Simplify.lhs 70.3 KB
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% (c) The AQUA Project, Glasgow University, 1993-1998
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\section[Simplify]{The main module of the simplifier}

\begin{code}
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{-# OPTIONS -w #-}
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-- The above warning supression flag is a temporary kludge.
-- While working on this module you are encouraged to remove it and fix
-- any warnings in the module. See
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--     http://hackage.haskell.org/trac/ghc/wiki/Commentary/CodingStyle#Warnings
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-- for details

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module Simplify ( simplTopBinds, simplExpr ) where
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#include "HsVersions.h"
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import DynFlags
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import SimplMonad
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import Type hiding	( substTy, extendTvSubst )
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import SimplEnv	
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import SimplUtils
import Id
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import Var
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import IdInfo
import Coercion
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import FamInstEnv	( topNormaliseType )
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import DataCon		( dataConRepStrictness, dataConUnivTyVars )
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import CoreSyn
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import NewDemand	( isStrictDmd )
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import PprCore		( pprParendExpr, pprCoreExpr )
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import CoreUnfold	( mkUnfolding, callSiteInline )
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import CoreUtils
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import Rules		( lookupRule )
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import BasicTypes	( isMarkedStrict )
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import CostCentre	( currentCCS )
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import TysPrim		( realWorldStatePrimTy )
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import PrelInfo		( realWorldPrimId )
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import BasicTypes	( TopLevelFlag(..), isTopLevel, 
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			  RecFlag(..), isNonRuleLoopBreaker )
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import Maybes		( orElse )
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import Outputable
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import Util
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\end{code}


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The guts of the simplifier is in this module, but the driver loop for
the simplifier is in SimplCore.lhs.
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-----------------------------------------
	*** 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.


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-----------------------------------------
	*** 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
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  - completeBind
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completeNonRecX:	[binder and rhs both simplified]
  - if the the thing needs case binding (unlifted and not ok-for-spec)
	build a Case
   else
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	completeBind
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	addFloats

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completeBind: 	[given a simplified RHS]
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	[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.
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%************************************************************************
%*									*
\subsection{Bindings}
%*									*
%************************************************************************

\begin{code}
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simplTopBinds :: SimplEnv -> [InBind] -> SimplM [OutBind]
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simplTopBinds env binds
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  = 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.
	; env <- simplRecBndrs env (bindersOfBinds binds)
	; dflags <- getDOptsSmpl
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	; let dump_flag = dopt Opt_D_dump_inlinings dflags || 
			  dopt Opt_D_dump_rule_firings dflags
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	; env' <- simpl_binds dump_flag env binds
	; freeTick SimplifierDone
	; return (getFloats env') }
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  where
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	-- We need to track the zapped top-level binders, because
	-- they should have their fragile IdInfo zapped (notably occurrence info)
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	-- That's why we run down binds and bndrs' simultaneously.
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	--
	-- The dump-flag emits a trace for each top-level binding, which
	-- helps to locate the tracing for inlining and rule firing
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    simpl_binds :: Bool -> SimplEnv -> [InBind] -> SimplM SimplEnv
    simpl_binds dump env []	      = return env
    simpl_binds dump env (bind:binds) = do { env' <- trace dump bind $
						     simpl_bind env bind
					   ; simpl_binds dump env' binds }
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    trace True  bind = pprTrace "SimplBind" (ppr (bindersOf bind))
    trace False bind = \x -> x
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    simpl_bind env (NonRec b r) = simplRecOrTopPair env TopLevel b r
    simpl_bind env (Rec pairs)  = simplRecBind      env TopLevel pairs
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\end{code}


%************************************************************************
%*									*
\subsection{Lazy bindings}
%*									*
%************************************************************************

simplRecBind is used for
	* recursive bindings only

\begin{code}
simplRecBind :: SimplEnv -> TopLevelFlag
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	     -> [(InId, InExpr)]
	     -> SimplM SimplEnv
simplRecBind env top_lvl pairs
  = do	{ env' <- go (zapFloats env) pairs
	; return (env `addRecFloats` env') }
	-- addFloats adds the floats from env', 
	-- *and* updates env with the in-scope set from env'
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  where
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    go env [] = return env
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    go env ((bndr, rhs) : pairs)
	= do { env <- simplRecOrTopPair env top_lvl bndr rhs
	     ; go env pairs }
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\end{code}

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simplOrTopPair is used for
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	* recursive bindings (whether top level or not)
	* top-level non-recursive bindings

It assumes the binder has already been simplified, but not its IdInfo.

