. of { A -> j; B -> j; C -> ... } Now CPR doesn't w/w j because it's a thunk, so that means that the enclosing function can't w/w either, which is a lose. Here's the example that happened in practice: kgmod :: Int -> Int -> Int kgmod x y = if x > 0 && y < 0 || x < 0 && y > 0 then 78 else 5 * Let-no-escape. We want a join point to turn into a let-no-escape so that it is implemented as a jump, and one of the conditions for LNE is that it's not updatable. In CoreToStg, see Note [What is a non-escaping let] * Floating. Since a join point will be entered once, no sharing is gained by floating out, but something might be lost by doing so because it might be allocated. I have seen a case alternative like this: True -> \v -> ... It's a bit silly to add the realWorld dummy arg in this case, making $j = \s v -> ... True -> $j s (the \v alone is enough to make CPR happy) but I think it's rare There's a slight infelicity here: we pass the overall case_bndr to all the join points if it's used in *any* RHS, because we don't know its usage in each RHS separately Note [Duplicating StrictArg] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~ The original plan had (where E is a big argument) e.g. f E [..hole..] ==> let $j = \a -> f E a in $j [..hole..] But this is terrible! Here's an example: && E (case x of { T -> F; F -> T }) Now, && is strict so we end up simplifying the case with an ArgOf continuation. If we let-bind it, we get let $j = \v -> && E v in simplExpr (case x of { T -> F; F -> T }) (ArgOf (\r -> $j r) And after simplifying more we get let $j = \v -> && E v in case x of { T -> $j F; F -> $j T } Which is a Very Bad Thing What we do now is this f E [..hole..] ==> let a = E in f a [..hole..] Now if the thing in the hole is a case expression (which is when we'll call mkDupableCont), we'll push the function call into the branches, which is what we want. Now RULES for f may fire, and call-pattern specialisation. Here's an example from Trac #3116 go (n+1) (case l of 1 -> bs' _ -> Chunk p fpc (o+1) (l-1) bs') If we can push the call for 'go' inside the case, we get call-pattern specialisation for 'go', which is *crucial* for this program. Here is the (&&) example: && E (case x of { T -> F; F -> T }) ==> let a = E in case x of { T -> && a F; F -> && a T } Much better! Notice that * Arguments to f *after* the strict one are handled by the ApplyToVal case of mkDupableCont. Eg f [..hole..] E * We can only do the let-binding of E because the function part of a StrictArg continuation is an explicit syntax tree. In earlier versions we represented it as a function (CoreExpr -> CoreEpxr) which we couldn't take apart. Do *not* duplicate StrictBind and StritArg continuations. We gain nothing by propagating them into the expressions, and we do lose a lot. The desire not to duplicate is the entire reason that mkDupableCont returns a pair of continuations. Note [Duplicating StrictBind] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Unlike StrictArg, there doesn't seem anything to gain from duplicating a StrictBind continuation, so we don't. Note [Single-alternative cases] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ This case is just like the ArgOf case. Here's an example: data T a = MkT !a ...(MkT (abs x))... Then we get case (case x of I# x' -> case x' <# 0# of True -> I# (negate# x') False -> I# x') of y { DEFAULT -> MkT y Because the (case x) has only one alternative, we'll transform to case x of I# x' -> case (case x' <# 0# of True -> I# (negate# x') False -> I# x') of y { DEFAULT -> MkT y But now we do *NOT* want to make a join point etc, giving case x of I# x' -> let $j = \y -> MkT y in case x' <# 0# of True -> $j (I# (negate# x')) False -> $j (I# x') In this case the $j will inline again, but suppose there was a big strict computation enclosing the orginal call to MkT. Then, it won't "see" the MkT any more, because