{- (c) The University of Glasgow 2006 (c) The GRASP/AQUA Project, Glasgow University, 1992-1998 Type subsumption and unification -} {-# LANGUAGE CPP, MultiWayIf, TupleSections, ScopedTypeVariables #-} module TcUnify ( -- Full-blown subsumption tcWrapResult, tcWrapResultO, tcSkolemise, tcSkolemiseET, tcSubTypeHR, tcSubTypeO, tcSubType_NC, tcSubTypeDS, tcSubTypeDS_NC_O, tcSubTypeET, checkConstraints, checkTvConstraints, buildImplicationFor, -- Various unifications unifyType, unifyTheta, unifyKind, uType, promoteTcType, swapOverTyVars, canSolveByUnification, -------------------------------- -- Holes tcInferInst, tcInferNoInst, matchExpectedListTy, matchExpectedTyConApp, matchExpectedAppTy, matchExpectedFunTys, matchActualFunTys, matchActualFunTysPart, matchExpectedFunKind, metaTyVarUpdateOK, occCheckForErrors, OccCheckResult(..) ) where #include "HsVersions.h" import GhcPrelude import HsSyn import TyCoRep import TcMType import TcRnMonad import TcType import Type import Coercion import TcEvidence import Name( isSystemName ) import Inst import TyCon import TysWiredIn import TysPrim( tYPE ) import Var import VarSet import VarEnv import ErrUtils import DynFlags import BasicTypes import Bag import Util import qualified GHC.LanguageExtensions as LangExt import Outputable import Control.Monad import Control.Arrow ( second ) {- ************************************************************************ * * matchExpected functions * * ************************************************************************ Note [Herald for matchExpectedFunTys] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ The 'herald' always looks like: "The equation(s) for 'f' have" "The abstraction (\x.e) takes" "The section (+ x) expects" "The function 'f' is applied to" This is used to construct a message of form The abstraction `\Just 1 -> ...' takes two arguments but its type `Maybe a -> a' has only one The equation(s) for `f' have two arguments but its type `Maybe a -> a' has only one The section `(f 3)' requires 'f' to take two arguments but its type `Int -> Int' has only one The function 'f' is applied to two arguments but its type `Int -> Int' has only one When visible type applications (e.g., `f @Int 1 2`, as in #13902) enter the picture, we have a choice in deciding whether to count the type applications as proper arguments: The function 'f' is applied to one visible type argument and two value arguments but its type `forall a. a -> a` has only one visible type argument and one value argument Or whether to include the type applications as part of the herald itself: The expression 'f @Int' is applied to two arguments but its type `Int -> Int` has only one The latter is easier to implement and is arguably easier to understand, so we choose to implement that option. Note [matchExpectedFunTys] ~~~~~~~~~~~~~~~~~~~~~~~~~~ matchExpectedFunTys checks that a sigma has the form of an n-ary function. It passes the decomposed type to the thing_inside, and returns a wrapper to coerce between the two types It's used wherever a language construct must have a functional type, namely: A lambda expression A function definition An operator section This function must be written CPS'd because it needs to fill in the ExpTypes produced for arguments before it can fill in the ExpType passed in. -} -- Use this one when you have an "expected" type. matchExpectedFunTys :: forall a. SDoc -- See Note [Herald for matchExpectedFunTys] -> Arity -> ExpRhoType -- deeply skolemised -> ([ExpSigmaType] -> ExpRhoType -> TcM a) -- must fill in these ExpTypes here -> TcM (a, HsWrapper) -- If matchExpectedFunTys n ty = (_, wrap) -- then wrap : (t1 -> ... -> tn -> ty_r) ~> ty, -- where [t1, ..., tn], ty_r are passed to the thing_inside matchExpectedFunTys herald arity orig_ty thing_inside = case orig_ty of Check ty -> go [] arity ty _ -> defer [] arity orig_ty where go acc_arg_tys 0 ty = do { result <- thing_inside (reverse acc_arg_tys) (mkCheckExpType ty) ; return (result, idHsWrapper) } go acc_arg_tys n ty | Just ty' <- tcView ty = go acc_arg_tys n ty' go acc_arg_tys n (FunTy arg_ty res_ty) = ASSERT( not (isPredTy arg_ty) ) do { (result, wrap_res) <- go (mkCheckExpType arg_ty : acc_arg_tys) (n-1) res_ty ; return ( result , mkWpFun idHsWrapper wrap_res arg_ty res_ty doc ) } where doc = text "When inferring the argument type of a function with type" <+> quotes (ppr orig_ty) go acc_arg_tys n ty@(TyVarTy tv) | isMetaTyVar tv = do { cts <- readMetaTyVar tv ; case cts of Indirect ty' -> go acc_arg_tys n ty' Flexi -> defer acc_arg_tys n (mkCheckExpType ty) } -- In all other cases we bale out into ordinary unification -- However unlike the meta-tyvar case, we are sure that the -- number of arguments doesn't match arity of the original -- type, so we can add a bit more context to the error message -- (cf Trac #7869). -- -- It is not always an error, because specialized type may have -- different arity, for example: -- -- > f1 = f2 'a' -- > f2 :: Monad m => m Bool -- > f2 = undefined -- -- But in that case we add specialized type into error context -- anyway, because it may be useful. See also Trac #9605. go acc_arg_tys n ty = addErrCtxtM mk_ctxt $ defer acc_arg_tys n (mkCheckExpType ty) ------------ defer :: [ExpSigmaType] -> Arity -> ExpRhoType -> TcM (a, HsWrapper) defer acc_arg_tys n fun_ty = do { more_arg_tys <- replicateM n newInferExpTypeNoInst ; res_ty <- newInferExpTypeInst ; result <- thing_inside (reverse acc_arg_tys ++ more_arg_tys) res_ty ; more_arg_tys <- mapM readExpType more_arg_tys ; res_ty <- readExpType res_ty ; let unif_fun_ty = mkFunTys more_arg_tys res_ty ; wrap <- tcSubTypeDS AppOrigin GenSigCtxt unif_fun_ty fun_ty -- Not a good origin at all :-( ; return (result, wrap) } ------------ mk_ctxt :: TidyEnv -> TcM (TidyEnv, MsgDoc) mk_ctxt env = do { (env', ty) <- zonkTidyTcType env orig_tc_ty ; let (args, _) = tcSplitFunTys ty n_actual = length args (env'', orig_ty') = tidyOpenType env' orig_tc_ty ; return ( env'' , mk_fun_tys_msg orig_ty' ty n_actual arity herald) } where orig_tc_ty = checkingExpType "matchExpectedFunTys" orig_ty -- this is safe b/c we're called from "go" -- Like 'matchExpectedFunTys', but used when you have an "actual" type, -- for example in function application matchActualFunTys :: SDoc -- See Note [Herald for matchExpectedFunTys] -> CtOrigin -> Maybe (HsExpr GhcRn) -- the thing with type TcSigmaType -> Arity -> TcSigmaType -> TcM (HsWrapper, [TcSigmaType], TcSigmaType) -- If matchActualFunTys n ty = (wrap, [t1,..,tn], ty_r) -- then wrap : ty ~> (t1 -> ... -> tn -> ty_r) matchActualFunTys herald ct_orig mb_thing arity ty = matchActualFunTysPart herald ct_orig mb_thing arity ty [] arity -- | Variant of 'matchActualFunTys' that works when supplied only part -- (that is, to the right of some arrows) of the full function type matchActualFunTysPart :: SDoc -- See Note [Herald for matchExpectedFunTys] -> CtOrigin -> Maybe (HsExpr GhcRn) -- the thing with type TcSigmaType -> Arity -> TcSigmaType -> [TcSigmaType] -- reversed args. See (*) below. -> Arity -- overall arity of the function, for errs -> TcM (HsWrapper, [TcSigmaType], TcSigmaType) matchActualFunTysPart herald ct_orig mb_thing arity orig_ty orig_old_args full_arity = go arity orig_old_args orig_ty -- Does not allocate unnecessary meta variables: if the input already is -- a function, we just take it apart. Not only is this efficient, -- it's important for higher rank: the argument might be of form -- (forall a. ty) -> other -- If allocated (fresh-meta-var1 -> fresh-meta-var2) and unified, we'd -- hide the forall inside a meta-variable -- (*) Sometimes it's necessary to call matchActualFunTys with only part -- (that is, to the right of some arrows) of the type of the function in -- question. (See TcExpr.tcArgs.) This argument is the reversed list of -- arguments already seen (that is, not part of the TcSigmaType passed -- in elsewhere). where -- This function has a bizarre mechanic: it accumulates arguments on -- the way down and also builds an argument list on the way up. Why: -- 1. The returns args list and the accumulated args list might be different. -- The accumulated args include all the arg types for the function, -- including those from before this function was called. The returned -- list should include only those arguments produced by this call of -- matchActualFunTys -- -- 2. The HsWrapper can be built only on the way up. It seems (more) -- bizarre to build the HsWrapper but not the arg_tys. -- -- Refactoring is welcome. go :: Arity -> [TcSigmaType] -- accumulator of arguments (reversed) -> TcSigmaType -- the remainder of the type as we're processing -> TcM (HsWrapper, [TcSigmaType], TcSigmaType) go 0 _ ty = return (idHsWrapper, [], ty) go n acc_args ty | not (null tvs && null theta) = do { (wrap1, rho) <- topInstantiate ct_orig ty ; (wrap2, arg_tys, res_ty) <- go n acc_args rho ; return (wrap2 <.