\begin{code}
simplRecOrTopPair :: SimplEnv
	     	  -> TopLevelFlag
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	     	  -> InId -> InExpr	-- Binder and rhs
	     	  -> SimplM SimplEnv	-- Returns an env that includes the binding
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simplRecOrTopPair env top_lvl bndr rhs
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  | preInlineUnconditionally env top_lvl bndr rhs  	-- Check for unconditional inline
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  = do	{ tick (PreInlineUnconditionally bndr)
	; return (extendIdSubst env bndr (mkContEx env rhs)) }
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  | otherwise
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  = do	{ let bndr' = lookupRecBndr env bndr
	      (env', bndr'') = addLetIdInfo env bndr bndr'
	; simplLazyBind env' top_lvl Recursive bndr bndr'' rhs env' }
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	-- May not actually be recursive, but it doesn't matter
\end{code}


simplLazyBind is used for
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  * [simplRecOrTopPair] recursive bindings (whether top level or not)
  * [simplRecOrTopPair] top-level non-recursive bindings
  * [simplNonRecE]	non-top-level *lazy* non-recursive bindings
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Nota bene:
    1. It assumes that the binder is *already* simplified, 
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       and is in scope, and its IdInfo too, except unfolding
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    2. It assumes that the binder type is lifted.

    3. It does not check for pre-inline-unconditionallly;
       that should have been done already.

\begin{code}
simplLazyBind :: SimplEnv
	      -> TopLevelFlag -> RecFlag
	      -> InId -> OutId		-- Binder, both pre-and post simpl
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					-- The OutId has IdInfo, except arity, unfolding
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	      -> InExpr -> SimplEnv 	-- The RHS and its environment
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	      -> SimplM SimplEnv
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simplLazyBind env top_lvl is_rec bndr bndr1 rhs rhs_se
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  = do	{ let	rhs_env     = rhs_se `setInScope` env
		(tvs, body) = collectTyBinders rhs
	; (body_env, tvs') <- simplBinders rhs_env tvs
		-- See Note [Floating and type abstraction]
		-- in SimplUtils
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  	-- Simplify the RHS; note the mkRhsStop, which tells 
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	-- the simplifier that this is the RHS of a let.
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	; let rhs_cont = mkRhsStop (applyTys (idType bndr1) (mkTyVarTys tvs'))
	; (body_env1, body1) <- simplExprF body_env body rhs_cont

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	-- ANF-ise a constructor or PAP rhs
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	; (body_env2, body2) <- prepareRhs body_env1 body1
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	; (env', rhs')
	    <-	if not (doFloatFromRhs top_lvl is_rec False body2 body_env2)
		then				-- No floating, just wrap up!
		     do	{ rhs' <- mkLam tvs' (wrapFloats body_env2 body2)
			; return (env, rhs') }
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		else if null tvs then 		-- Simple floating
		     do	{ tick LetFloatFromLet
			; return (addFloats env body_env2, body2) }

		else  				-- Do type-abstraction first
		     do	{ tick LetFloatFromLet
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			; (poly_binds, body3) <- abstractFloats tvs' body_env2 body2
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			; rhs' <- mkLam tvs' body3
			; return (extendFloats env poly_binds, rhs') }

	; completeBind env' top_lvl bndr bndr1 rhs' }
\end{code}
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A specialised variant of simplNonRec used when the RHS is already simplified, 
notably in knownCon.  It uses case-binding where necessary.

\begin{code}
simplNonRecX :: SimplEnv
	     -> InId 		-- Old binder
	     -> OutExpr		-- Simplified RHS
	     -> SimplM SimplEnv

simplNonRecX env bndr new_rhs
  = do	{ (env, bndr') <- simplBinder env bndr
	; completeNonRecX env NotTopLevel NonRecursive
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			  (isStrictId bndr) bndr bndr' new_rhs }
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completeNonRecX :: SimplEnv
		-> TopLevelFlag -> RecFlag -> Bool
	        -> InId 		-- Old binder
		-> OutId		-- New binder
	     	-> OutExpr		-- Simplified RHS
	     	-> SimplM SimplEnv

completeNonRecX env top_lvl is_rec is_strict old_bndr new_bndr new_rhs
  = do 	{ (env1, rhs1) <- prepareRhs (zapFloats env) new_rhs
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	; (env2, rhs2) <- 
		if doFloatFromRhs top_lvl is_rec 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
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	; completeBind env2 NotTopLevel old_bndr new_bndr rhs2 }
\end{code}

