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Partial Type Signatures for Haskell
Thomas Winant, Dominique Devriese, Frank Piessens, Tom Schrijvers
In Haskell, programmers have a binary choice between omitting the type signature (and relying on type inference) or explicitly providing the type entirely; there are no intermediate options. Partial type signatures have been often proposed as an intermediate option.
In a partial type signature, annotated types can be mixed with inferred types. A type signature is written like before, but can now contain wildcards, written as underscores. The types of these wildcards or unknown types will be inferred by the type checker, e.g.
foo :: _ -> Bool foo x = not x -- Inferred: Bool -> Bool
We have been working on a design and an implementation of them for Haskell and GHC. We have worked out the interaction with OutsideIn(X) type inference and generalisation in a paper presented at PADL'14 and a technical report with proofs. This document attempts to describe our design and our current implementation from a more practical point of view in the hope to get some feedback from the GHC developers community.
Motivation and discussion
Pragmatics
Before we start, we want to say something about the pragmatics of when and how to use type signatures. Many people have an opinion about when it is appropriate to write type signatures, e.g. we personally tend to always write type signatures for top-level functions but sometimes omit them for local bindings. Sometimes we are a bit more lax in throw-away code or during development.
We emphasise that partial type signatures do not alter such pragmatics. The point is that Haskell already allows a choice between a full signature and no signature at all and all we add is an intermediate technical option: partial signatures. It is still up to the user to choose how much and what kind of type signatures to write for different kinds of definitions. He/she may still want to use partial signatures only for local definitions and/or non-exported (auxiliary) top-level definitions and/or top-level definitions in throw-away code.
Motivation
So why would you want to use a partial type signatures instead of a normal type signature?
- Readability Partial type signature can be useful to improve
the readability or understandability of your types. Some types are
so verbose that they might confuse the programmer. By replacing
distracting boilerplate type information with wildcards, you can put
the focus on the crucial bits of your type and guide users through
your complex types by hiding the less relevant bits.
In the example below, the constraints make the type signature bloated.replaceLoopsRuleP :: (ProductionRule p, EpsProductionRule p, RecProductionRule p qphi r, TokenProductionRule p t, PenaltyProductionRule p) => PenaltyExtendedContextFreeRule qphi r t v -> (forall ix. qphi ix -> p [r ix]) -> (forall ix. qphi ix -> p [r ix]) -> p v
With the following partial type signature, the type becomes less daunting:replaceLoopsRuleP :: _ => PenaltyExtendedContextFreeRule qphi r t v -> (forall ix. qphi ix -> p [r ix]) -> (forall ix. qphi ix -> p [r ix]) -> p v
- Development During development, some parts of the type may
still be uncertain, unknown or prone to change, and/or you just
don't care to annotate them. With a partial type signature, you can
annotate exactly the parts of the type signature you know or want to
annotate and replace the (unknown) bits you want the type inferencer
to figure out for you with underscores (
_
).
Type signatures are very helpful during development, they let the type checker verify that the type of the program you wrote matches the type you wanted it to have. They also provide a machine-checked form of documentation. After a quick glance at the type signature, you instantly know quite a lot about the function you're planning to use and/or forgot the type of, as you wrote it more than an hour ago.
But during development, your functions, and by consequence your types, will often change. Thus, the type signatures have to be updated too, but programmers tend to be lazy, and will just omit the signatures and add them back in the end. Unfortunately, by omitting the type signatures, you lose the valuable advantages described in the previous paragraph. A solution could be to annotate the fixed parts of your signatures and replace the ever-changing parts by wildcards.
- Uninferrable types Some types cannot be inferred, see the
following program (example adapted from
Practical type inference for arbitrary-rank types).
foo x = (x [True, False], x ['a', 'b']) test = foo reverse -- reverse :: forall a. [a] -> [a]
The argument offoo
,x
, is a polymorphic function, making the type offoo
(forall a. [a] -> [a]) -> ([Bool], [Char])
, which is a higher-rank type. Inferring higher-rank types is isomorphic to higher-order unification, which is known to be undecidable. So generally, higher-rank types cannot be inferred. Therefore, the program above will not typecheck.