it's big and won't get duplicated. And, what is worse, nothing was gained by the case-of-case transform. So, in circumstances like these, we don't want to build join points and push the outer case into the branches of the inner one. Instead, don't duplicate the continuation. When should we use this strategy? We should not use it on *every* single-alternative case: e.g. case (case ....) of (a,b) -> (# a,b #) Here we must push the outer case into the inner one! Other choices: * Match [(DEFAULT,_,_)], but in the common case of Int, the alternative-filling-in code turned the outer case into case (...) of y { I# _ -> MkT y } * Match on single alternative plus (not (isDeadBinder case_bndr)) Rationale: pushing the case inwards won't eliminate the construction. But there's a risk of case (...) of y { (a,b) -> let z=(a,b) in ... } Now y looks dead, but it'll come alive again. Still, this seems like the best option at the moment. * Match on single alternative plus (all (isDeadBinder bndrs)) Rationale: this is essentially seq. * Match when the rhs is *not* duplicable, and hence would lead to a join point. This catches the disaster-case above. We can test the *un-simplified* rhs, which is fine. It might get bigger or smaller after simplification; if it gets smaller, this case might fire next time round. NB also that we must test contIsDupable case_cont *too, because case_cont might be big! HOWEVER: I found that this version doesn't work well, because we can get let x = case (...) of { small } in ...case x... When x is inlined into its full context, we find that it was a bad idea to have pushed the outer case inside the (...) case. There is a cost to not doing case-of-case; see Trac #10626. Note [Single-alternative-unlifted] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Here's another single-alternative where we really want to do case-of-case: data Mk1 = Mk1 Int# | Mk2 Int# M1.f = \r [x_s74 y_s6X] case case y_s6X of tpl_s7m { M1.Mk1 ipv_s70 -> ipv_s70; M1.Mk2 ipv_s72 -> ipv_s72; } of wild_s7c { __DEFAULT -> case case x_s74 of tpl_s7n { M1.Mk1 ipv_s77 -> ipv_s77; M1.Mk2 ipv_s79 -> ipv_s79; } of wild1_s7b { __DEFAULT -> ==# [wild1_s7b wild_s7c]; }; }; So the outer case is doing *nothing at all*, other than serving as a join-point. In this case we really want to do case-of-case and decide whether to use a real join point or just duplicate the continuation: let $j s7c = case x of Mk1 ipv77 -> (==) s7c ipv77 Mk1 ipv79 -> (==) s7c ipv79 in case y of Mk1 ipv70 -> $j ipv70 Mk2 ipv72 -> $j ipv72 Hence: check whether the case binder's type is unlifted, because then the outer case is *not* a seq. ************************************************************************ * * Unfoldings * * ************************************************************************ -} simplLetUnfolding :: SimplEnv-> TopLevelFlag -> InId -> OutExpr -> Unfolding -> SimplM Unfolding simplLetUnfolding env top_lvl id new_rhs unf | isStableUnfolding unf = simplUnfolding env top_lvl id unf | otherwise = bottoming `seq` -- See Note [Force bottoming field] do { dflags <- getDynFlags ; return (mkUnfolding dflags InlineRhs (isTopLevel top_lvl) bottoming new_rhs) } -- We make an unfolding *even for loop-breakers*. -- Reason: (a) It might be useful to know that they are WHNF -- (b) In TidyPgm we currently assume that, if we want to -- expose the unfolding then indeed we *have* an unfolding -- to expose. (We could instead use the RHS, but currently -- we don't.) The simple thing is always to have one. where bottoming = isBottomingId id simplUnfolding :: SimplEnv-> TopLevelFlag -> InId -> Unfolding -> SimplM Unfolding -- Note [Setting the new unfolding] simplUnfolding env top_lvl id unf = case unf of NoUnfolding -> return unf OtherCon {} -> return unf DFunUnfolding { df_bndrs = bndrs, df_con = con, df_args = args } -> do { (env', bndrs') <- simplBinders rule_env