{- 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 ...
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	--
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	-- 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.
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   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.
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  | preInlineUnconditionally env NotTopLevel bndr new_rhs
  = thing_inside (extendIdSubst env bndr (DoneEx new_rhs))
-}

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----------------------------------
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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)

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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

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\begin{code}
prepareRhs :: SimplEnv -> OutExpr -> SimplM (SimplEnv, OutExpr)
-- Adds new floats to the env iff that allows us to return a good RHS
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prepareRhs env (Cast rhs co)	-- Note [Float coercions]
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  | (ty1, ty2) <- coercionKind co	-- Do *not* do this if rhs has an unlifted type
  , not (isUnLiftedType ty1)		-- see Note [Float coercions (unlifted)]
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  = do	{ (env', rhs') <- makeTrivial env rhs
	; return (env', Cast rhs' co) }

prepareRhs env rhs
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  = do	{ (is_val, env', rhs') <- go 0 env rhs 
	; return (env', rhs') }
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  where
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    go n_val_args env (Cast rhs co)
	= do { (is_val, env', rhs') <- go n_val_args env rhs
	     ; return (is_val, env', Cast rhs' co) }
    go n_val_args env (App fun (Type ty))
	= do { (is_val, env', rhs') <- go n_val_args env fun
	     ; return (is_val, env', App rhs' (Type ty)) }
    go n_val_args env (App fun arg)
	= do { (is_val, env', fun') <- go (n_val_args+1) env fun
	     ; case is_val of
		True -> do { (env'', arg') <- makeTrivial env' arg
			   ; return (True, env'', App fun' arg') }
		False -> return (False, env, App fun arg) }
    go n_val_args env (Var fun)
	= return (is_val, env, Var fun)
	where
	  is_val = n_val_args > 0	-- There is at least one arg
					-- ...and the fun a constructor or PAP
		 && (isDataConWorkId fun || n_val_args < idArity fun)
    go n_val_args env other
	= return (False, env, other)
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\end{code}

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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 coerion to the usage site may well cancel the coersions
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

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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

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\begin{code}
makeTrivial :: SimplEnv -> OutExpr -> SimplM (SimplEnv, OutExpr)
-- Binds the expression to a variable, if it's not trivial, returning the variable
makeTrivial env expr
  | exprIsTrivial expr
  = return (env, expr)
  | otherwise		-- See Note [Take care] below
  = do 	{ var <- newId FSLIT("a") (exprType expr)
	; env <- completeNonRecX env NotTopLevel NonRecursive 
				 False var var expr
	; return (env, substExpr env (Var var)) }
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\end{code}
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%************************************************************************
%*									*
\subsection{Completing a lazy binding}
%*									*
%************************************************************************

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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
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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
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  - top-level bindings (when let-to-case is impossible) 
  - many situations where the "rhs" is known to be a WHNF
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		(so let-to-case is inappropriate).

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Nor does it do the atomic-argument thing

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\begin{code}
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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

completeBind env top_lvl old_bndr new_bndr new_rhs
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  | postInlineUnconditionally env top_lvl new_bndr occ_info new_rhs unfolding
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		-- Inline and discard the binding
  = do	{ tick (PostInlineUnconditionally old_bndr)
	; -- pprTrace "postInlineUnconditionally" (ppr old_bndr <+> ppr new_bndr <+> ppr new_rhs) $
	  return (extendIdSubst env old_bndr (DoneEx new_rhs)) }
	-- Use the substitution to make quite, quite sure that the
	-- substitution will happen, since we are going to discard the binding
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  |  otherwise
  = let
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	-- 	Arity info
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  	new_bndr_info = idInfo new_bndr `setArityInfo` exprArity new_rhs

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	-- 	Unfolding info
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	-- Add the unfolding *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
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	-- 	Demand info
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	-- 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...
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	-- After inlining f at some of its call sites the original binding may
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	-- (for example) be no longer strictly demanded.
	-- The solution here is a bit ad hoc...
 	info_w_unf = new_bndr_info `setUnfoldingInfo` unfolding
        final_info | loop_breaker		= new_bndr_info
		   | isEvaldUnfolding unfolding = zapDemandInfo info_w_unf `orElse` info_w_unf
		   | otherwise			= info_w_unf

	final_id = new_bndr `setIdInfo` final_info
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    in
		-- These seqs forces the Id, and hence its IdInfo,
		-- and hence any inner substitutions
    final_id					`seq`
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    -- pprTrace "Binding" (ppr final_id <+> ppr unfolding) $
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    return (addNonRec env final_id new_rhs)
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  where 
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    unfolding    = mkUnfolding (isTopLevel top_lvl) new_rhs
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    loop_breaker = isNonRuleLoopBreaker occ_info
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    old_info     = idInfo old_bndr
    occ_info     = occInfo old_info
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\end{code}
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%************************************************************************
%*									*
\subsection[Simplify-simplExpr]{The main function: simplExpr}
%*									*
%************************************************************************

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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.