The program above can typecheck when the higher-rank type is annotated, e.g.foo :: (forall a. [a] -> [a]) -> ([Bool], [Char]) foo x = (x [True, False], x ['a', 'b'])
Unfortunately, we are forced to write a whole type signature, even though only the type of the argument is strictly required to be annotated, the rest could easily be inferred. With a partial type signature, you can annotate just the required bits and leave out the rest to be inferred for you, e.g.foo :: (forall a. [a] -> [a]) -> _ foo x = (x [True, False], x ['a', 'b'])
- Community Feature requests or wiki pages for partial type signatures in some form or other already exist: #5248, PartialTypeSigs, PartialTypeAnnotations. More recently, a question popped up on Stack Overflow asking if there is such a thing as partial type signatures for Haskell. Judging from the comments on our answer, people seemed to be interested. After presenting the paper at PADL'14, people told us they would like to see it in GHC. All this evidence combined makes us believe there is a real community demand for partial type signatures in GHC.
Existing Workarounds
In many situations, the effect of partial signatures can be achieved using other means. Consider for example the following partial signature
foo :: (forall a. [a] -> [a]) -> _
A similar thing can already be done with the ScopedTypeVariables extension, which allows pattern signatures, e.g.
foo (x :: forall a. [a] -> [a]) = (x [True, False], x ['a', 'b'])
A downside to this approach is that the programmer is sprinkling type
hints throughout his or her programs, instead of nicely separating
types from terms with a type signature. It's also not directly clear
how this can be applied to arbitrary parts of a type, e.g. how would
you say something like monadicComputation :: _ Int
etc.
Other workarounds exist as well (see the paper for a discussion). They are typically based on adding computationally useless functions or dead code and we find them all less natural and elegant than our partial signatures.
Our Design
A good way to think of a partial type signature is as follows. If a function has a type signature, GHC checks that it has exactly that type. But if it has a partial type signature GHC proceeds exactly as if it were inferring the type for the function (especially including generalisation), except that it additionally forces the function's type to have the shape given by the partial type signature.
We now describe the syntax and the semantics of our partial type signatures.
Type Wildcards
A (partial) type signature has the following form:
forall a b .. . (C1, C2, ..) => tau
It consists of three parts:
- The type variables:
a b ..
- The constraints:
(C1, C2, ..)
- The (mono)type:
tau
We call wildcards occurring within the monotype (tau
) part of the
type signature type wildcards. Type wildcards can be instantiated
to any monotype like Bool
or Maybe [Bool]
, e.g.
not' :: Bool -> _ not' x = not x -- Inferred: Bool -> Bool maybools :: _ maybools = Just [True] -- Inferred: Maybe [Bool]
Wildcards can unify with function types, e.g.
qux :: Int -> _ qux i b = i == i && b -- Inferred: Int -> Bool -> Bool
Additionally, when they are not instantiated to a monotype, they will be generalised over, e.g.
bar :: _ -> _ bar x = x -- Inferred: forall a. a -> a bar2 :: _ -> _ -> _ bar2 x f = f x -- Inferred: forall a b. a -> (a -> b) -> b
Each wildcard will be independently instantiated (see
Named wildcards for dependent instantiation), e.g.
the three wildcards in bar2
are each instantiated to a different
type.
As type wildcards can be generalised over, additional type variables
can be universally quantified. One should expect an implicit
'wildcard' in the forall
part of the type signature, e.g.
bar3 :: forall a. a -> (a -> _) -> _ bar3 x f = f x -- Inferred: forall a b. a -> (a -> b) -> b
In addition to the explicitly quantified type variable a
, the
inferred type now contains a new type variable b
. As type variables
are implicitly universally quantified in Haskell, we chose not to make
this kind of forall
'wildcard' explicit.