> wrap1, arg_tys, res_ty) } where (tvs, theta, _) = tcSplitSigmaTy ty go n acc_args ty | Just ty' <- tcView ty = go n acc_args ty' go n acc_args (FunTy arg_ty res_ty) = ASSERT( not (isPredTy arg_ty) ) do { (wrap_res, tys, ty_r) <- go (n-1) (arg_ty : acc_args) res_ty ; return ( mkWpFun idHsWrapper wrap_res arg_ty ty_r doc , arg_ty : tys, ty_r ) } where doc = text "When inferring the argument type of a function with type" <+> quotes (ppr orig_ty) go n acc_args ty@(TyVarTy tv) | isMetaTyVar tv = do { cts <- readMetaTyVar tv ; case cts of Indirect ty' -> go n acc_args ty' Flexi -> defer n ty } -- In all other cases we bale out into ordinary unification -- However unlike the meta-tyvar case, we are sure that the -- number of arguments doesn't match arity of the original -- type, so we can add a bit more context to the error message -- (cf Trac #7869). -- -- It is not always an error, because specialized type may have -- different arity, for example: -- -- > f1 = f2 'a' -- > f2 :: Monad m => m Bool -- > f2 = undefined -- -- But in that case we add specialized type into error context -- anyway, because it may be useful. See also Trac #9605. go n acc_args ty = addErrCtxtM (mk_ctxt (reverse acc_args) ty) $ defer n ty ------------ defer n fun_ty = do { arg_tys <- replicateM n newOpenFlexiTyVarTy ; res_ty <- newOpenFlexiTyVarTy ; let unif_fun_ty = mkFunTys arg_tys res_ty ; co <- unifyType mb_thing fun_ty unif_fun_ty ; return (mkWpCastN co, arg_tys, res_ty) } ------------ mk_ctxt :: [TcSigmaType] -> TcSigmaType -> TidyEnv -> TcM (TidyEnv, MsgDoc) mk_ctxt arg_tys res_ty env = do { let ty = mkFunTys arg_tys res_ty ; (env1, zonked) <- zonkTidyTcType env ty -- zonking might change # of args ; let (zonked_args, _) = tcSplitFunTys zonked n_actual = length zonked_args (env2, unzonked) = tidyOpenType env1 ty ; return ( env2 , mk_fun_tys_msg unzonked zonked n_actual full_arity herald) } mk_fun_tys_msg :: TcType -- the full type passed in (unzonked) -> TcType -- the full type passed in (zonked) -> Arity -- the # of args found -> Arity -- the # of args wanted -> SDoc -- overall herald -> SDoc mk_fun_tys_msg full_ty ty n_args full_arity herald = herald <+> speakNOf full_arity (text "argument") <> comma $$ if n_args == full_arity then text "its type is" <+> quotes (pprType full_ty) <> comma $$ text "it is specialized to" <+> quotes (pprType ty) else sep [text "but its type" <+> quotes (pprType ty), if n_args == 0 then text "has none" else text "has only" <+> speakN n_args] ---------------------- matchExpectedListTy :: TcRhoType -> TcM (TcCoercionN, TcRhoType) -- Special case for lists matchExpectedListTy exp_ty = do { (co, [elt_ty]) <- matchExpectedTyConApp listTyCon exp_ty ; return (co, elt_ty) } --------------------- matchExpectedTyConApp :: TyCon -- T :: forall kv1 ... kvm. k1 -> ... -> kn -> * -> TcRhoType -- orig_ty -> TcM (TcCoercionN, -- T k1 k2 k3 a b c ~N orig_ty [TcSigmaType]) -- Element types, k1 k2 k3 a b c -- It's used for wired-in tycons, so we call checkWiredInTyCon -- Precondition: never called with FunTyCon -- Precondition: input type :: * -- Postcondition: (T k1 k2 k3 a b c) is well-kinded matchExpectedTyConApp tc orig_ty = ASSERT(tc /= funTyCon) go orig_ty where go ty | Just ty' <- tcView ty = go ty' go ty@(TyConApp tycon args) | tc == tycon -- Common case = return (mkTcNomReflCo ty, args) go (TyVarTy tv) | isMetaTyVar tv = do { cts <- readMetaTyVar tv ; case cts of Indirect ty -> go ty Flexi -> defer } go _ = defer -- If the common case does not occur, instantiate a template -- T k1 .. kn t1 .. tm, and unify with the original type -- Doing it this way ensures that the types we return are -- kind-compatible with T. For example, suppose we have -- matchExpectedTyConApp T (f Maybe) -- where data T a = MkT a -- Then we don't want to instantiate T's data constructors with -- (a::*) ~ Maybe -- because that'll make types that are utterly ill-kinded. -- This happened in Trac #7368 defer = do { (_, arg_tvs) <- newMetaTyVars (tyConTyVars tc) ; traceTc "matchExpectedTyConApp" (ppr tc $$ ppr (tyConTyVars tc) $$ ppr arg_tvs) ; let args = mkTyVarTys arg_tvs tc_template = mkTyConApp tc args ; co <- unifyType Nothing tc_template orig_ty ; return (co, args) } ---------------------- matchExpectedAppTy :: TcRhoType -- orig_ty -> TcM (TcCoercion, -- m a ~N orig_ty (TcSigmaType, TcSigmaType)) -- Returns m, a -- If the incoming type is a mutable type variable of kind k, then -- matchExpectedAppTy returns a new type variable (m: * -> k); note the *. matchExpectedAppTy orig_ty = go orig_ty where go ty | Just ty' <- tcView ty = go ty' | Just (fun_ty, arg_ty) <- tcSplitAppTy_maybe ty = return (mkTcNomReflCo orig_ty, (fun_ty, arg_ty)) go (TyVarTy tv) | isMetaTyVar tv = do { cts <- readMetaTyVar tv ; case cts of Indirect ty -> go ty Flexi -> defer } go _ = defer -- Defer splitting by generating an equality constraint defer = do { ty1 <- newFlexiTyVarTy kind1 ; ty2 <- newFlexiTyVarTy kind2 ; co <- unifyType Nothing (mkAppTy ty1 ty2) orig_ty ; return (co, (ty1, ty2)) } orig_kind = typeKind orig_ty kind1 = mkFunTy liftedTypeKind orig_kind kind2 = liftedTypeKind -- m :: * -> k -- arg type :: * {- ************************************************************************ * * Subsumption checking * * ************************************************************************ Note [Subsumption checking: tcSubType] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ All the tcSubType calls have the form tcSubType actual_ty expected_ty which checks actual_ty <= expected_ty That is, that a value of type actual_ty is acceptable in a place expecting a value of type expected_ty. I.e. that actual ty is more polymorphic than expected_ty It returns a coercion function co_fn :: actual_ty ~ expected_ty which takes an HsExpr of type actual_ty into one of type expected_ty. These functions do not actually check for subsumption. They check if expected_ty is an appropriate annotation to use for something of type actual_ty. This difference matters when thinking about visible type application. For example, forall a. a -> forall b. b -> b DOES NOT SUBSUME forall a b. a -> b -> b because the type arguments appear in a different order. (Neither does it work the other way around.) BUT, these types are appropriate annotations for one another. Because the user directs annotations, it's OK if some arguments shuffle around -- after all, it's what the user wants. Bottom line: none of this changes with visible type application. There are a number of wrinkles (below). Notice that Wrinkle 1 and 2 both require eta-expansion, which technically may increase termination. We just put up with this, in exchange for getting more predictable type inference. Wrinkle 1: Note [Deep skolemisation] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ We want (forall a. Int -> a -> a) <= (Int -> forall a. a->a) (see section 4.6 of "Practical type inference for higher rank types") So we must deeply-skolemise the RHS before we instantiate the LHS. That is why tc_sub_type starts with a call to tcSkolemise (which does the deep skolemisation), and then calls the DS variant (which assumes that expected_ty is deeply skolemised) Wrinkle 2: Note [Co/contra-variance of subsumption checking] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Consider g :: (Int -> Int) -> Int f1 :: (forall a. a -> a) -> Int f1 = g f2 :: (forall a. a -> a) -> Int f2 x = g x f2 will typecheck, and it would be odd/fragile if f1 did not. But f1 will only typecheck if we have that (Int->Int) -> Int <= (forall a. a->a) -> Int And that is only true if we do the full co/contravariant thing in the subsumption check. That happens in the FunTy case of tcSubTypeDS_NC_O, and is the sole reason for the WpFun form of HsWrapper. Another powerful reason for doing this co/contra stuff is visible in Trac #9569, involving instantiation of constraint variables, and again involving eta-expansion. Wrinkle 3: Note [Higher rank types] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Consider tc150: f y = \ (x::forall a. a->a). blah The following happens: * We will infer the type of the RHS, ie with a res_ty = alpha. * Then the lambda will split alpha := beta -> gamma. * And then we'll check tcSubType IsSwapped beta (forall a. a->a) So it's important that we unify beta := forall a. a->a, rather than skolemising the type. -} -- | Call this variant when you are in a higher-rank situation and -- you know the right-hand type is deeply skolemised. tcSubTypeHR :: CtOrigin -- ^ of the actual type -> Maybe (HsExpr GhcRn) -- ^ If present, it has type ty_actual -> TcSigmaType -> ExpRhoType -> TcM HsWrapper tcSubTypeHR orig = tcSubTypeDS_NC_O orig GenSigCtxt ------------------------ tcSubTypeET :: CtOrigin -> UserTypeCtxt -> ExpSigmaType -> TcSigmaType -> TcM HsWrapper -- If wrap = tc_sub_type_et t1 t2 -- => wrap :: t1 ~> t2 tcSubTypeET orig ctxt (Check ty_actual) ty_expected = tc_sub_tc_type eq_orig orig ctxt ty_actual ty_expected where eq_orig = TypeEqOrigin { uo_actual = ty_expected , uo_expected = ty_actual , uo_thing = Nothing , uo_visible = True } tcSubTypeET _ _ (Infer inf_res) ty_expected = ASSERT2( not (ir_inst inf_res), ppr inf_res $$ ppr ty_expected ) -- An (Infer inf_res) ExpSigmaType passed into tcSubTypeET never -- has the ir_inst field set. Reason: in patterns (which is what -- tcSubTypeET is used for) do not agressively instantiate do { co <- fill_infer_result ty_expected