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\begin{code}
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simplExpr :: SimplEnv -> CoreExpr -> SimplM CoreExpr
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simplExpr env expr = simplExprC env expr (mkBoringStop expr_ty')
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		   where
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		     expr_ty' = substTy env (exprType expr)
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	-- The type in the Stop continuation, expr_ty', is usually not used
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	-- It's only needed when discarding continuations after finding
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	-- a function that returns bottom.
	-- Hence the lazy substitution
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simplExprC :: SimplEnv -> CoreExpr -> SimplCont -> SimplM CoreExpr
	-- Simplify an expression, given a continuation
simplExprC env expr cont 
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  = -- 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)

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simplExprF env e cont 
  = -- pprTrace "simplExprF" (ppr e $$ ppr cont $$ ppr (seTvSubst env) $$ ppr (seIdSubst env) {- $$ ppr (seFloats env) -} ) $
    simplExprF' env e cont
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simplExprF' env (Var v)	       cont = simplVar env v cont
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simplExprF' env (Lit lit)      cont = rebuild env (Lit lit) cont
simplExprF' env (Note n expr)  cont = simplNote env n expr cont
simplExprF' env (Cast body co) cont = simplCast env body co cont
simplExprF' env (App fun arg)  cont = simplExprF env fun $
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				      ApplyTo NoDup arg env cont
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simplExprF' env expr@(Lam _ _) cont 
  = simplLam env (map zap 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.
  where
    n_args   = countArgs cont
    n_params = length bndrs
    (bndrs, body) = collectBinders expr
    zap | n_args >= n_params = \b -> b	
	| otherwise	     = \b -> if isTyVar b then b
				     else zapLamIdInfo b
	-- NB: we count all the args incl type args
	-- so we must count all the binders (incl type lambdas)
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simplExprF' env (Type ty) cont
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  = ASSERT( contIsRhsOrArg cont )
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    do	{ ty' <- simplType env ty
	; rebuild env (Type ty') cont }
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simplExprF' env (Case scrut bndr case_ty alts) cont
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  | not (switchIsOn (getSwitchChecker env) NoCaseOfCase)
  = 	-- Simplify the scrutinee with a Select continuation
    simplExprF env scrut (Select NoDup bndr alts env cont)
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  | otherwise
  = 	-- If case-of-case is off, simply simplify the case expression
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	-- in a vanilla Stop context, and rebuild the result around it
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    do	{ case_expr' <- simplExprC env scrut case_cont
	; rebuild env case_expr' cont }
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  where
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    case_cont = Select NoDup bndr alts env (mkBoringStop case_ty')
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    case_ty'  = substTy env case_ty	-- c.f. defn of simplExpr
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simplExprF' 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
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	; env <- simplRecBind env NotTopLevel pairs
	; simplExprF env body cont }
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simplExprF' env (Let (NonRec bndr rhs) body) cont
  = simplNonRecE env bndr (rhs, env) ([], body) cont
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---------------------------------
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simplType :: SimplEnv -> InType -> SimplM OutType
	-- Kept monadic just so we can do the seqType
simplType env ty
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  = -- pprTrace "simplType" (ppr ty $$ ppr (seTvSubst env)) $
    seqType new_ty   `seq`   returnSmpl new_ty
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  where
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    new_ty = substTy env ty
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\end{code}


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%************************************************************************
%*									*
\subsection{The main rebuilder}
%*									*
%************************************************************************

\begin{code}
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
  = -- pprTrace "rebuild" (ppr expr $$ ppr cont $$ ppr (seFloats env)) $
    case cont of
      Stop {}		      	   -> return (env, expr)
      CoerceIt co cont	      	   -> rebuild env (mkCoerce co expr) cont
      Select _ bndr alts se cont   -> rebuildCase (se `setFloats` env) expr bndr alts cont
      StrictArg fun ty info cont   -> rebuildCall env (fun `App` expr) (funResultTy ty) info cont
      StrictBind b bs body se cont -> do { env' <- simplNonRecX (se `setFloats` env) b expr
					 ; simplLam env' bs body cont }
      ApplyTo _ arg se cont	   -> do { arg' <- simplExpr (se `setInScope` env) arg
				         ; rebuild env (App expr arg') cont }
\end{code}