Wildcards can also unify with annotated type variables, e.g.
filter' :: _ -> [a] -> [a] filter' = filter -- Inferred: forall a. (a -> Bool) -> [a] -> [a] -- Same as the type of filter
As wildcards can unify with functions, just one type wildcard is enough to infer the whole type of a function of any arity (albeit without constraints).
filter'' :: _ filter'' = filter -- Inferred: forall a. (a -> Bool) -> [a] -> [a] -- Same as the type of filter and filter'
And type-constructors, e.g.
justify :: a -> _ a justify = Just -- Inferred: forall a. a -> Maybe a tupleIt :: a -> _ a a tupleIt x = (x, x) -- Inferred: forall a. a -> (a, a) nestedTCs :: a -> _ (_ (_ _ _)) nestedTCs = Just . (: []) . Left -- Inferred: forall a b. a -> Maybe [Either a b]
Constraint Wildcards
NOTE: we no longer intend to support constraint wildcards as described below. Only named wildcards also occurring in monotype and an extra-constraints wildcard will be allowed.
SLPJ I'm honestly not sure it's worth the complexity you have here. The power to weight ratio seems poor. I'd drop constraint wildcards, and implement only "extra constraint" wildcards. End SLPJ
thomasw Seems reasonable to us. This certainly makes things easier. End thomasw
We call wildcards occurring within a constraint (inside a C
in (C1, C2, ..)
)
constraint wildcards, e.g.
fstIsBool :: (Bool, _) ~ a => a -> Bool fstIsBool (b1, b2) = not b1 && b2 -- Inferred: (Bool, Bool) -> Bool class Two a b | a -> b where one :: a -> a two :: b -> b -- Ignore the second parameter of the typeclass secondParam :: Two a _ => a -> a secondParam x = one x -- Inferred type: forall a b. Two a b -> a -> a
GHC's constraint solver doesn't unify constraints with each other.
E.g. Eq _
or _ a
will never be unified with Eq a
. The problem
the constraint solver is faced with is "deduce Eq a
from Eq _
,
figuring out what the _
should be instantiated to". Or, worse,
"deduce Eq a
from _ a
" or something even less constrained. The
constraint solver is absolutely not set up to figure out how to fill
in existential variables in the "givens".
So the following program will not work:
-- Neither partial type signature will work impossible :: Eq _ => a -> a -> Bool impossible :: _ a => a -> a -> Bool impossible x y = x == y -- Actual type: forall a. Eq a => a -> a -> Bool
Note that constraints are not unified for good reasons. One immediate problem is already that it could lead to ambiguities, consider for instance the following program.
-- Incorrect partial type signature ambi :: _ a => a -> String ambi x = show (succ x) ++ show (x == x) -- Actual type: -- forall a. (Enum a, Eq a, Show a) => a -> String
As constraints are unordered, the constraint solver wouldn't know
which one of the inferred constraints (Enum a, Eq a, Show a)
the
partially annotated constraint (_ a)
should be unified with, it
would have to guess. Regardless of whether constraints are unified,
this program would have been rejected anyway, as only one constraint
is partially annotated instead of all three.
Extra-constraints Wildcard
A third kind of wildcard we propose is the extra-constraints
wildcard, not to be confused with a constraint wildcard. Whereas
constraint wildcards occur inside the C
s in the constraints part
(C1, C2, ..)
of a partial type signature, an extra-constraints
wildcard occurs as a C
inside the constraints part.
The presence of an extra-constraints wildcard indicates that an arbitrary number of extra constraints may be inferred during type checking and will be added to the type signature. In the example below, the extra-constraints wildcard is used to infer three extra constraints.
arbitCs :: _ => a -> String arbitCs x = show (succ x) ++ show (x == x) -- Inferred: -- forall a. (Show a, Enum a, Eq a) => a -> String
An extra-constraints wildcard shouldn't prevent the programmer from already listing the constraints he knows or wants to annotate, e.g.