inf_res -- Since ir_inst is false, we can skip fillInferResult -- and go straight to fill_infer_result ; return (mkWpCastN (mkTcSymCo co)) } ------------------------ tcSubTypeO :: CtOrigin -- ^ of the actual type -> UserTypeCtxt -- ^ of the expected type -> TcSigmaType -> ExpRhoType -> TcM HsWrapper tcSubTypeO orig ctxt ty_actual ty_expected = addSubTypeCtxt ty_actual ty_expected $ do { traceTc "tcSubTypeDS_O" (vcat [ pprCtOrigin orig , pprUserTypeCtxt ctxt , ppr ty_actual , ppr ty_expected ]) ; tcSubTypeDS_NC_O orig ctxt Nothing ty_actual ty_expected } addSubTypeCtxt :: TcType -> ExpType -> TcM a -> TcM a addSubTypeCtxt ty_actual ty_expected thing_inside | isRhoTy ty_actual -- If there is no polymorphism involved, the , isRhoExpTy ty_expected -- TypeEqOrigin stuff (added by the _NC functions) = thing_inside -- gives enough context by itself | otherwise = addErrCtxtM mk_msg thing_inside where mk_msg tidy_env = do { (tidy_env, ty_actual) <- zonkTidyTcType tidy_env ty_actual -- might not be filled if we're debugging. ugh. ; mb_ty_expected <- readExpType_maybe ty_expected ; (tidy_env, ty_expected) <- case mb_ty_expected of Just ty -> second mkCheckExpType <$> zonkTidyTcType tidy_env ty Nothing -> return (tidy_env, ty_expected) ; ty_expected <- readExpType ty_expected ; (tidy_env, ty_expected) <- zonkTidyTcType tidy_env ty_expected ; let msg = vcat [ hang (text "When checking that:") 4 (ppr ty_actual) , nest 2 (hang (text "is more polymorphic than:") 2 (ppr ty_expected)) ] ; return (tidy_env, msg) } --------------- -- The "_NC" variants do not add a typechecker-error context; -- the caller is assumed to do that tcSubType_NC :: UserTypeCtxt -> TcSigmaType -> TcSigmaType -> TcM HsWrapper -- Checks that actual <= expected -- Returns HsWrapper :: actual ~ expected tcSubType_NC ctxt ty_actual ty_expected = do { traceTc "tcSubType_NC" (vcat [pprUserTypeCtxt ctxt, ppr ty_actual, ppr ty_expected]) ; tc_sub_tc_type origin origin ctxt ty_actual ty_expected } where origin = TypeEqOrigin { uo_actual = ty_actual , uo_expected = ty_expected , uo_thing = Nothing , uo_visible = True } tcSubTypeDS :: CtOrigin -> UserTypeCtxt -> TcSigmaType -> ExpRhoType -> TcM HsWrapper -- Just like tcSubType, but with the additional precondition that -- ty_expected is deeply skolemised (hence "DS") tcSubTypeDS orig ctxt ty_actual ty_expected = addSubTypeCtxt ty_actual ty_expected $ do { traceTc "tcSubTypeDS_NC" (vcat [pprUserTypeCtxt ctxt, ppr ty_actual, ppr ty_expected]) ; tcSubTypeDS_NC_O orig ctxt Nothing ty_actual ty_expected } tcSubTypeDS_NC_O :: CtOrigin -- origin used for instantiation only -> UserTypeCtxt -> Maybe (HsExpr GhcRn) -> TcSigmaType -> ExpRhoType -> TcM HsWrapper -- Just like tcSubType, but with the additional precondition that -- ty_expected is deeply skolemised tcSubTypeDS_NC_O inst_orig ctxt m_thing ty_actual ty_expected = case ty_expected of Infer inf_res -> fillInferResult inst_orig ty_actual inf_res Check ty -> tc_sub_type_ds eq_orig inst_orig ctxt ty_actual ty where eq_orig = TypeEqOrigin { uo_actual = ty_actual, uo_expected = ty , uo_thing = ppr <$> m_thing , uo_visible = True } --------------- tc_sub_tc_type :: CtOrigin -- used when calling uType -> CtOrigin -- used when instantiating -> UserTypeCtxt -> TcSigmaType -> TcSigmaType -> TcM HsWrapper -- If wrap = tc_sub_type t1 t2 -- => wrap :: t1 ~> t2 tc_sub_tc_type eq_orig inst_orig ctxt ty_actual ty_expected | definitely_poly ty_expected -- See Note [Don't skolemise unnecessarily] , not (possibly_poly ty_actual) = do { traceTc "tc_sub_tc_type (drop to equality)" $ vcat [ text "ty_actual =" <+> ppr ty_actual , text "ty_expected =" <+> ppr ty_expected ] ; mkWpCastN <$> uType TypeLevel eq_orig ty_actual ty_expected } | otherwise -- This is the general case = do { traceTc "tc_sub_tc_type (general case)" $ vcat [ text "ty_actual =" <+> ppr ty_actual , text "ty_expected =" <+> ppr ty_expected ] ; (sk_wrap, inner_wrap) <- tcSkolemise ctxt ty_expected $ \ _ sk_rho -> tc_sub_type_ds eq_orig inst_orig ctxt ty_actual sk_rho ; return (sk_wrap <.> inner_wrap) } where possibly_poly ty | isForAllTy ty = True | Just (_, res) <- splitFunTy_maybe ty = possibly_poly res | otherwise = False -- NB *not* tcSplitFunTy, because here we want -- to decompose type-class arguments too definitely_poly ty | (tvs, theta, tau) <- tcSplitSigmaTy ty , (tv:_) <- tvs , null theta , isInsolubleOccursCheck NomEq tv tau = True | otherwise = False {- Note [Don't skolemise unnecessarily] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Suppose we are trying to solve (Char->Char) <= (forall a. a->a) We could skolemise the 'forall a', and then complain that (Char ~ a) is insoluble; but that's a pretty obscure error. It's better to say that (Char->Char) ~ (forall a. a->a) fails. So roughly: * if the ty_expected has an outermost forall (i.e. skolemisation is the next thing we'd do) * and the ty_actual has no top-level polymorphism (but looking deeply) then we can revert to simple equality. But we need to be careful. These examples are all fine: * (Char -> forall a. a->a) <= (forall a. Char -> a -> a) Polymorphism is buried in ty_actual * (Char->Char) <= (forall a. Char -> Char) ty_expected isn't really polymorphic * (Char->Char) <= (forall a. (a~Char) => a -> a) ty_expected isn't really polymorphic * (Char->Char) <= (forall a. F [a] Char -> Char) where type instance F [x] t = t ty_expected isn't really polymorphic If we prematurely go to equality we'll reject a program we should accept (e.g. Trac #13752). So the test (which is only to improve error message) is very conservative: * ty_actual is /definitely/ monomorphic * ty_expected is /definitely/ polymorphic -} --------------- tc_sub_type_ds :: CtOrigin -- used when calling uType -> CtOrigin -- used when instantiating -> UserTypeCtxt -> TcSigmaType -> TcRhoType -> TcM HsWrapper -- If wrap = tc_sub_type_ds t1 t2 -- => wrap :: t1 ~> t2 -- Here is where the work actually happens! -- Precondition: ty_expected is deeply skolemised tc_sub_type_ds eq_orig inst_orig ctxt ty_actual ty_expected = do { traceTc "tc_sub_type_ds" $ vcat [ text "ty_actual =" <+> ppr ty_actual , text "ty_expected =" <+> ppr ty_expected ] ; go ty_actual ty_expected } where go ty_a ty_e | Just ty_a' <- tcView ty_a = go ty_a' ty_e | Just ty_e' <- tcView ty_e = go ty_a ty_e' go (TyVarTy tv_a) ty_e = do { lookup_res <- lookupTcTyVar tv_a ; case lookup_res of Filled ty_a' -> do { traceTc "tcSubTypeDS_NC_O following filled act meta-tyvar:" (ppr tv_a <+> text "-->" <+> ppr ty_a') ; tc_sub_type_ds eq_orig inst_orig ctxt ty_a' ty_e } Unfilled _ -> unify } -- Historical note (Sept 16): there was a case here for -- go ty_a (TyVarTy alpha) -- which, in the impredicative case unified alpha := ty_a -- where th_a is a polytype. Not only is this probably bogus (we -- simply do not have decent story for imprdicative types), but it -- caused Trac #12616 because (also bizarrely) 'deriving' code had -- -XImpredicativeTypes on. I deleted the entire case. go (FunTy act_arg act_res) (FunTy exp_arg exp_res) | not (isPredTy act_arg) , not (isPredTy exp_arg) = -- See Note [Co/contra-variance of subsumption checking] do { res_wrap <- tc_sub_type_ds eq_orig inst_orig ctxt act_res exp_res ; arg_wrap <- tc_sub_tc_type eq_orig given_orig ctxt exp_arg act_arg ; return (mkWpFun arg_wrap res_wrap exp_arg exp_res doc) } -- arg_wrap :: exp_arg ~> act_arg -- res_wrap :: act-res ~> exp_res where given_orig = GivenOrigin (SigSkol GenSigCtxt exp_arg []) doc = text "When checking that" <+> quotes (ppr ty_actual) <+> text "is more polymorphic than" <+> quotes (ppr ty_expected) go ty_a ty_e | let (tvs, theta, _) = tcSplitSigmaTy ty_a , not (null tvs && null theta) = do { (in_wrap, in_rho) <- topInstantiate inst_orig ty_a ; body_wrap <- tc_sub_type_ds (eq_orig { uo_actual = in_rho , uo_expected = ty_expected }) inst_orig ctxt in_rho ty_e ; return (body_wrap <.> in_wrap) } | otherwise -- Revert to unification = inst_and_unify -- It's still possible that ty_actual has nested foralls. Instantiate -- these, as there's no way unification will succeed with them in. -- See typecheck/should_compile/T11305 for an example of when this -- is important. The problem is that we're checking something like -- a -> forall b. b -> b <= alpha beta gamma -- where we end up with alpha := (->) inst_and_unify = do { (wrap, rho_a) <- deeplyInstantiate inst_orig ty_actual -- if we haven't recurred through an arrow, then -- the eq_orig will list ty_actual. In this case, -- we want to update the origin to reflect the -- instantiation. If we *have* recurred through -- an arrow, it's better not to update. ; let eq_orig' = case eq_orig of TypeEqOrigin { uo_actual = orig_ty_actual } | orig_ty_actual `tcEqType` ty_actual , not (isIdHsWrapper wrap) -> eq_orig { uo_actual = rho_a } _ -> eq_orig ; cow <- uType TypeLevel eq_orig' rho_a ty_expected ; return (mkWpCastN cow <.