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%************************************************************************
%*									*
\subsection{Lambdas}
%*									*
%************************************************************************

\begin{code}
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simplCast :: SimplEnv -> InExpr -> Coercion -> SimplCont
	  -> SimplM (SimplEnv, OutExpr)
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simplCast env body co cont
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  = do	{ co' <- simplType env co
	; simplExprF env body (addCoerce co' cont) }
  where
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       addCoerce co cont = add_coerce co (coercionKind co) cont

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       add_coerce co (s1, k1) cont 	-- co :: ty~ty
         | s1 `coreEqType` k1 = cont	-- is a no-op

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       add_coerce co1 (s1, k2) (CoerceIt co2 cont)
         | (l1, t1) <- coercionKind co2
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                -- 	coerce T1 S1 (coerce S1 K1 e)
		-- ==>
		--	e, 			if T1=K1
		--	coerce T1 K1 e,		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 `coreEqType` t1  = cont		 -- The coerces cancel out  
         | otherwise           = CoerceIt (mkTransCoercion co1 co2) cont
    
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       add_coerce co (s1s2, t1t2) (ApplyTo dup (Type arg_ty) arg_se cont)
		-- (f `cast` g) ty  --->   (f ty) `cast` (g @ ty)
		-- This implements the PushT rule from the paper
	 | Just (tyvar,_) <- splitForAllTy_maybe s1s2
	 , not (isCoVar tyvar)
	 = ApplyTo dup (Type ty') (zapSubstEnv env) (addCoerce (mkInstCoercion co ty') cont)
	 where
	   ty' = substTy arg_se arg_ty

	-- ToDo: the PushC rule is not implemented at all

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       add_coerce co (s1s2, t1t2) (ApplyTo dup arg arg_se cont)
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         | not (isTypeArg arg)  -- This implements the Push rule from the paper
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         , isFunTy s1s2	  -- t1t2 must be a function type, becuase it's applied
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                -- co : s1s2 :=: t1t2
		--	(coerce (T1->T2) (S1->S2) F) E
		-- ===> 
		--	coerce T2 S2 (F (coerce S1 T1 E))
		--
		-- 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.
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		--
		-- Example of use: Trac #995
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         = ApplyTo dup new_arg (zapSubstEnv env) (addCoerce co2 cont)
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         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
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           new_arg    = mkCoerce (mkSymCoercion co1) arg'
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	   arg'       = substExpr arg_se arg

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       add_coerce co _ cont = CoerceIt co cont
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\end{code}

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%************************************************************************
%*									*
\subsection{Lambdas}
%*									*
%************************************************************************
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\begin{code}
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simplLam :: SimplEnv -> [InId] -> InExpr -> SimplCont
	 -> SimplM (SimplEnv, OutExpr)

simplLam env [] body cont = simplExprF env body cont
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      	-- Type-beta reduction
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simplLam env (bndr:bndrs) body (ApplyTo _ (Type ty_arg) arg_se cont)
  = ASSERT( isTyVar bndr )
    do	{ tick (BetaReduction bndr)
	; ty_arg' <- simplType (arg_se `setInScope` env) ty_arg
	; simplLam (extendTvSubst env bndr ty_arg') bndrs body cont }
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	-- Ordinary beta reduction
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simplLam env (bndr:bndrs) body (ApplyTo _ arg arg_se cont)
  = do	{ tick (BetaReduction bndr)	
	; simplNonRecE env bndr (arg, arg_se) (bndrs, body) cont }
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	-- Not enough args, so there are real lambdas left to put in the result
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simplLam env bndrs body cont
  = do	{ (env, bndrs') <- simplLamBndrs env bndrs
	; body' <- simplExpr env body
	; new_lam <- mkLam bndrs' body'
	; rebuild env new_lam cont }

------------------
simplNonRecE :: SimplEnv 
	     -> InId 			-- The binder
	     -> (InExpr, SimplEnv)	-- Rhs of binding (or arg of lambda)
	     -> ([InId], 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
--
-- 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 ...)

simplNonRecE env bndr (rhs, rhs_se) (bndrs, body) cont
  | preInlineUnconditionally env NotTopLevel bndr rhs
  = do	{ tick (PreInlineUnconditionally bndr)
	; simplLam (extendIdSubst env bndr (mkContEx rhs_se rhs)) bndrs body cont }