-- Also a correct partial type signature: arbitCs' :: (Enum a, _) => a -> String arbitCs' = arbitCs -- Inferred: -- forall a. (Enum a, Show a, Eq a) => a -> String
An extra-constraints wildcard can also lead to zero extra constraints to be inferred, e.g.
noCs :: _ => String noCs = "noCs" -- Inferred: String
As a single extra-constraints wildcard is enough to infer any number of constraints, only one is allowed in a type signature and it should come last in the list of constraints.
Named Wildcards
A fourth and final kind of wildcard we propose is the named wildcard. A named wildcard is a wildcard suffixed with an identifier. All occurrences of the same named wildcard within one type signature will unify to the same type. They are particularly useful to express constraints on unknown types, e.g.
somethingShowable :: Show _x => _x -> _ somethingShowable x = show x -- Inferred type: Show x => x -> String somethingShowable' :: Show _x => _x -> _ somethingShowable' x = show (not x) -- Inferred type: Bool -> String
Named wildcards should not be confused with type variables. Even though syntactically similar, named wildcards can unify with concrete types as well as be generalised over (and behave as type variables).
In the first example above, _x
is generalised over (and is
effectively replaced by a fresh type variable). In the second example,
_x
is unified with the Bool
type, and as Bool
implements the
Show
typeclass, the constraint Show Bool
can be simplified away.
Currently, a named wildcard is in scope in the type signature where it appears, but also in signatures in the right-hand side of the implementation. See the issues section for more discussion.
Holes
Previously, underscores in types were disallowed by GHC and Haskell 2010, so to remain backwards compatible, wildcards or 'holes in types' should still result in errors. However, the generated error messages can now be much more informative, i.e. they should inform the user of the type each wildcard/hole was instantiated to. As this does not change the set of accepted programs nor the behaviour of accepted programs, this doesn't have to be an extension (similar to TypedHoles).
Furthermore, when the user enables the PartialTypeSignatures extension, the errors are not reported anymore, the inferred type is simply used.
However, named wildcards (_a
) are currently parsed as type
variables. To also remain compatible on this front, we propose to
introduce a separate extension, NamedWildcards.
When this extension is enabled, a type variable like _a
will be
parsed as a named wildcard.
To summarise, the four different cases, depending on the enabled extensions:
PartialTypeSignatures OFF | PartialTypeSignatures ON | |
---|---|---|
NamedWildcards OFF | Informative errors are reported for hole instantiations, but only for unnamed wildcards. Named wildcards are still parsed as type variables, as before. | The types of unnamed wildcards are inferred and used. Named wildcards are still parsed as type variables. |
NamedWildcards ON | Informative errors are reported for hole instantiations, both for unnamed and named wildcards. | The types of both unnamed and named wildcards are inferred and used. |
Along with informative errors, we also suggest the user to turn on the PartialTypeSignatures extension.
Let's demonstrate the described behaviour with an example. An example program:
module Example where foo :: (Show _a, _) => _a -> _ foo x = show (succ x)
Compiled with a prior version of GHC gives:
Example.hs:3:18: parse error on input ‘_’
When compiled with a version of GHC that implements the proposal:
Example.hs:3:18: Instantiated extra-constraints wildcard ‘_’ to: (Enum _a) in the type signature for foo :: (Show _a, _) => _a -> _ at Example.hs:3:8-30 The complete inferred type is: foo :: forall _a. (Show _a, Enum _a) => _a -> String To use the inferred type, enable PartialTypeSignatures Example.hs:3:30: Instantiated wildcard ‘_’ to: String in the type signature for foo :: (Show _a, _) => _a -> _ at Example.hs:3:8-30 The complete inferred type is: foo :: forall _a. (Show _a, Enum _a) => _a -> String To use the inferred type, enable PartialTypeSignatures
Now the types the wildcards were instantiated to are reported. Note
that _a
is still treated as a type variable, as prescribed in
Haskell 2010. To treat it as a named wildcard, enable the
NamedWildcards extension to
get:
[..] Example.hs:3:24: Instantiated wildcard ‘_a’ to: tw_a in the type signature for foo :: (Show _a, _) => _a -> _ at Example.hs:3:8-30 The complete inferred type is: foo :: forall tw_a. (Show tw_a, Enum tw_a) => tw_a -> String To use the inferred type, enable PartialTypeSignatures [..]