bndrs ; args' <- mapM (simplExpr env') args ; return (mkDFunUnfolding bndrs' con args') } CoreUnfolding { uf_tmpl = expr, uf_src = src, uf_guidance = guide } | isStableSource src -> do { expr' <- simplExpr rule_env expr ; case guide of UnfWhen { ug_arity = arity, ug_unsat_ok = sat_ok } -- Happens for INLINE things -> let guide' = UnfWhen { ug_arity = arity, ug_unsat_ok = sat_ok , ug_boring_ok = inlineBoringOk expr' } -- Refresh the boring-ok flag, in case expr' -- has got small. This happens, notably in the inlinings -- for dfuns for single-method classes; see -- Note [Single-method classes] in TcInstDcls. -- A test case is Trac #4138 in return (mkCoreUnfolding src is_top_lvl expr' guide') -- See Note [Top-level flag on inline rules] in CoreUnfold _other -- Happens for INLINABLE things -> bottoming `seq` -- See Note [Force bottoming field] do { dflags <- getDynFlags ; return (mkUnfolding dflags src is_top_lvl bottoming expr') } } -- If the guidance is UnfIfGoodArgs, this is an INLINABLE -- unfolding, and we need to make sure the guidance is kept up -- to date with respect to any changes in the unfolding. | otherwise -> return noUnfolding -- Discard unstable unfoldings where bottoming = isBottomingId id is_top_lvl = isTopLevel top_lvl act = idInlineActivation id rule_env = updMode (updModeForStableUnfoldings act) env -- See Note [Simplifying inside stable unfoldings] in SimplUtils {- Note [Force bottoming field] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~ We need to force bottoming, or the new unfolding holds on to the old unfolding (which is part of the id). Note [Setting the new unfolding] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ * If there's an INLINE pragma, we simplify the RHS gently. Maybe we should do nothing at all, but simplifying gently might get rid of more crap. * If not, we make an unfolding from the new RHS. But *only* for non-loop-breakers. Making loop breakers not have an unfolding at all means that we can avoid tests in exprIsConApp, for example. This is important: if exprIsConApp says 'yes' for a recursive thing, then we can get into an infinite loop If there's an stable unfolding on a loop breaker (which happens for INLINEABLE), we hang on to the inlining. It's pretty dodgy, but the user did say 'INLINE'. May need to revisit this choice. ************************************************************************ * * Rules * * ************************************************************************ Note [Rules in a letrec] ~~~~~~~~~~~~~~~~~~~~~~~~ After creating fresh binders for the binders of a letrec, we substitute the RULES and add them back onto the binders; this is done *before* processing any of the RHSs. This is important. Manuel found cases where he really, really wanted a RULE for a recursive function to apply in that function's own right-hand side. See Note [Loop breaking and RULES] in OccAnal. -} addBndrRules :: SimplEnv -> InBndr -> OutBndr -> SimplM (SimplEnv, OutBndr) -- Rules are added back into the bin addBndrRules env in_id out_id | null old_rules = return (env, out_id) | otherwise = do { new_rules <- simplRules env (Just (idName out_id)) old_rules ; let final_id = out_id `setIdSpecialisation` mkRuleInfo new_rules ; return (modifyInScope env final_id, final_id) } where old_rules = ruleInfoRules (idSpecialisation in_id) simplRules :: SimplEnv -> Maybe Name -> [CoreRule] -> SimplM [CoreRule] simplRules env mb_new_nm rules = mapM simpl_rule rules where simpl_rule rule@(BuiltinRule {}) = return rule simpl_rule rule@(Rule { ru_bndrs = bndrs, ru_args = args , ru_fn = fn_name, ru_rhs = rhs }) = do { (env', bndrs') <- simplBinders env bndrs ; let rule_env = updMode updModeForRules env' ; args' <- mapM (simplExpr rule_env) args ; rhs' <- simplExpr rule_env rhs ; return (rule { ru_bndrs = bndrs' , ru_fn = mb_new_nm `orElse` fn_name , ru_args = args' , ru_rhs = rhs' }) }