> wrap) } -- use versions without synonyms expanded unify = mkWpCastN <$> uType TypeLevel eq_orig ty_actual ty_expected ----------------- -- needs both un-type-checked (for origins) and type-checked (for wrapping) -- expressions tcWrapResult :: HsExpr GhcRn -> HsExpr GhcTcId -> TcSigmaType -> ExpRhoType -> TcM (HsExpr GhcTcId) tcWrapResult rn_expr = tcWrapResultO (exprCtOrigin rn_expr) rn_expr -- | Sometimes we don't have a @HsExpr Name@ to hand, and this is more -- convenient. tcWrapResultO :: CtOrigin -> HsExpr GhcRn -> HsExpr GhcTcId -> TcSigmaType -> ExpRhoType -> TcM (HsExpr GhcTcId) tcWrapResultO orig rn_expr expr actual_ty res_ty = do { traceTc "tcWrapResult" (vcat [ text "Actual: " <+> ppr actual_ty , text "Expected:" <+> ppr res_ty ]) ; cow <- tcSubTypeDS_NC_O orig GenSigCtxt (Just rn_expr) actual_ty res_ty ; return (mkHsWrap cow expr) } {- ********************************************************************** %* * ExpType functions: tcInfer, fillInferResult %* * %********************************************************************* -} -- | Infer a type using a fresh ExpType -- See also Note [ExpType] in TcMType -- Does not attempt to instantiate the inferred type tcInferNoInst :: (ExpSigmaType -> TcM a) -> TcM (a, TcSigmaType) tcInferNoInst = tcInfer False tcInferInst :: (ExpRhoType -> TcM a) -> TcM (a, TcRhoType) tcInferInst = tcInfer True tcInfer :: Bool -> (ExpSigmaType -> TcM a) -> TcM (a, TcSigmaType) tcInfer instantiate tc_check = do { res_ty <- newInferExpType instantiate ; result <- tc_check res_ty ; res_ty <- readExpType res_ty ; return (result, res_ty) } fillInferResult :: CtOrigin -> TcType -> InferResult -> TcM HsWrapper -- If wrap = fillInferResult t1 t2 -- => wrap :: t1 ~> t2 -- See Note [Deep instantiation of InferResult] fillInferResult orig ty inf_res@(IR { ir_inst = instantiate_me }) | instantiate_me = do { (wrap, rho) <- deeplyInstantiate orig ty ; co <- fill_infer_result rho inf_res ; return (mkWpCastN co <.> wrap) } | otherwise = do { co <- fill_infer_result ty inf_res ; return (mkWpCastN co) } fill_infer_result :: TcType -> InferResult -> TcM TcCoercionN -- If wrap = fill_infer_result t1 t2 -- => wrap :: t1 ~> t2 fill_infer_result orig_ty (IR { ir_uniq = u, ir_lvl = res_lvl , ir_ref = ref }) = do { (ty_co, ty_to_fill_with) <- promoteTcType res_lvl orig_ty ; traceTc "Filling ExpType" $ ppr u <+> text ":=" <+> ppr ty_to_fill_with ; when debugIsOn (check_hole ty_to_fill_with) ; writeTcRef ref (Just ty_to_fill_with) ; return ty_co } where check_hole ty -- Debug check only = do { let ty_lvl = tcTypeLevel ty ; MASSERT2( not (ty_lvl `strictlyDeeperThan` res_lvl), ppr u $$ ppr res_lvl $$ ppr ty_lvl $$ ppr ty <+> dcolon <+> ppr (typeKind ty) $$ ppr orig_ty ) ; cts <- readTcRef ref ; case cts of Just already_there -> pprPanic "writeExpType" (vcat [ ppr u , ppr ty , ppr already_there ]) Nothing -> return () } {- Note [Deep instantiation of InferResult] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ In some cases we want to deeply instantiate before filling in an InferResult, and in some cases not. That's why InferReult has the ir_inst flag. * ir_inst = True: deeply instantiate Consider f x = (*) We want to instantiate the type of (*) before returning, else we will infer the type f :: forall {a}. a -> forall b. Num b => b -> b -> b This is surely confusing for users. And worse, the monomorphism restriction won't properly. The MR is dealt with in simplifyInfer, and simplifyInfer has no way of instantiating. This could perhaps be worked around, but it may be hard to know even when instantiation should happen. Another reason. Consider f :: (?x :: Int) => a -> a g y = let ?x = 3::Int in f Here want to instantiate f's type so that the ?x::Int constraint gets discharged by the enclosing implicit-parameter binding. * ir_inst = False: do not instantiate Consider this (which uses visible type application): (let { f :: forall a. a -> a; f x = x } in f) @Int We'll call TcExpr.tcInferFun to infer the type of the (let .. in f) And we don't want to instantite the type of 'f' when we reach it, else the outer visible type application won't work -} {- ********************************************************************* * * Promoting types * * ********************************************************************* -} promoteTcType :: TcLevel -> TcType -> TcM (TcCoercion, TcType) -- See Note [Promoting a type] -- promoteTcType level ty = (co, ty') -- * Returns ty' whose max level is just 'level' -- and whose kind is ~# to the kind of 'ty' -- and whose kind has form TYPE rr -- * and co :: ty ~ ty' -- * and emits constraints to justify the coercion promoteTcType dest_lvl ty = do { cur_lvl <- getTcLevel ; if (cur_lvl `sameDepthAs` dest_lvl) then dont_promote_it else promote_it } where promote_it :: TcM (TcCoercion, TcType) promote_it -- Emit a constraint (alpha :: TYPE rr) ~ ty -- where alpha and rr are fresh and from level dest_lvl = do { rr <- newMetaTyVarTyAtLevel dest_lvl runtimeRepTy ; prom_ty <- newMetaTyVarTyAtLevel dest_lvl (tYPE rr) ; let eq_orig = TypeEqOrigin { uo_actual = ty , uo_expected = prom_ty , uo_thing = Nothing , uo_visible = False } ; co <- emitWantedEq eq_orig TypeLevel Nominal ty prom_ty ; return (co, prom_ty) } dont_promote_it :: TcM (TcCoercion, TcType) dont_promote_it -- Check that ty :: TYPE rr, for some (fresh) rr = do { res_kind <- newOpenTypeKind ; let ty_kind = typeKind ty kind_orig = TypeEqOrigin { uo_actual = ty_kind , uo_expected = res_kind , uo_thing = Nothing , uo_visible = False } ; ki_co <- uType KindLevel kind_orig (typeKind ty) res_kind ; let co = mkTcNomReflCo ty `mkTcCoherenceRightCo` ki_co ; return (co, ty `mkCastTy` ki_co) } {- Note [Promoting a type] ~~~~~~~~~~~~~~~~~~~~~~~~~~ Consider (Trac #12427) data T where MkT :: (Int -> Int) -> a -> T h y = case y of MkT v w -> v We'll infer the RHS type with an expected type ExpType of (IR { ir_lvl = l, ir_ref = ref, ... ) where 'l' is the TcLevel of the RHS of 'h'. Then the MkT pattern match will increase the level, so we'll end up in tcSubType, trying to unify the type of v, v :: Int -> Int with the expected type. But this attempt takes place at level (l+1), rightly so, since v's type could have mentioned existential variables, (like w's does) and we want to catch that. So we - create a new meta-var alpha[l+1] - fill in the InferRes ref cell 'ref' with alpha - emit an equality constraint, thus [W] alpha[l+1] ~ (Int -> Int) That constraint will float outwards, as it should, unless v's type mentions a skolem-captured variable. This approach fails if v has a higher rank type; see Note [Promotion and higher rank types] Note [Promotion and higher rank types] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ If v had a higher-rank type, say v :: (forall a. a->a) -> Int, then we'd emit an equality [W] alpha[l+1] ~ ((forall a. a->a) -> Int) which will sadly fail because we can't unify a unification variable with a polytype. But there is nothing really wrong with the program here. We could just about solve this by "promote the type" of v, to expose its polymorphic "shape" while still leaving constraints that will prevent existential escape. But we must be careful! Exposing the "shape" of the type is precisely what we must NOT do under a GADT pattern match! So in this case we might promote the type to (forall a. a->a) -> alpha[l+1] and emit the constraint [W] alpha[l+1] ~ Int Now the poromoted type can fill the ref cell, while the emitted equality can float or not, according to the usual rules. But that's not quite right! We are exposing the arrow! We could deal with that too: (forall a. mu[l+1] a a) -> alpha[l+1] with constraints [W] alpha[l+1] ~ Int [W] mu[l+1] ~ (->) Here we abstract over the '->' inside the forall, in case that is subject to an equality constraint from a GADT match. Note that we kept the outer (->) because that's part of the polymorphic "shape". And becauuse of impredicativity, GADT matches can't give equalities that affect polymorphic shape. This reasoning just seems too complicated, so I decided not to do it. These higher-rank notes are just here to record the thinking. -} {- ********************************************************************* * * Generalisation * * ********************************************************************* -} -- | Take an "expected type" and strip off quantifiers to expose the -- type underneath, binding the new skolems for the @thing_inside@. -- The returned 'HsWrapper' has type @specific_ty -> expected_ty@. tcSkolemise :: UserTypeCtxt -> TcSigmaType -> ([TcTyVar] -> TcType -> TcM result) -- ^ These are only ever used for scoped type variables. -> TcM (HsWrapper, result) -- ^ The expression has type: spec_ty -> expected_ty tcSkolemise ctxt expected_ty thing_inside -- We expect expected_ty to be a forall-type -- If not, the call is a no-op = do { traceTc "tcSkolemise" Outputable.empty ; (wrap, tv_prs, given, rho') <- deeplySkolemise expected_ty ; lvl <- getTcLevel ; when debugIsOn $ traceTc "tcSkolemise" $ vcat [ ppr lvl, text "expected_ty" <+> ppr expected_ty, text "inst tyvars" <+> ppr tv_prs, text "given" <+> ppr given, text "inst type" <+> ppr rho' ] -- Generally we must check that the "forall_tvs" havn't been constrained -- The interesting bit here is that we must include the free variables -- of the expected_ty. Here's an example: -- runST (newVar True) -- Here, if we don't make a check, we'll get a type (ST s (MutVar s Bool)) -- for (newVar True), with s fresh. Then we unify with the runST's arg type -- forall s'. ST s' a. That unifies s' with s, and a with MutVar s Bool. -- So now s' isn't unconstrained because it's linked to a. -- -- However [Oct 10] now that the untouchables are a range of -- TcTyVars, all this is handled automatically with no need for -- extra faffing around ; let tvs' = map snd tv_prs skol_info = SigSkol ctxt expected_ty tv_prs ; (ev_binds, result) <- checkConstraints skol_info tvs' given $ thing_inside tvs' rho' ; return (wrap <.