An extra error message appears, reporting that _a
was instantiated to a new
type variable (tw_a
).
Finally, when the PartialTypeSignatures extension is enabled, the typechecker just uses the inferred types for the wildcards and compiles the program without generating any messages.
It would be nice to eventually have Agda-style hole/goal-driven development. In the future, we will look into extending the GHC API and we will try to hack together a prototype for Emacs.
Local Definitions
With the introduction of OutsideIn(X), the GADTs extension and the TypeFamilies extension, trigger the MonoLocalBinds flag. When it is enabled, types of local bindings without a signature no longer get generalised as described in OutsideIn(X).
For the same reasons, we intend to perform no generalisation over wildcards in partial type signatures for local bindings, e.g.
monoLoc :: forall a. a -> ((a, Bool), (a, Char)) monoLoc x = let g :: _ -> _ g y = (x, y) in (g True, g 'v')
When MonoLocalBinds is
disabled, the program should work with or without the partial type
signature. But when the MonoLocalBinds
extension is enabled, it should no longer typecheck, as
the type of g
is no longer generalised, again with or without the
partial type signature.
GHC is slightly more liberal than the strict rule described in the OutsideIn(X) paper though. As explained in Let generalisation in GHC 7.0, even with the MonoLocalBinds extension enabled, a local binding without a type signature will still be generalised when all its free variables are closed. Translating this to partial type signatures: the following example should type check, as it does without a type signature.
safeLoc :: (Bool, Char) safeLoc = let f :: _ -> _ f x = x in (f True, f 'v')
Furthermore, we believe it necessary to disallow extra-constraints wildcards in partial type signatures for local bindings, as the generalisation over constraints is exactly what led to let should not be generalised.
All of this is currently not yet fully implemented. We have also not yet worked out what we should do precisely if MonoLocalBinds is not enabled, although our intention is to try and align as closely as possible to the generalisation that happens in the absence of a type signature.
Partial Expression and Pattern Signatures
Wildcards should be allowed in expression and pattern signatures, e.g.
bar1 :: _a -> Bool bar1 x = (x :: _a) -- Inferred: Bool -> Bool bar2 :: Bool -> _a bar2 (x :: _a) = x -- Inferred: Bool -> Bool
We do not intend to support an extra-constraints wildcard in such signatures, as the implementation difficulties it poses don't outweigh its usefulness.
Wildcards occurring in a partial type signature are currently quantified in their type signature, unless they (being named wildcards) were already brought into scope by another partial type signature. The question now is: where should wildcards occurring in partial expression or pattern signatures be quantified? There a number of options. Remember: we're only talking about wildcards that aren't already in scope, and as unnamed wildcards can never already be in scope, this question only concerns named wildcards (of course, the NamedWildcards extension is turned on in the examples below).