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  | isStrictId bndr
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  = do	{ simplExprF (rhs_se `setFloats` env) rhs 
		     (StrictBind bndr bndrs body env cont) }

  | otherwise
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  = do	{ (env, bndr') <- simplNonRecBndr env bndr
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	; env <- simplLazyBind env NotTopLevel NonRecursive bndr bndr' rhs rhs_se
	; simplLam env bndrs body cont }
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\end{code}

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%************************************************************************
%*									*
\subsection{Notes}
%*									*
%************************************************************************

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\begin{code}
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-- Hack alert: we only distinguish subsumed cost centre stacks for the 
-- purposes of inlining.  All other CCCSs are mapped to currentCCS.
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simplNote env (SCC cc) e cont
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  = do 	{ e' <- simplExpr (setEnclosingCC env currentCCS) e
	; rebuild env (mkSCC cc e') cont }
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-- See notes with SimplMonad.inlineMode
simplNote env InlineMe e cont
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  | Just (inside, outside) <- splitInlineCont cont  -- Boring boring continuation; see notes above
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  = do	{ 			-- Don't inline inside an INLINE expression
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	  e' <- simplExprC (setMode inlineMode env) e inside
	; rebuild env (mkInlineMe e') outside }
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  | otherwise  	-- Dissolve the InlineMe note if there's
		-- an interesting context of any kind to combine with
		-- (even a type application -- anything except Stop)
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  = simplExprF env e cont
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simplNote env (CoreNote s) e cont
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  = simplExpr env e    `thenSmpl` \ e' ->
    rebuild env (Note (CoreNote s) e') cont
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\end{code}


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%************************************************************************
%*									*
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\subsection{Dealing with calls}
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%*									*
%************************************************************************
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\begin{code}
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simplVar env var cont
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  = case substId env var of
	DoneEx e	 -> simplExprF (zapSubstEnv env) e cont
	ContEx tvs ids e -> simplExprF (setSubstEnv env tvs ids) e cont
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	DoneId var1      -> completeCall (zapSubstEnv env) var1 cont
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		-- Note [zapSubstEnv]
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		-- 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!!
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---------------------------------------------------------
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--	Dealing with a call site
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completeCall env var cont
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  = do	{ dflags <- getDOptsSmpl
	; let	(args,call_cont) = contArgs cont
		-- The args are OutExprs, obtained by *lazily* substituting
		-- in the args found in cont.  These args are only examined
		-- to limited depth (unless a rule fires).  But we must do
		-- the substitution; rule matching on un-simplified args would
		-- be bogus

	------------- First try rules ----------------
	-- Do this before trying inlining.  Some functions have 
	-- rules *and* are strict; in this case, we don't want to 
	-- inline the wrapper of the non-specialised thing; better
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	-- to call the specialised thing instead.
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	--
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	-- We used to use the black-listing mechanism to ensure that inlining of 
	-- the wrapper didn't occur for things that have specialisations till a 
	-- later phase, so but now we just try RULES first
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	--
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	-- Note [Self-recursive rules]
	-- ~~~~~~~~~~~~~~~~~~~~~~~~~~~
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	-- 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
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	; rules <- getRules
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	; let	in_scope   = getInScope env
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		maybe_rule = case activeRule dflags env of
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				Nothing     -> Nothing	-- No rules apply
				Just act_fn -> lookupRule act_fn in_scope 
							  rules var args 
	; case maybe_rule of {
	    Just (rule, rule_rhs) -> 
		tick (RuleFired (ru_name rule))			`thenSmpl_`
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		(if dopt Opt_D_dump_rule_firings dflags then
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		   pprTrace "Rule fired" (vcat [
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			text "Rule:" <+> ftext (ru_name rule),
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			text "Before:" <+> ppr var <+> sep (map pprParendExpr args),
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			text "After: " <+> pprCoreExpr rule_rhs,
			text "Cont:  " <+> ppr call_cont])
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		 else
			id)		$
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		simplExprF env rule_rhs (dropArgs (ruleArity rule) cont)
		-- The ruleArity says how many args the rule consumed
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	  ; Nothing -> do	-- No rules

	------------- Next try inlining ----------------
	{ let	arg_infos = [interestingArg arg | arg <- args, isValArg arg]
		n_val_args = length arg_infos
	      	interesting_cont = interestingCallContext (notNull args)
						  	  (notNull arg_infos)
						  	  call_cont
	 	active_inline = activeInline env var
		maybe_inline  = callSiteInline dflags active_inline
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				       var arg_infos interesting_cont
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	; case maybe_inline of {
	    Just unfolding  	-- There is an inlining!
	      ->  do { tick (UnfoldingDone var)
		     ; (if dopt Opt_D_dump_inlinings dflags then
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			   pprTrace ("Inlining done" ++ showSDoc (ppr var)) (vcat [
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				text "Before:" <+> ppr var <+> sep (map pprParendExpr args),
				text "Inlined fn: " <+> nest 2 (ppr unfolding),
				text "Cont:  " <+> ppr call_cont])
			 else
				id)
		       simplExprF env unfolding cont }

	    ; Nothing -> 		-- No inlining!

