|Version 39 (modified by chak, 10 years ago) (diff)|
Type Functions: Type Checking
Kind checking indexed type families
The workhorse of kind checking type and class declarations is TcTyClDecls.kcTyClDecls, which is invoked by TcTyClDecls.tcTyClDecls once per binding group. It handles type synonyms different from algebraic data type declarations and classes, as synonyms have a richer kind structure (making kind checking harder), but cannot be recursive (which makes kind checking easier). We handle kind signatures (of both type functions and indexed data types) in the same way as algebraic data type declarations. More precisely, kind signatures participate in the construction of the initial kind environment (as performed by getInitialKind).
In contrast, instances of indexed types are not processed by TcTyClDecls.tcTyClDecls, but by TcInstDcls.tcInstDecls1, which handles the heads of class instance declarations. However, the later invokes TcTyClDecls.tcIdxTyInstDecl (both directly and indirectly via IcInstDcls.tcLocalInstDecl1, the later for associated types). The function tcIdxTyInstDecl shares a lot of code with the TcTyClDecls.kcTyClDecls and TcTyClDecls.tcTyClDecl.
Type checking indexed type families
Type checking in the presence of only indexed data and newtypes is much simpler than in the presence of type functions as type equality remains purely syntactic (i.e., we do not need to change the unification procedure). However, we need to check that the alternatives of a case expression inspecting an indexed data type contains only constructors of one member of the family. (To relax this restriction, we would need a story for compiling open data types.)
However, this difference in complexity applies only to the type checking of expression whose types involve indexed data types and type functions, respectively. The type checking of the declaration forms is not that different; in fact, indexed data type declarations require more effort as they introduce data type constructors, which need to behandled as well. However, a lot of machinery can be re-used from vanilla algebraic data types.
Type checking signatures and instances of indexed types
Kind signatures are handled by TcTyClsDecls.tcTyClsDecl together with all other type and class declarations. Within class declarations, we invoke the functions recursively to process associated types.
Instances of indexed types are type checked by TcTyClDecls.tcIdxTyInstDecl; i.e., the same functions that performs their kind checking. Kind checking and type checking of instances of indexed types can be combined, as we don't need to worry as much about recursive dependencies as we have to for standard type declarations. In particular, the kinds of indexed types are declared by their signature and we don't have to compute any recursiveness information, as we never know whether we reached a fixed point for open types. (Hence, we conservatively assume indexed types to be always Recursive. This is safe as they are implicit loop breakers due to to implying coercions.)
Core representation of signatures of indexed families
The function TcTyClsDecls.tcTyClsDecls produces TypeRep.TyThings from type and class declarations. The TyThings produced from the new declaration forms are the following:
- type family
- Type synonym families are represented by the standard TyCon variant for synonyms, namely SynTyCon. They are distinguished from ordinary type synonyms by the value of the field synTcRhs, which is now of a new data type SynTyConRhs, which has a variant OpenSynTyCon resKind to represent families.
- data family and newtype family
- Data and newtype families are represented by the TyCon variant AlgTyCon, as are their non-indexed counter parts, with the difference that the field algTcRhs has the one of the newly introduced values OpenDataTyCon or OpenNewTyCon.
Synonym type constructors: SynTyCon
To represent type families (which do not have a fixed right hand side), the type of synTcRhs changed from Type to SynTyConRhs with
data SynTyConRhs = OpenSynTyCon Kind -- *result* kind | SynonymTyCon Type -- rhs of ordinary synonym
Consequently, all functions that dependent on this field need to be extended. In particular, TcType.isTauTyCon regards applications of type family constructors as tau types, which is why we need to require that the right hand side of each type instance declaration is also a tau type. As a result, BuildTyCls.buildSynTyCon's last argument now also takes a value of type SynTyConRhs.
Classes are represented by Class.Class, which we extend by a new field classATs of type [TyCon]. The Class structures including embedded TyCons for associated types are constructed at the end of declaration type checking by TcTyClsDecls.tcTyClDecl1 by way of BuildTyCl.buildClass.
An additional complication is that the associated types of a class need already be available when type checking the super class context and the method signatures of the same class, or other things in the same type checking knot. Hence, we need to make them available in the temporary environment constructed in the knot tied by TcTyClsDecls.tcTyAndClassDecls. Special care is required as this knot tying relies on the property that the list of declarations, alg_at_decls, and the list of TyThings produced by type checking the declarations, rec_alg_tyclss, match up (for zipping them together within mkGlobalThings). We guarantee this by always entering the associated types of a class right after that class in the declaration list.