- Quantify wildcards in the partial expression or pattern
signature they appear in. Consider the following example:
f :: _ f x y = let p :: _ p = (x :: _a) q :: _ q = (y :: _a) in (p, q) -- Inferred: -- f :: forall tw_a tw_a1. tw_a -> tw_a1 -> (tw_a, tw_a1) -- p :: tw_a -- q :: tw_a1
Both times, the_a
in the expression signature isn't in scope, so it is quantified once in each expression signature. This means that the two occurrences of_a
don't refer to the same named wildcard. Still, this can be achieved by mentioning_a
in a type signature (where_a
will then be quantified) of a common higher-level binding:f :: _a -> _ f x y = let p :: _ p = (x :: _a) q :: _ q = (y :: _a) in (p, q) -- Inferred: -- f :: forall tw_a. tw_a -> tw_a -> (tw_a, tw_a) -- p :: tw_a -- q :: tw_a
Note that the first example is equivalent to the following program (changingf
's partial type signature will also cause the same change as in the example above):f :: _ f x y = let p :: _a p = x q :: _a q = y in (p, q)
The named wildcards quantified in a partial expression or pattern signature will be in scope in the expression or pattern to which the signature was attached:foo = (\(x :: _a, y) -> y) :: _ -> _a -- Inferred: forall tw_a . (tw_a, tw_a) -> tw_a
Overall, this solution is the simplest, also to implement, and has a good power-to-weight ratio. However, what happens in the following examples might be counter-intuitive to some users:baz1 x y = (x :: _a, y :: _a) baz2 (x :: _a) (y :: _a) = (x, y) -- Inferred for both: -- forall tw_a tw_a1. tw_a -> tw_a1 -> (tw_a, tw_a1)
In the examples above, every time an_a
occurs,_a
isn't yet in scope, and is thus quantified in each expression/pattern signature separately. Therefore, all occurrences of_a
are distinct. This might be perceived counter-intuitive. Again, both occurrences in each binding can be made to refer to the same named wildcard by mentioning_a
in a signature common to both expression signatures, e.g. by mentioning it in the type signature ofbaz1
andbaz2
.
- Quantify wildcards in the type signature of the innermost enclosing binding.
The first example of option 1 will behave exactly the same:
f :: _ f x y = let p :: _ p = (x :: _a) q :: _ q = (y :: _a) in (p, q) -- Inferred: -- f :: forall tw_a tw_a1. tw_a -> tw_a1 -> (tw_a, tw_a1) -- p :: tw_a -- q :: tw_a1
Contrary to option 1, the last example will behave more intuitively:baz1 x y = (x :: _a, y :: _a) baz2 (x :: _a) (y :: _a) = (x, y) -- Inferred for both: -- forall tw_a. tw_a -> tw_a -> (tw_a, tw_a)
Inbaz1
andbaz2
, both occurrences of_a
will refer to the same named wildcard.
However, what if there's no enclosing binding with a type signature, like in
baz1
andbaz2
? Quantifying the wildcards in the binding itself could solve this, but makes the implementation more complex.
Another downside has to do with the implementation. This option will require an extra renaming pass over the body of a binding that will extract the wildcards from the expression signatures to store them together with the wildcards mentioned in the type signature.
An alternative is an invasive refactoring of the functions that deal with renaming the bodies of a binding. It would involve threading a list of extracted wildcards through these functions. A lot more code (certainly more than we feel comfortable touching) would have to be touched to implement this.
- Quantify wildcards in the type signature of the top-level enclosing binding.
This option changes the behaviour of the first example of options 1
and 2, both occurrences of
_a
will refer to the same named wildcard.f :: _ f x y = let p :: _ p = (x :: _a) q :: _ q = (y :: _a) in (p, q) -- Inferred: -- f :: forall tw_a. tw_a -> tw_a -> (tw_a, tw_a) -- p :: tw_a -- q :: tw_a
Consider the following example:foo o = let f :: (_a, _) -> _a f (u, _) = not u g (x :: _a) (xs :: [_a]) = x : xs in g (f o) [] -- Inferred: -- foo :: forall a. (Bool, a) -> [Bool] -- f :: forall b. (Bool, b) -> Bool -- g :: Bool -> [Bool] -> [Bool]
Is it intuitive in the example above that all occurrences of
_a
refer to the same named wildcard? What ifg
didn't have pattern signatures, but the partial type signatureg :: _a -> [_a] -> _
? Does it still make that much sense?
Besides the difference in scoping, this option is very similar to option 2. It shares its downsides as well.
Except for the possibly counter-intuitive behaviour in the baz1
and
baz2
examples, we believe that option 1 is preferable.