> mkWpLet ev_binds, result) } -- The ev_binds returned by checkConstraints is very -- often empty, in which case mkWpLet is a no-op -- | Variant of 'tcSkolemise' that takes an ExpType tcSkolemiseET :: UserTypeCtxt -> ExpSigmaType -> (ExpRhoType -> TcM result) -> TcM (HsWrapper, result) tcSkolemiseET _ et@(Infer {}) thing_inside = (idHsWrapper, ) <$> thing_inside et tcSkolemiseET ctxt (Check ty) thing_inside = tcSkolemise ctxt ty $ \_ -> thing_inside . mkCheckExpType checkConstraints :: SkolemInfo -> [TcTyVar] -- Skolems -> [EvVar] -- Given -> TcM result -> TcM (TcEvBinds, result) checkConstraints skol_info skol_tvs given thing_inside = do { implication_needed <- implicationNeeded skol_tvs given ; if implication_needed then do { (tclvl, wanted, result) <- pushLevelAndCaptureConstraints thing_inside ; (implics, ev_binds) <- buildImplicationFor tclvl skol_info skol_tvs given wanted ; traceTc "checkConstraints" (ppr tclvl $$ ppr skol_tvs) ; emitImplications implics ; return (ev_binds, result) } else -- Fast path. We check every function argument with -- tcPolyExpr, which uses tcSkolemise and hence checkConstraints. -- So this fast path is well-exercised do { res <- thing_inside ; return (emptyTcEvBinds, res) } } checkTvConstraints :: SkolemInfo -> Maybe SDoc -- User-written telescope, if present -> TcM ([TcTyVar], result) -> TcM ([TcTyVar], result) checkTvConstraints skol_info m_telescope thing_inside = do { (tclvl, wanted, (skol_tvs, result)) <- pushLevelAndCaptureConstraints thing_inside ; if isEmptyWC wanted then return () else do { ev_binds <- newNoTcEvBinds ; implic <- newImplication ; emitImplication $ implic { ic_tclvl = tclvl , ic_skols = skol_tvs , ic_no_eqs = True , ic_telescope = m_telescope , ic_wanted = wanted , ic_binds = ev_binds , ic_info = skol_info } } ; return (skol_tvs, result) } implicationNeeded :: [TcTyVar] -> [EvVar] -> TcM Bool -- With the solver producing unlifted equalities, we need -- to have an EvBindsVar for them when they might be deferred to -- runtime. Otherwise, they end up as top-level unlifted bindings, -- which are verboten. See also Note [Deferred errors for coercion holes] -- in TcErrors. cf Trac #14149 for an example of what goes wrong. implicationNeeded skol_tvs given | null skol_tvs , null given = -- Empty skolems and givens do { tc_lvl <- getTcLevel ; if not (isTopTcLevel tc_lvl) -- No implication needed if we are then return False -- already inside an implication else do { dflags <- getDynFlags -- If any deferral can happen, -- we must build an implication ; return (gopt Opt_DeferTypeErrors dflags || gopt Opt_DeferTypedHoles dflags || gopt Opt_DeferOutOfScopeVariables dflags) } } | otherwise -- Non-empty skolems or givens = return True -- Definitely need an implication buildImplicationFor :: TcLevel -> SkolemInfo -> [TcTyVar] -> [EvVar] -> WantedConstraints -> TcM (Bag Implication, TcEvBinds) buildImplicationFor tclvl skol_info skol_tvs given wanted | isEmptyWC wanted && null given -- Optimisation : if there are no wanteds, and no givens -- don't generate an implication at all. -- Reason for the (null given): we don't want to lose -- the "inaccessible alternative" error check = return (emptyBag, emptyTcEvBinds) | otherwise = ASSERT2( all (isSkolemTyVar <||> isSigTyVar) skol_tvs, ppr skol_tvs ) -- Why allow SigTvs? Because implicitly declared kind variables in -- non-CUSK type declarations are SigTvs, and we need to bring them -- into scope as a skolem in an implication. This is OK, though, -- because SigTvs will always remain tyvars, even after unification. do { ev_binds_var <- newTcEvBinds ; implic <- newImplication ; let implic' = implic { ic_tclvl = tclvl , ic_skols = skol_tvs , ic_given = given , ic_wanted = wanted , ic_binds = ev_binds_var , ic_info = skol_info } ; return (unitBag implic', TcEvBinds ev_binds_var) } {- ************************************************************************ * * Boxy unification * * ************************************************************************ The exported functions are all defined as versions of some non-exported generic functions. -} unifyType :: Maybe (HsExpr GhcRn) -- ^ If present, has type 'ty1' -> TcTauType -> TcTauType -> TcM TcCoercionN -- Actual and expected types -- Returns a coercion : ty1 ~ ty2 unifyType thing ty1 ty2 = traceTc "utype" (ppr ty1 $$ ppr ty2 $$ ppr thing) >> uType TypeLevel origin ty1 ty2 where origin = TypeEqOrigin { uo_actual = ty1, uo_expected = ty2 , uo_thing = ppr <$> thing , uo_visible = True } -- always called from a visible context unifyKind :: Maybe (HsType GhcRn) -> TcKind -> TcKind -> TcM CoercionN unifyKind thing ty1 ty2 = traceTc "ukind" (ppr ty1 $$ ppr ty2 $$ ppr thing) >> uType KindLevel origin ty1 ty2 where origin = TypeEqOrigin { uo_actual = ty1, uo_expected = ty2 , uo_thing = ppr <$> thing , uo_visible = True } -- also always from a visible context --------------- unifyPred :: PredType -> PredType -> TcM TcCoercionN -- Actual and expected types unifyPred = unifyType Nothing --------------- unifyTheta :: TcThetaType -> TcThetaType -> TcM [TcCoercionN] -- Actual and expected types unifyTheta theta1 theta2 = do { checkTc (equalLength theta1 theta2) (vcat [text "Contexts differ in length", nest 2 $ parens $ text "Use RelaxedPolyRec to allow this"]) ; zipWithM unifyPred theta1 theta2 } {- %************************************************************************ %* * uType and friends %* * %************************************************************************ uType is the heart of the unifier. -} uType, uType_defer :: TypeOrKind -> CtOrigin -> TcType -- ty1 is the *actual* type -> TcType -- ty2 is the *expected* type -> TcM Coercion -------------- -- It is always safe to defer unification to the main constraint solver -- See Note [Deferred unification] uType_defer t_or_k origin ty1 ty2 = do { co <- emitWantedEq origin t_or_k Nominal ty1 ty2 -- Error trace only -- NB. do *not* call mkErrInfo unless tracing is on, -- because it is hugely expensive (#5631) ; whenDOptM Opt_D_dump_tc_trace $ do { ctxt <- getErrCtxt ; doc <- mkErrInfo emptyTidyEnv ctxt ; traceTc "utype_defer" (vcat [ debugPprType ty1 , debugPprType ty2 , pprCtOrigin origin , doc]) ; traceTc "utype_defer2" (ppr co) } ; return co } -------------- uType t_or_k origin orig_ty1 orig_ty2 = do { tclvl <- getTcLevel ; traceTc "u_tys" $ vcat [ text "tclvl" <+> ppr tclvl , sep [ ppr orig_ty1, text "~", ppr orig_ty2] , pprCtOrigin origin] ; co <- go orig_ty1 orig_ty2 ; if isReflCo co then traceTc "u_tys yields no coercion" Outputable.empty else traceTc "u_tys yields coercion:" (ppr co) ; return co } where go :: TcType -> TcType -> TcM Coercion -- The arguments to 'go' are always semantically identical -- to orig_ty{1,2} except for looking through type synonyms -- Variables; go for uVar -- Note that we pass in *original* (before synonym expansion), -- so that type variables tend to get filled in with -- the most informative version of the type go (TyVarTy tv1) ty2 = do { lookup_res <- lookupTcTyVar tv1 ; case lookup_res of Filled ty1 -> do { traceTc "found filled tyvar" (ppr tv1 <+> text ":->" <+> ppr ty1) ; go ty1 ty2 } Unfilled _ -> uUnfilledVar origin t_or_k NotSwapped tv1 ty2 } go ty1 (TyVarTy tv2) = do { lookup_res <- lookupTcTyVar tv2 ; case lookup_res of Filled ty2 -> do { traceTc "found filled tyvar" (ppr tv2 <+> text ":->" <+> ppr ty2) ; go ty1 ty2 } Unfilled _ -> uUnfilledVar origin t_or_k IsSwapped tv2 ty1 } -- See Note [Expanding synonyms during unification] go ty1@(TyConApp tc1 []) (TyConApp tc2 []) | tc1 == tc2 = return $ mkReflCo Nominal ty1 go (CastTy t1 co1) t2 = do { co_tys <- go t1 t2 ; return (mkCoherenceLeftCo co_tys co1) } go t1 (CastTy t2 co2) = do { co_tys <- go t1 t2 ; return (mkCoherenceRightCo co_tys co2) } -- See Note [Expanding synonyms during unification] -- -- Also NB that we recurse to 'go' so that we don't push a -- new item on the origin stack. As a result if we have -- type Foo = Int -- and we try to unify Foo ~ Bool -- we'll end up saying "can't match Foo with Bool" -- rather than "can't match "Int with Bool". See Trac #4535. go ty1 ty2 | Just ty1' <- tcView ty1 = go ty1' ty2 | Just ty2' <- tcView ty2 = go ty1 ty2' -- Functions (or predicate functions) just check the two parts go (FunTy fun1 arg1) (FunTy fun2 arg2) = do { co_l <- uType t_or_k origin fun1 fun2 ; co_r <- uType t_or_k origin arg1 arg2 ; return $ mkFunCo Nominal co_l co_r } -- Always defer if a type synonym family (type function) -- is involved. (Data families behave rigidly.) go ty1@(TyConApp tc1 _) ty2 | isTypeFamilyTyCon tc1 = defer ty1 ty2 go ty1 ty2@(TyConApp