An important property of associated types is that their index types always coincide with the class instance arguments at those argument positions that used the same type variables in the associated family declaration. To check that property, each AlgTyCon and each SynTyCon contains a field tyConArgPoss :: Maybe [Int] that has a value of the form Just poss for associated family TyCons, where poss gives the argument position in the class head for each family argument. For example,
class C a b c where data T c b :: * -> *
induces a poss value of [2, 1]. Note how T is 3-ary, but only the first two arguments are type indexes and correspond to the third and second class parameter, respectively.
The GHC API has a new predicate isOpenTyCon with the understanding that it is illegal to invoke synTyConDefn, synTyConRhs, and tyConDataCons on type constructors that fulfil isOpenTyCon.
Core representation of instances of indexed types
Representation of data instances
There are three (inter-linked) aspects to the representation of data/newtype instances: (1) the representation of the TyCon generated from an instance, (2) the representation of the DataCons for the variants of the instance, and the (3) equality axiom connecting the indexed family type with the representation of Item (1).
The TyCon of an instance
When building the TyCon for the representation type of a data instance, we need to derive a new (internal) name for that representation TyCon from the family name. This is done by BuildTyCl.buildAlgTyCon, which gets an additional argument mb_family :: Maybe TyCon that gives the family type constructor if we are building a TyCon for an instance. In that case, buildAlgTyCon generates a new name with the help of newImplicitBinder and fills the new field algTcParent with type
data AlgTyConParent = NoParentTyCon | ClassTyCon Class | FamilyTyCon TyCon -- family tycon [Type] -- instance types TyCon -- representation coercion
which is a generalisation of the old field algTcClass of the internal representation for datatypes, TyCon.AlgTyCon. In contrast to the old algTcClass field, the new field also appears in IfaceSyn.IfaceDecl. However, it does so as Maybe (IfaceTyCon, [IfaceType]) as we still do not want to represent class parent information in interfaces and we only record the family tycon and instance types in interfaces, not the coercion. (The latter is implicitly reconstructed upon loading an interface.) The instance types are the type indexes at which the data constructor has been declared; e.g., given the declaration
data instance Map (a, b) v = MapPair (Map a (Map b v))
the instance types are [(a, b), v].
NB: The type argument variables of the representation tycon are the free variables of the instance types; i.e., the representation data type is an ordinary data type, it is neither indexed nor open. The only give away of its special purpose is the value in algTcParent.
The DataCons of the variants of an instance
DataCons of data instances are not explicitly distinguished from ordinary DataCons. However, they differ by referring to a TyCon and a datacon wrapper that differ from their ordinary form. More specifically, the field algTcParent of the TyCon is of the form FamilyTyCon (famTyCon, instTys, coe), where famTyCon is the TyCon of the data family to which the instance belongs, instTys are the instance types, and coe is the coercion identifying representation type and family instance. This coercion is used by the datacon wrapper whose signature uses the family type, not the representation type.
The coercion identifying family instance and representation type
As each data instance is represented by its own TyCon, we need to be able to move between the type of the family instance and that of the representation. We do so by an adaptation of the same method used to implement newtypes with coercions (c.f., IntermediateTypes). Newtypes store the coercion moving between representation and abstract type in the field nt_co of the NewTyCon variant of TyCon.AlgTyConRhs, whereas representation types for indexed data types use algTcParent (see above). Newtype coercions are constructed by Coercion.mkNewTypeCoercion, whereas representation types for indexed data types use a similar function Coercion.mkDataInstCoercion, which is invoked by BuildTyCl.buildAlgTyCon iff it is passed family and instance type information.
Representation of newtype instances
We handle newtype instances similar to data instances. However, newtypes have no separate worker and wrapper, but only a hybrid that is categorised as a worker (see MkIds.mkDataConIds). In particular, this worker gets the wrapper signature as well as an unfolding. The wrapper signature ensures that the result type of the constructor mentions the family constructor (and not the instance representation constructor). The body of an ordinary newtype applies the newtype coercion to move from abstract to concrete type. In the case of a family instance, we compose the newtype coercion with the family coercion to directly move from the abstract family instance to the concrete type. We don't do the same in the opposite direction - i.e., in MkIds.unwrapNewTypeBody - as computing the right type arguments is more complicated than a simple tycon split. Instead, we use the same mechanism in TcPat.tcConPat as for pattern matching, and hence elimination, of data constructors.