Formalisation
We worked out a rigorous formalisation of partial type signatures including typing rules, extending the existing formalisation of GHC's type inference system, OutsideIn(X) (as described in OutsideIn(X): Modular type inference with local assumptions). Additionally, we proved soundness of our new typing rules.
We mentioned before that a single type wildcard is enough to infer any
type, albeit without constraints. When we combine this with the fact
that the presence of a single extra-constraints wildcard is enough to
infer any number of constraints, one can see that the partial type
signature _ => _
is the same as omitting the type signature and
relying completely on type inference. We formulated this, i.e. that _ => _
is equivalent to omitting the type signature, as a theorem and proved
it. We also showed that on non-partial type signatures, our new rules
have the same effect as the old rules.
See the technical report for more details.
Implementation
We implemented a subset of our proposal as a branch of GHC (master), available at github. This version can be compiled and should type check a large number of examples in this proposal.
Here is a summary of the changes we have made in the implementation:
- We have extended the
HsSyn
representation of Haskell code with two new forms of types:HsWildcardTy
for anonymous_
types andHsNamedWildcardTy
for named wildcards_a
. - The parser has been modified to parse them if the appropriate extensions are enabled.
- The renamer: when renaming
TypeSig
s, we do a pass over the annotated type signature. We replace named wildcard types with normal type variables but collect and store them as being existentially quantified at the level ofTypeSig
. In the process, we do the same for anonymous wildcards, replacing them with existentially quantified anonymous type variables. - In the type checker, in
tcTySig
, we create new flexible meta-variables for the wildcards and add them to the type variable environment and store them in the returnedsig_fun
to get them brought in scope when checking the RHSs. - In
tcPolyBinds
, we introduce a new "Generalisation Plan" calledWcGen
which is used when there is only one funbind in a group of bindings and its signature contains wildcards. This binding is treated by a new function calledtcPolyCombi
, which applies our generalisation rules. - The changes in
tcPolyCombi
are accompanied by corresponding changes inmkExport
for quantifying over the correct set of type variables.
The two last steps are not yet satisfactory. Most importantly, we do
not yet distinguish between local binds and top-level binds. What we
think is necessary is to make two versions of tcPolyCombi
: one for
local binds and one for top-level binds.
Monomorphism restriction
Regarding the monomorphism restriction, the existing rules apply. Declarations with a partial type signature are treated as declarations without a type signature. Therefore, these declarations will be restricted, and constrained type variables of such declarations may not be generalised over, and thus defaulting will occur when possible.
We illustrate this behaviour with some examples:
-- Remember: the principal type of 3 is forall a. Num a => a alpha :: _ alpha = 3 -- with MR on, the type variable is restricted and defaults to Integer -- with MR off, generalise over _, error: no instance for (Num _) bravo :: _ => _ bravo = 3 -- with MR on, the type variable is restricted and defaults to Integer -- with MR off, type: forall a. Num a => a charlie :: _ => a charlie = 3 -- with MR on, type variable is annotated and thus unrestricted, type: forall a. Num a => a -- with MR off, type: forall a. Num a => a
The last example (with the monomorphism restriction) on, charlie
,
might be surprising. As a
is a generalised type variable that is
already annotated, we don't have to generalise over it anymore. The
monomorphism restriction simply doesn't apply.
Questions and issues
- Constraint wildcards:
NOTE: we no longer intend to support constraint wildcards.