tc2 _) | isTypeFamilyTyCon tc2 = defer ty1 ty2 go (TyConApp tc1 tys1) (TyConApp tc2 tys2) -- See Note [Mismatched type lists and application decomposition] | tc1 == tc2, equalLength tys1 tys2 = ASSERT2( isGenerativeTyCon tc1 Nominal, ppr tc1 ) do { cos <- zipWith3M (uType t_or_k) origins' tys1 tys2 ; return $ mkTyConAppCo Nominal tc1 cos } where origins' = map (\is_vis -> if is_vis then origin else toInvisibleOrigin origin) (tcTyConVisibilities tc1) go (LitTy m) ty@(LitTy n) | m == n = return $ mkNomReflCo ty -- See Note [Care with type applications] -- Do not decompose FunTy against App; -- it's often a type error, so leave it for the constraint solver go (AppTy s1 t1) (AppTy s2 t2) = go_app (isNextArgVisible s1) s1 t1 s2 t2 go (AppTy s1 t1) (TyConApp tc2 ts2) | Just (ts2', t2') <- snocView ts2 = ASSERT( mightBeUnsaturatedTyCon tc2 ) go_app (isNextTyConArgVisible tc2 ts2') s1 t1 (TyConApp tc2 ts2') t2' go (TyConApp tc1 ts1) (AppTy s2 t2) | Just (ts1', t1') <- snocView ts1 = ASSERT( mightBeUnsaturatedTyCon tc1 ) go_app (isNextTyConArgVisible tc1 ts1') (TyConApp tc1 ts1') t1' s2 t2 go (CoercionTy co1) (CoercionTy co2) = do { let ty1 = coercionType co1 ty2 = coercionType co2 ; kco <- uType KindLevel (KindEqOrigin orig_ty1 (Just orig_ty2) origin (Just t_or_k)) ty1 ty2 ; return $ mkProofIrrelCo Nominal kco co1 co2 } -- Anything else fails -- E.g. unifying for-all types, which is relative unusual go ty1 ty2 = defer ty1 ty2 ------------------ defer ty1 ty2 -- See Note [Check for equality before deferring] | ty1 `tcEqType` ty2 = return (mkNomReflCo ty1) | otherwise = uType_defer t_or_k origin ty1 ty2 ------------------ go_app vis s1 t1 s2 t2 = do { co_s <- uType t_or_k origin s1 s2 ; let arg_origin | vis = origin | otherwise = toInvisibleOrigin origin ; co_t <- uType t_or_k arg_origin t1 t2 ; return $ mkAppCo co_s co_t } {- Note [Check for equality before deferring] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Particularly in ambiguity checks we can get equalities like (ty ~ ty). If ty involves a type function we may defer, which isn't very sensible. An egregious example of this was in test T9872a, which has a type signature Proxy :: Proxy (Solutions Cubes) Doing the ambiguity check on this signature generates the equality Solutions Cubes ~ Solutions Cubes and currently the constraint solver normalises both sides at vast cost. This little short-cut in 'defer' helps quite a bit. Note [Care with type applications] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Note: type applications need a bit of care! They can match FunTy and TyConApp, so use splitAppTy_maybe NB: we've already dealt with type variables and Notes, so if one type is an App the other one jolly well better be too Note [Mismatched type lists and application decomposition] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ When we find two TyConApps, you might think that the argument lists are guaranteed equal length. But they aren't. Consider matching w (T x) ~ Foo (T x y) We do match (w ~ Foo) first, but in some circumstances we simply create a deferred constraint; and then go ahead and match (T x ~ T x y). This came up in Trac #3950. So either (a) either we must check for identical argument kinds when decomposing applications, (b) or we must be prepared for ill-kinded unification sub-problems Currently we adopt (b) since it seems more robust -- no need to maintain a global invariant. Note [Expanding synonyms during unification] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ We expand synonyms during unification, but: * We expand *after* the variable case so that we tend to unify variables with un-expanded type synonym. This just makes it more likely that the inferred types will mention type synonyms understandable to the user * Similarly, we expand *after* the CastTy case, just in case the CastTy wraps a variable. * We expand *before* the TyConApp case. For example, if we have type Phantom a = Int and are unifying Phantom Int ~ Phantom Char it is *wrong* to unify Int and Char. * The problem case immediately above can happen only with arguments to the tycon. So we check for nullary tycons *before* expanding. This is particularly helpful when checking (* ~ *), because * is now a type synonym. Note [Deferred Unification] ~~~~~~~~~~~~~~~~~~~~~~~~~~~ We may encounter a unification ty1 ~ ty2 that cannot be performed syntactically, and yet its consistency is undetermined. Previously, there was no way to still make it consistent. So a mismatch error was issued. Now these unifications are deferred until constraint simplification, where type family instances and given equations may (or may not) establish the consistency. Deferred unifications are of the form F ... ~ ... or x ~ ... where F is a type function and x is a type variable. E.g. id :: x ~ y => x -> y id e = e involves the unification x = y. It is deferred until we bring into account the context x ~ y to establish that it holds. If available, we defer original types (rather than those where closed type synonyms have already been expanded via tcCoreView). This is, as usual, to improve error messages. ************************************************************************ * * uVar and friends * * ************************************************************************ @uVar@ is called when at least one of the types being unified is a variable. It does {\em not} assume that the variable is a fixed point of the substitution; rather, notice that @uVar@ (defined below) nips back into @uTys@ if it turns out that the variable is already bound. -} ---------- uUnfilledVar :: CtOrigin -> TypeOrKind -> SwapFlag -> TcTyVar -- Tyvar 1 -> TcTauType -- Type 2 -> TcM Coercion -- "Unfilled" means that the variable is definitely not a filled-in meta tyvar -- It might be a skolem, or untouchable, or meta uUnfilledVar origin t_or_k swapped tv1 ty2 = do { ty2 <- zonkTcType ty2 -- Zonk to expose things to the -- occurs check, and so that if ty2 -- looks like a type variable then it -- /is/ a type variable ; uUnfilledVar1 origin t_or_k swapped tv1 ty2 } ---------- uUnfilledVar1 :: CtOrigin -> TypeOrKind -> SwapFlag -> TcTyVar -- Tyvar 1 -> TcTauType -- Type 2, zonked -> TcM Coercion uUnfilledVar1 origin t_or_k swapped tv1 ty2 | Just tv2 <- tcGetTyVar_maybe ty2 = go tv2 | otherwise = uUnfilledVar2 origin t_or_k swapped tv1 ty2 where -- 'go' handles the case where both are -- tyvars so we might want to swap go tv2 | tv1 == tv2 -- Same type variable => no-op = return (mkNomReflCo (mkTyVarTy tv1)) | swapOverTyVars tv1 tv2 -- Distinct type variables = uUnfilledVar2 origin t_or_k (flipSwap swapped) tv2 (mkTyVarTy tv1) | otherwise = uUnfilledVar2 origin t_or_k swapped tv1 ty2 ---------- uUnfilledVar2 :: CtOrigin -> TypeOrKind -> SwapFlag -> TcTyVar -- Tyvar 1 -> TcTauType -- Type 2, zonked -> TcM Coercion uUnfilledVar2 origin t_or_k swapped tv1 ty2 = do { dflags <- getDynFlags ; cur_lvl <- getTcLevel ; go dflags cur_lvl } where go dflags cur_lvl | canSolveByUnification cur_lvl tv1 ty2 , Just ty2' <- metaTyVarUpdateOK dflags tv1 ty2 = do { co_k <- uType KindLevel kind_origin (typeKind ty2') (tyVarKind tv1) ; if isTcReflCo co_k -- only proceed if the kinds matched. then do { writeMetaTyVar tv1 ty2' ; return (mkTcNomReflCo ty2') } else defer } -- this cannot be solved now. -- See Note [Equalities with incompatible kinds] -- in TcCanonical | otherwise = defer -- Occurs check or an untouchable: just defer -- NB: occurs check isn't necessarily fatal: -- eg tv1 occured in type family parameter ty1 = mkTyVarTy tv1 kind_origin = KindEqOrigin ty1 (Just ty2) origin (Just t_or_k) defer = unSwap swapped (uType_defer t_or_k origin) ty1 ty2 swapOverTyVars :: TcTyVar -> TcTyVar -> Bool swapOverTyVars tv1 tv2 -- Level comparison: see Note [TyVar/TyVar orientation] | lvl1 `strictlyDeeperThan` lvl2 = False | lvl2 `strictlyDeeperThan` lvl1 = True -- Priority: see Note [TyVar/TyVar orientation] | pri1 > pri2 = False | pri2 > pri1 = True -- Names: see Note [TyVar/TyVar orientation] | isSystemName tv2_name, not (isSystemName tv1_name) = True | otherwise = False where lvl1 = tcTyVarLevel tv1 lvl2 = tcTyVarLevel tv2 pri1 = lhsPriority tv1 pri2 = lhsPriority tv2 tv1_name = Var.varName tv1 tv2_name = Var.varName tv2 lhsPriority :: TcTyVar -> Int -- Higher => more important to be on the LHS -- See Note [TyVar/TyVar orientation] lhsPriority tv = ASSERT2( isTyVar tv, ppr tv) case tcTyVarDetails tv of RuntimeUnk -> 0 SkolemTv {} -> 0 MetaTv { mtv_info = info } -> case info of FlatSkolTv -> 1 SigTv -> 2 TauTv -> 3 FlatMetaTv -> 4 {- Note [TyVar/TyVar orientation] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Given (a ~ b), should we orient the CTyEqCan as (a~b) or (b~a)? This is a surprisingly tricky question! First note: only swap if you have to! See Note [Avoid unnecessary swaps] So we look for a positive reason to swap, using a three-step test: * Level comparison. If 'a' has deeper level than 'b', put 'a' on the left. See Note [Deeper level on the left] * Priority. If the levels are the same, look at what kind of type variable it is, using 'lhsPriority' - FlatMetaTv: Always put on the left. See Note [Fmv Orientation Invariant] NB: FlatMetaTvs always have the current level, never an outer one. So nothing can be deeper than a FlatMetaTv - SigTv/TauTv: if we have sig_tv ~ tau_tv, put tau_tv on the left because there are fewer restrictions on updating TauTvs - SigTv/TauTv: put on the left eitehr a) Because it's touchable and can be unified, or b) Even if it's not touchable, TcSimplify.floatEqualities looks for meta tyvars on the left - FlatSkolTv: Put on the left in preference to a SkolemTv See Note [Eliminate flat-skols] * Names. If the level and priority comparisons are all equal, try to eliminate a TyVars with a System Name in favour of ones with a Name derived from a user type signature * Age. At one point in the past we tried to break any remaining ties by eliminating the younger type variable, based on their Uniques. See Note [Eliminate younger unification variables] (which also explains why we don't do this any more) Note [Deeper level on the left] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ The most important thing is that we want to put tyvars with the deepest level on the left. The reason to do so differs for Wanteds and Givens, but either way, deepest wins! Simple. * Wanteds. Putting the deepest variable on the left maximise the chances that it's a touchable meta-tyvar which can be solved. * Givens. Suppose we have something like forall a[2]. b[1] ~ a[2] => beta[1] ~ a[2] If we orient the Given a[2] on the left, we'll rewrite the Wanted to (beta[1] ~ b[1]), and that can float out of the implication. Otherwise it can't. By putting the deepest variable on the left we maximise our changes of elminating skolem capture. See also TcSMonad Note [Let-bound skolems] for another reason to orient with the deepest skolem on the left. IMPORTANT NOTE: this test does a level-number comparison on skolems, so it's important that skolems have (accurate) level numbers. See Trac #15009 for an further analysis of why "deepest on the left" is a good plan. Note [Fmv Orientation Invariant] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ * We always orient a constraint fmv ~ alpha with fmv on the left, even if alpha is a touchable unification variable Reason: doing it the other way round would unify alpha:=fmv, but that really doesn't add any info to alpha. But a later constraint alpha ~ Int might unlock everything. Comment:9 of #12526 gives a detailed example. WARNING: I've gone to and fro on this one several times. I'm now pretty sure that unifying alpha:=fmv is a bad idea! So orienting with fmvs on the left is a good thing. This example comes from IndTypesPerfMerge. (Others include T10226, T10009.) From the ambiguity check for f :: (F a ~ a) => a we get: [G] F a ~ a [WD] F alpha ~ alpha, alpha ~ a From Givens we get [G] F a ~ fsk, fsk ~ a Now if we flatten we get [WD] alpha ~ fmv, F alpha ~ fmv, alpha ~ a Now, if we unified alpha := fmv, we'd get [WD] F fmv ~ fmv, [WD] fmv ~ a And now we are stuck. So instead the Fmv Orientation Invariant puts the fmv on the left, giving [WD] fmv ~ alpha, [WD] F alpha ~ fmv, [WD] alpha ~ a Now we get alpha:=a, and everything works out Note [Eliminate flat-skols] ~~~~~~~~~~~~~~~~~~~~~~~~~~~ Suppose we have [G] Num (F [a]) then we flatten to [G] Num fsk [G] F [a] ~ fsk where fsk is a flatten-skolem (FlatSkolTv). Suppose we have type instance F [a] = a then we'll reduce the second constraint to [G] a ~ fsk and then replace all uses of 'a' with fsk. That's bad because in error messages intead of saying 'a' we'll say (F [a]). In all places, including those where the programmer wrote 'a' in the first place. Very confusing! See Trac #7862. Solution: re-orient a~fsk to fsk~a, so that we preferentially eliminate the fsk. Note [Avoid unnecessary swaps] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ If we swap without actually improving matters, we can get an infinite loop. Consider work item: a ~ b inert item: b ~ c We canonicalise the work-item to (a ~ c). If we then swap it before adding to the inert set, we'll add (c ~ a), and therefore kick out the inert guy, so we get new work item: b ~ c inert item: c ~ a And now the cycle just repeats Note [Eliminate younger unification variables] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Given a choice of unifying alpha := beta or beta := alpha we try, if possible, to elimiate the "younger" one, as determined by `ltUnique`. Reason: the younger one is less likely to appear free in an existing inert constraint, and hence we are less likely to be forced into kicking out and rewriting inert constraints. This is a performance optimisation only. It turns out to fix Trac #14723 all by itself, but clearly not reliably so! It's simple to implement (see nicer_to_update_tv2 in swapOverTyVars). But, to my surprise, it didn't seem to make any significant difference to the compiler's performance, so I didn't take it any further. Still it seemed to too nice to discard altogether, so I'm leaving these notes. SLPJ Jan 18. -} -- @trySpontaneousSolve wi@ solves equalities where one side is a -- touchable unification variable. -- Returns True <=> spontaneous solve happened canSolveByUnification :: TcLevel -> TcTyVar -> TcType -> Bool canSolveByUnification tclvl tv xi | isTouchableMetaTyVar tclvl tv = case metaTyVarInfo tv of SigTv -> is_tyvar xi _ -> True | otherwise -- Untouchable = False where is_tyvar xi = case tcGetTyVar_maybe xi of Nothing -> False Just tv -> case tcTyVarDetails tv of MetaTv { mtv_info = info } -> case info of SigTv -> True _ -> False SkolemTv {} -> True RuntimeUnk -> True {- Note [Prevent unification with type families] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ We prevent unification with type families because of an uneasy compromise. It's perfectly sound to unify with type families, and it even improves the error messages in the testsuite. It also modestly improves performance, at least in some cases. But it's disastrous for test case perf/compiler/T3064. Here is the problem: Suppose we have (F ty) where we also have [G] F ty ~ a. What do we do? Do we reduce F? Or do we use the given? Hard to know what's best. GHC reduces. This is a disaster for T3064, where the type's size spirals out of control during reduction. (We're not helped by the fact that the flattener re-flattens all the arguments every time around.) If we prevent unification with type families, then the solver happens to use the equality before expanding the type family. It would be lovely in the future to revisit this problem and remove this extra, unnecessary check. But we retain it for now as it seems to work better in practice. Note [Refactoring hazard: checkTauTvUpdate] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ I (Richard E.) have a sad story about refactoring this code, retained here to prevent others (or a future me!) from falling into the same traps. It all started with #11407, which was caused by the fact that the TyVarTy case of defer_me didn't look in the kind. But it seemed reasonable to simply remove the defer_me check instead. It referred to two Notes (since removed) that were out of date, and the fast_check code in occurCheckExpand seemed to do just about the same thing as defer_me. The one piece that defer_me did that wasn't repeated by occurCheckExpand was the type-family check. (See Note [Prevent unification with type families].) So I checked the result of occurCheckExpand for any type family occurrences and deferred if there were any. This was done in commit e9bf7bb5cc9fb3f87dd05111aa23da76b86a8967 . This approach turned out not to be performant, because the expanded type was bigger than the original type, and tyConsOfType (needed to see if there are any type family occurrences) looks through type synonyms. So it then struck me that we could dispense with the defer_me check entirely. This simplified the code nicely, and it cut the allocations in T5030 by half. But, as documented in Note [Prevent unification with type families], this destroyed performance in T3064. Regardless, I missed this regression and the change was committed as 3f5d1a13f112f34d992f6b74656d64d95a3f506d . Bottom lines: * defer_me is back, but now fixed w.r.t. #11407. * Tread carefully before you start to refactor here. There can be lots of hard-to-predict consequences. Note [Type synonyms and the occur check] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Generally speaking we try to update a variable with type synonyms not expanded, which improves later error messages, unless looking inside a type synonym may help resolve a spurious occurs check error. Consider: type A a = () f :: (A a -> a -> ()) -> () f = \ _ -> () x :: () x = f (\ x p -> p x) We will eventually get a constraint of the form t ~ A t. The ok function above will properly expand the type (A t) to just (), which is ok to be unified with t. If we had unified with the original type A t, we would lead the type checker into an infinite loop. Hence, if the occurs check fails for a type synonym application, then (and *only* then), the ok function expands the synonym to detect opportunities for occurs check success using the underlying definition of the type