NB: It is necessary to refine the TyCon.isNewTyCon predicate by introducing TyCon.isClosedNewTyCon and using it in all places where the predicate is used to determine whether a newtype can be expanded to its right hand side. In principle, this is also possible for families, but only in dependence on the concrete type arguments (and newtype instances in scope), so it would be much harder to check. Hence, for now, newtype families are opaque.
Representation of equality axioms
Change of plans: The principle representation of an indexed type synonym will actually be a specially tagged version of the SynTyCon variant of TyCon.TyCon (it also has a parent, like in the data case). We won't have an InstInfo for family instances, but we maintain family instance environments similar to class instance environments (using the FamInstEnv.FamInst type). Eventually, this will also contain a rough match for indexed types plus a reference to the full TyCon representation.
Type functions have a number of properties in common with class instances; in particular, they require a machinery for matching type patterns against types, as instance heads do during context simplification. Hence, we probably want some structure similar to InstEnv.Instance for type functions - for instances this is maintained in the field iSpec of TcEnv.InstInfo (for type functions we don't need anything like iBinds as they are pure type-level entities). If possible, it would be ideal if we can reuse (or generalise) some of the matching machinery for instance heads.
The essentials of a module after type checking are in HscTypes.ModGuts; in particular, we have two fields mg_insts :: [Instance] and mg_binds :: [CoreRule] containing all instance heads and all rewrite rules respectively. Similarly, we now want something like mg_tyequa :: [TyEqua] to represent all type equations.
Refined idea: Instead of duplicating the InstInfo/Instance infrastructure for instances of indexed types, we could just add a second variant to InstInfo. This has the advantage that functions, such as tcInstDecls1, still only have to return a list of InstInfo and not two different lists.
Type checking expressions
Pattern matching indexed data types
Pattern matching against data constructors in TcPat.tcConPat implements type refinement in case alternatives for GADTs; i.e., data constructors that have a non-empty dcEqSpec. It might appear that we can reuse that infrastructure for type indexes, but that is unfortunately not possible. The whole point of local type refinement is that the variable instantiations are not propagated outwards, but that is exactly what is required for type indexes. We handle matching against data constructors of data instances by two extensions to tcConPat:
- we generalise TcUnify.boxySplitTyConApp to take type families into account and
- insert an ExprCoFn that is to be applied to the scrutinee in the case of a data constructor of a type family.
Splitting of type constructor applications
The result type of a wrapper of a data constructor of a family mentions the family type constructor, whereas the worker uses an (internal) representation type constructor. So, when pattern matching against such a constructor, the type of the scrutinee will be the family type and we need to use TcUnify.boxySplitTyConApp with that family type, instead of the representation type constructor mentioned in the dcTyCon of the data constructor. We achieve this by the local function boxySplitTyConAppWithFamily that checks for the presence of a type family before invoking boxySplitTyConApp. In addition, we need to adjust the split type constructor arguments to fit the representation type constructor. This is also taken care of by boxySplitTyConAppWithFamily, which matches the family arguments against the instance types using TcUnify.boxyUnifyList.
Coercing the scrutinee
The matching against the family type constructor and unification with the instance types corresponds to applying the coercion moving between the family and representation type of a data instance, which is returned by tyConFamilyCoercion_maybe. To generate type correct core, this coercion needs to be applied to the scrutinee of the case expression matching on the constructor pattern. This is done by the local function unwrapFamInstScrutinee whenever we match against the data constructor of a family by wrapping the result pattern into a CoPat containing an ExprCoFn with the coercion.
Checking for overlapping data/newtype instances
Overlap check of the instances in the currently compiled module
We maintain a family instance environment in the TcRnTypes.TcGblEnv much like that for class instances. We add instances to this environment, with FamInst.addLocalFamInst, as we type check them and perform an overlap check with each addition. This overlap check includes all the instances in the EPS, too - again just like with class instance. Hence, We simultaneously check the instances of the current module against all imported ones, too. (This, of course, requires that we have them all in the EPS at that point.)