Only named wildcards also occurring in monotype
and an extra-constraints wildcard
will be allowed. The examples below demonstrating the named wildcard
in the constraints look useful to us (and already work in the
implementation).
somethingShowable :: Show _x => _x -> _ somethingShowable x = show x -- Inferred type: Show x => x -> String somethingShowable' :: Show _x => _x -> _ somethingShowable' x = show (not x) -- Inferred type: Bool -> String
- The scope of named wildcards:
We currently treat all named wildcards as scoped type variables,
i.e. if we mention a named wildcard in a top-level partial type
signature, then it can also be mentioned in local bindings and it
will refer to the same type variable. This means, for example,
that the following example won't work:
test2 :: _a -> _a test2 x = let y :: _a y = (x,x) in fst y
The problem is that we will get a constraint_a ~ (_a, _a)
, and we will get an error about not being able to construct the infinite type_a
. If_a
were not scoped, then the inner_a
could be unified with(_a', _a')
where_a'
is the outer_a
and everything would work.
A remaining question here is if we should treat named wildcards as scoped only if the ScopedTypeVariables extension is enabled. Our understanding is that not treating type variables as scoped is only done for backwards compatibility, so there seems little point in doing it for named wildcards?
- Local definitions: no generalisation and no extra constraints wildcards in partial type signatures for local definitions, are we too strict? What when NoMonoLocalBinds is turned on in conjunction with GADTs or TypeFamilies?
- Generally, we are interested in any problems you may find in this design: major problems or small corner cases that we didn't think of or look at yet, etc.
Some detailed notes
- Generalising over equality constraints? Consider the following
example:
anyTypeThatIsBool :: _ => a anyTypeThatIsBool = True
A question that we have considered is whether one would like this to type-check. Note that it can be typed asanyTypeThatIsBool :: a ~ Bool => a anyTypeThatIsBool = True
We currently do not infer this kind of equality constraints (even when there is an extra constraints wildcard): technically,a
will be instantiated to a skolem type variable and an equality for such a variable will be considered absurd, similarly to a constraint likeInt ~ Bool
. As a result, it will not be generalised over. Note that if we were to allow inferring this kind of constraints, then any universally quantified type variable would behave as a wildcard in the presence of an extra constraints wildcard.
Note however that this is only the case for equality constraints that directly apply to universally quantified type variables. For example, the following does work:type family F a data Proxy a = Proxy a anyTypeWhoseFIsBool :: _ => Proxy a -> F a anyTypeWhoseFIsBool _ = True
This will type-check fine and the constraintF a ~ Bool
will be happily inferred. Unlikea ~ Bool
, it is not considered absurd since it does not directly apply to a universally quantified type variable.
- Disallow other uses: partial type signatures should not be allowed in every case a type (signature) is needed, for instance in type class definitions, data type definitions, foreign declarations, type synonyms, associated type instantiations, ... Our implementation currently checks for these cases, but we might have missed one. We believe that in nearly every case but value bindings, partial type signatures (or types containing wildcards) should be disallowed. However, we think they should be admissible in InstanceSigs (not yet implemented).
- Extra-constraints wildcard position: We only allow one
extra-constraints wildcard in a signature: at the outer
quantification of the signature. Consider for example the function
multiCs
:multiCs x = show (succ x) ++ show (x == x)
GHC infers the type(Show a, Enum a, Eq a) => a -> String
for it, but the type signature provided below is also valid (with the RankNTypes extension enabled).multiCs :: (Show a) => a -> (Enum a, Eq a) => String
We currently only allow one extra-constraints wildcard, in the outermost set of constraints. Otherwise, we might get ambiguous situations like this:multiCs :: (Show a, _) => a -> (Enum a, _) => String
- Higher-rank types: Consider the
following partial type signature:
forall a. a -> (forall b. (b, _c) -> b) -> Int
We believe that generalising over the_c
named wildcard should lead to a top-level quantification (wherea
is quantified) of the resulting type variable:forall a tw_c. a -> (forall b. (b, tw_c) -> b) -> Int
We will never infer a quantification in the nested quantification (whereb
is quantified):forall a. a -> (forall b tw_c. (b, tw_c) -> b) -> Int
The latter is equivalent to inferring higher-rank types, which, as we mentioned before, is not something we can do.
Additionally, we do not allow an extra-constraints wildcard in a nested 'forall', e.g.f :: (forall a. _ => a -> a) -> b -> b