synonym. The same applies later on in the constraint interaction code; see TcInteract, function @occ_check_ok@. Note [Non-TcTyVars in TcUnify] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Because the same code is now shared between unifying types and unifying kinds, we sometimes will see proper TyVars floating around the unifier. Example (from test case polykinds/PolyKinds12): type family Apply (f :: k1 -> k2) (x :: k1) :: k2 type instance Apply g y = g y When checking the instance declaration, we first *kind-check* the LHS and RHS, discovering that the instance really should be type instance Apply k3 k4 (g :: k3 -> k4) (y :: k3) = g y During this kind-checking, all the tyvars will be TcTyVars. Then, however, as a second pass, we desugar the RHS (which is done in functions prefixed with "tc" in TcTyClsDecls"). By this time, all the kind-vars are proper TyVars, not TcTyVars, get some kind unification must happen. Thus, we always check if a TyVar is a TcTyVar before asking if it's a meta-tyvar. This used to not be necessary for type-checking (that is, before * :: *) because expressions get desugared via an algorithm separate from type-checking (with wrappers, etc.). Types get desugared very differently, causing this wibble in behavior seen here. -} data LookupTyVarResult -- The result of a lookupTcTyVar call = Unfilled TcTyVarDetails -- SkolemTv or virgin MetaTv | Filled TcType lookupTcTyVar :: TcTyVar -> TcM LookupTyVarResult lookupTcTyVar tyvar | MetaTv { mtv_ref = ref } <- details = do { meta_details <- readMutVar ref ; case meta_details of Indirect ty -> return (Filled ty) Flexi -> do { is_touchable <- isTouchableTcM tyvar -- Note [Unifying untouchables] ; if is_touchable then return (Unfilled details) else return (Unfilled vanillaSkolemTv) } } | otherwise = return (Unfilled details) where details = tcTyVarDetails tyvar {- Note [Unifying untouchables] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~ We treat an untouchable type variable as if it was a skolem. That ensures it won't unify with anything. It's a slight hack, because we return a made-up TcTyVarDetails, but I think it works smoothly. -} -- | Breaks apart a function kind into its pieces. matchExpectedFunKind :: Outputable fun => fun -- ^ type, only for errors -> TcKind -- ^ function kind -> TcM (Coercion, TcKind, TcKind) -- ^ co :: old_kind ~ arg -> res matchExpectedFunKind hs_ty = go where go k | Just k' <- tcView k = go k' go k@(TyVarTy kvar) | isMetaTyVar kvar = do { maybe_kind <- readMetaTyVar kvar ; case maybe_kind of Indirect fun_kind -> go fun_kind Flexi -> defer k } go k@(FunTy arg res) = return (mkNomReflCo k, arg, res) go other = defer other defer k = do { arg_kind <- newMetaKindVar ; res_kind <- newMetaKindVar ; let new_fun = mkFunTy arg_kind res_kind origin = TypeEqOrigin { uo_actual = k , uo_expected = new_fun , uo_thing = Just (ppr hs_ty) , uo_visible = True } ; co <- uType KindLevel origin k new_fun ; return (co, arg_kind, res_kind) } {- ********************************************************************* * * Occurrence checking * * ********************************************************************* -} {- Note [Occurrence checking: look inside kinds] ~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~~ Suppose we are considering unifying (alpha :: *) ~ Int -> (beta :: alpha -> alpha) This may be an error (what is that alpha doing inside beta's kind?), but we must not make the mistake of actuallyy unifying or we'll build an infinite data structure. So when looking for occurrences of alpha in the rhs, we must look in the kinds of type variables that occur there. NB: we may be able to remove the problem via expansion; see Note [Occurs check expansion]. So we have to try that. Note [Checking for foralls] ~~~~~~~~~~~~~~~~~~~~~~~~~~~ Unless we have -XImpredicativeTypes (which is a totally unsupported feature), we do not want to unify alpha ~ (forall a. a->a) -> Int So we look for foralls hidden inside the type, and it's convenient to do that at the same time as the occurs check (which looks for occurrences of alpha). However, it's not just a question of looking for foralls /anywhere/! Consider (alpha :: forall k. k->*) ~ (beta :: forall k. k->*) This is legal; e.g. dependent/should_compile/T11635. We don't want to reject it because of the forall in beta's kind, but (see Note [Occurrence checking: look inside kinds]) we do need to look in beta's kind. So we carry a flag saying if a 'forall' is OK, and sitch the flag on when stepping inside a kind. Why is it OK? Why does it not count as impredicative polymorphism? The reason foralls are bad is because we reply on "seeing" foralls when doing implicit instantiation. But the forall inside the kind is fine. We'll generate a kind equality constraint (forall k. k->*) ~ (forall k. k->*) to check that the kinds of lhs and rhs are compatible. If alpha's kind had instead been (alpha :: kappa) then this kind equality would rightly complain about unifying kappa with (forall k. k->*) -} data OccCheckResult a = OC_OK a | OC_Bad -- Forall or type family | OC_Occurs instance Functor OccCheckResult where fmap = liftM instance Applicative OccCheckResult where pure = OC_OK (<*>) = ap instance Monad OccCheckResult where OC_OK x >>= k = k x OC_Bad >>= _ = OC_Bad OC_Occurs >>= _ = OC_Occurs occCheckForErrors :: DynFlags -> TcTyVar -> Type -> OccCheckResult () -- Just for error-message generation; so we return OccCheckResult -- so the caller can report the right kind of error -- Check whether -- a) the given variable occurs in the given type. -- b) there is a forall in the type (unless we have -XImpredicativeTypes) occCheckForErrors dflags tv ty = case preCheck dflags True tv ty of OC_OK _ -> OC_OK () OC_Bad -> OC_Bad OC_Occurs -> case occCheckExpand [tv] ty of Nothing -> OC_Occurs Just _ -> OC_OK () ---------------- metaTyVarUpdateOK :: DynFlags -> TcTyVar -- tv :: k1 -> TcType -- ty :: k2 -> Maybe TcType -- possibly-expanded ty -- (metaTyFVarUpdateOK tv ty) -- We are about to update the meta-tyvar tv with ty -- Check (a) that tv doesn't occur in ty (occurs check) -- (b) that ty does not have any foralls -- (in the impredicative case), or type functions -- -- We have two possible outcomes: -- (1) Return the type to update the type variable with, -- [we know the update is ok] -- (2) Return Nothing, -- [the update might be dodgy] -- -- Note that "Nothing" does not mean "definite error". For example -- type family F a -- type instance F Int = Int -- consider -- a ~ F a -- This is perfectly reasonable, if we later get a ~ Int. For now, though, -- we return Nothing, leaving it to the later constraint simplifier to -- sort matters out. -- -- See Note [Refactoring hazard: checkTauTvUpdate] metaTyVarUpdateOK dflags tv ty = case preCheck dflags False tv ty of -- False <=> type families not ok -- See Note [Prevent unification with type families] OC_OK _ -> Just ty OC_Bad -> Nothing -- forall or type function OC_Occurs -> occCheckExpand [tv] ty preCheck :: DynFlags -> Bool -> TcTyVar -> TcType -> OccCheckResult () -- A quick check for -- (a) a forall type (unless -XImpredivativeTypes) -- (b) a type family -- (c) an occurrence of the type variable (occurs check) -- -- For (a) and (b) we check only the top level of the type, NOT -- inside the kinds of variables it mentions. But for (c) we do -- look in the kinds of course. preCheck dflags ty_fam_ok tv ty = fast_check ty where details = tcTyVarDetails tv impredicative_ok = canUnifyWithPolyType dflags details ok :: OccCheckResult () ok = OC_OK () fast_check :: TcType -> OccCheckResult () fast_check (TyVarTy tv') | tv == tv' = OC_Occurs | otherwise = fast_check_occ (tyVarKind tv') -- See Note [Occurrence checking: look inside kinds] fast_check (TyConApp tc tys) | bad_tc tc = OC_Bad | otherwise = mapM fast_check tys >> ok fast_check (LitTy {}) = ok fast_check (FunTy a r) = fast_check a >> fast_check r fast_check (AppTy fun arg) = fast_check fun >> fast_check arg fast_check (CastTy ty co) = fast_check ty >> fast_check_co co fast_check (CoercionTy co) = fast_check_co co fast_check (ForAllTy (TvBndr tv' _) ty) | not impredicative_ok = OC_Bad | tv == tv' = ok | otherwise = do { fast_check_occ (tyVarKind tv') ; fast_check_occ ty } -- Under a forall we look only for occurrences of -- the type variable -- For kinds, we only do an occurs check; we do not worry -- about type families or foralls -- See Note [Checking for foralls] fast_check_occ k | tv `elemVarSet` tyCoVarsOfType k = OC_Occurs | otherwise = ok -- For coercions, we are only doing an occurs check here; -- no bother about impredicativity in coercions, as they're -- inferred fast_check_co co | tv `elemVarSet` tyCoVarsOfCo co = OC_Occurs | otherwise = ok bad_tc :: TyCon -> Bool bad_tc tc | not (impredicative_ok || isTauTyCon tc) = True | not (ty_fam_ok || isFamFreeTyCon tc) = True | otherwise = False canUnifyWithPolyType :: DynFlags -> TcTyVarDetails -> Bool canUnifyWithPolyType dflags details = case details of MetaTv { mtv_info = SigTv } -> False MetaTv { mtv_info = TauTv } -> xopt LangExt.ImpredicativeTypes dflags _other -> True -- We can have non-meta tyvars in given constraints