	------------- No inlining! ----------------
	-- Next, look for rules or specialisations that match
	--
	rebuildCall env (Var var) (idType var) 
		    (mkArgInfo var n_val_args call_cont) cont
    }}}}
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rebuildCall :: SimplEnv
	    -> OutExpr -> OutType	-- Function and its type
	    -> (Bool, [Bool])		-- See SimplUtils.mkArgInfo
	    -> SimplCont
	    -> SimplM (SimplEnv, OutExpr)
rebuildCall env fun fun_ty (has_rules, []) 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.
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  | not (contIsTrivial cont)	 -- Only do this if there is a non-trivial
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  = return (env, mk_coerce fun)  -- contination to discard, else we do it
  where				 -- again and again!
    cont_ty = contResultType cont
    co      = mkUnsafeCoercion fun_ty cont_ty
    mk_coerce expr | cont_ty `coreEqType` fun_ty = fun
		   | otherwise = mkCoerce co fun

rebuildCall env fun fun_ty info (ApplyTo _ (Type arg_ty) se cont)
  = do	{ ty' <- simplType (se `setInScope` env) arg_ty
	; rebuildCall env (fun `App` Type ty') (applyTy fun_ty ty') info cont }

rebuildCall env fun fun_ty (has_rules, str:strs) (ApplyTo _ arg arg_se cont)
  | str || isStrictType arg_ty		-- Strict argument
  = -- pprTrace "Strict Arg" (ppr arg $$ ppr (seIdSubst env) $$ ppr (seInScope env)) $
    simplExprF (arg_se `setFloats` env) arg
	       (StrictArg fun fun_ty (has_rules, strs) 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 arg_ty has_rules)
	; rebuildCall env (fun `App` arg') res_ty (has_rules, strs) cont }
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  where
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    (arg_ty, res_ty) = splitFunTy fun_ty
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rebuildCall env fun fun_ty info cont
  = rebuild env fun cont
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\end{code}
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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!
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%************************************************************************
%*									*
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		Rebuilding a cse expression
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%*									*
%************************************************************************
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Blob of helper functions for the "case-of-something-else" situation.

\begin{code}
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---------------------------------------------------------
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-- 	Eliminate the case if possible
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rebuildCase :: SimplEnv
	    -> OutExpr		-- Scrutinee
	    -> InId		-- Case binder
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	    -> [InAlt]		-- Alternatives (inceasing order)
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	    -> SimplCont
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	    -> SimplM (SimplEnv, OutExpr)
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--------------------------------------------------
--	1. Eliminate the case if there's a known constructor
--------------------------------------------------

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rebuildCase env scrut case_bndr alts cont
  | Just (con,args) <- exprIsConApp_maybe scrut	
	-- Works when the scrutinee is a variable with a known unfolding
	-- as well as when it's an explicit constructor application
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  = knownCon env scrut (DataAlt con) args case_bndr alts cont
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  | Lit lit <- scrut	-- No need for same treatment as constructors
			-- because literals are inlined more vigorously
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  = knownCon env scrut (LitAlt lit) [] case_bndr alts cont
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--------------------------------------------------
--	2. Eliminate the case if scrutinee is evaluated
--------------------------------------------------

rebuildCase env scrut case_bndr [(con,bndrs,rhs)] cont
  -- See if we can get rid of the case altogether
  -- See the extensive notes on case-elimination above
  -- mkCase made sure that if all the alternatives are equal, 
  -- then there is now only one (DEFAULT) rhs
 | all isDeadBinder bndrs	-- bndrs are [InId]

	-- Check that the scrutinee can be let-bound instead of case-bound
 , exprOkForSpeculation scrut
		-- OK not to evaluate it
		-- 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
		-- comparision operations (e.g. in (>=) for Int.Int32)
	|| exprIsHNF scrut			-- It's already evaluated
	|| var_demanded_later scrut		-- It'll be demanded later

--      || not opt_SimplPedanticBottoms)	-- Or we don't care!
--	We used to allow improving termination by discarding cases, unless -fpedantic-bottoms was on,
-- 	but that breaks badly for the dataToTag# primop, which relies on a case to evaluate
-- 	its argument:  case x of { y -> dataToTag# y }
--	Here we must *not* discard the case, because dataToTag# just fetches the tag from
--	the info pointer.  So we'll be pedantic all the time, and see if that gives any
-- 	other problems
--	Also we don't want to discard 'seq's
  = do	{ tick (CaseElim case_bndr)
	; env <- simplNonRecX env case_bndr scrut
	; simplExprF env rhs cont }
  where
	-- The case binder is going to be evaluated later, 
	-- and the scrutinee is a simple variable
    var_demanded_later (Var v) = isStrictDmd (idNewDemandInfo case_bndr)
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    		       	         && not (isTickBoxOp v)	
				    -- ugly hack; covering this case is what 
				    -- exprOkForSpeculation was intended for.
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    var_demanded_later other   = False


--------------------------------------------------
--	3. Catch-all case
--------------------------------------------------

rebuildCase env scrut case_bndr alts cont
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  = do	{ 	-- Prepare the continuation;
		-- The new subst_env is in place
	  (env, dup_cont, nodup_cont) <- prepareCaseCont env alts cont
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	-- Simplify the alternatives
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	; (scrut', case_bndr', alts') <- simplAlts env scrut case_bndr alts dup_cont
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	; let res_ty' = contResultType dup_cont
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	; case_expr <- mkCase scrut' case_bndr' res_ty' alts'
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	-- Notice that rebuildDone returns the in-scope set from env, not alt_env
	-- The case binder *not* scope over the whole returned case-expression
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	; rebuild env case_expr nodup_cont }
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\end{code}
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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.

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Note [no-case-of-case]
~~~~~~~~~~~~~~~~~~~~~~
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There is a time we *don't* want to do that, namely when
-fno-case-of-case is on.  This happens in the first simplifier pass,
and enhances full laziness.  Here's the bad case:
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	f = \ y -> ...(case x of I# v -> ...(case x of ...) ... )
If we eliminate the inner case, we trap it inside the I# v -> arm,
which might prevent some full laziness happening.  I've seen this
in action in spectral/cichelli/Prog.hs:
	 [(m,n) | m <- [1..max], n <- [1..max]]
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Hence the check for NoCaseOfCase.

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Note [Suppressing the case binder-swap]
~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~
There is another situation when it might make sense to suppress the
case-expression binde-swap. If we have
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    case x of w1 { DEFAULT -> case x of w2 { A -> e1; B -> e2 }
	           ...other cases .... }

We'll perform the binder-swap for the outer case, giving

    case x of w1 { DEFAULT -> case w1 of w2 { A -> e1; B -> e2 } 
	           ...other cases .... }

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But there is no point in doing it for the inner case, because w1 can't
be inlined anyway.  Furthermore, doing the case-swapping involves
zapping w2's occurrence info (see paragraphs that follow), and that
forces us to bind w2 when doing case merging.  So we get
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    case x of w1 { A -> let w2 = w1 in e1
		   B -> let w2 = w1 in e2
	           ...other cases .... }

This is plain silly in the common case where w2 is dead.

Even so, I can't see a good way to implement this idea.  I tried
not doing the binder-swap if the scrutinee was already evaluated
but that failed big-time:

	data T = MkT !Int
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	case v of w  { MkT x ->
	case x of x1 { I# y1 ->
	case x of x2 { I# y2 -> ...
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Notice that because MkT is strict, x is marked "evaluated".  But to
eliminate the last case, we must either make sure that x (as well as
x1) has unfolding MkT y1.  THe straightforward thing to do is to do
the binder-swap.  So this whole note is a no-op.

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Note [zapOccInfo]
~~~~~~~~~~~~~~~~~
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If we replace the scrutinee, v, by tbe case binder, then we have to nuke
any occurrence info (eg IAmDead) in the case binder, because the
case-binder now effectively occurs whenever v does.  AND we have to do
the same for the pattern-bound variables!  Example:
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	(case x of { (a,b) -> a }) (case x of { (p,q) -> q })
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Here, b and p are dead.  But when we move the argment inside the first
case RHS, and eliminate the second case, we get
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	case x of { (a,b) -> a b }
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Urk! b is alive!  Reason: the scrutinee was a variable, and case elimination
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