Struct rustc_infer::infer::InferCtxt[−][src]

pub struct InferCtxt<'a, 'tcx> {
Show 14 fields
    pub tcx: TyCtxt<'tcx>,
    pub defining_use_anchor: LocalDefId,
    pub in_progress_typeck_results: Option<&'a RefCell<TypeckResults<'tcx>>>,
    pub inner: RefCell<InferCtxtInner<'tcx>>,
    skip_leak_check: Cell<bool>,
    lexical_region_resolutions: RefCell<Option<LexicalRegionResolutions<'tcx>>>,
    pub selection_cache: SelectionCache<'tcx>,
    pub evaluation_cache: EvaluationCache<'tcx>,
    pub reported_trait_errors: RefCell<FxHashMap<Span, Vec<Predicate<'tcx>>>>,
    pub reported_closure_mismatch: RefCell<FxHashSet<(Span, Option<Span>)>>,
    tainted_by_errors_flag: Cell<bool>,
    err_count_on_creation: usize,
    in_snapshot: Cell<bool>,
    universe: Cell<UniverseIndex>,

}

Fields

tcx: TyCtxt<'tcx>defining_use_anchor: LocalDefId

The DefId of the item in whose context we are performing inference or typeck. It is used to check whether an opaque type use is a defining use.

in_progress_typeck_results: Option<&'a RefCell<TypeckResults<'tcx>>>

During type-checking/inference of a body, in_progress_typeck_results contains a reference to the typeck results being built up, which are used for reading closure kinds/signatures as they are inferred, and for error reporting logic to read arbitrary node types.

inner: RefCell<InferCtxtInner<'tcx>>skip_leak_check: Cell<bool>

If set, this flag causes us to skip the ‘leak check’ during higher-ranked subtyping operations. This flag is a temporary one used to manage the removal of the leak-check: for the time being, we still run the leak-check, but we issue warnings. This flag can only be set to true when entering a snapshot.

lexical_region_resolutions: RefCell<Option<LexicalRegionResolutions<'tcx>>>

Once region inference is done, the values for each variable.

selection_cache: SelectionCache<'tcx>

Caches the results of trait selection. This cache is used for things that have to do with the parameters in scope.

evaluation_cache: EvaluationCache<'tcx>

Caches the results of trait evaluation.

reported_trait_errors: RefCell<FxHashMap<Span, Vec<Predicate<'tcx>>>>

the set of predicates on which errors have been reported, to avoid reporting the same error twice.

reported_closure_mismatch: RefCell<FxHashSet<(Span, Option<Span>)>>tainted_by_errors_flag: Cell<bool>

When an error occurs, we want to avoid reporting “derived” errors that are due to this original failure. Normally, we handle this with the err_count_on_creation count, which basically just tracks how many errors were reported when we started type-checking a fn and checks to see if any new errors have been reported since then. Not great, but it works.

However, when errors originated in other passes – notably resolve – this heuristic breaks down. Therefore, we have this auxiliary flag that one can set whenever one creates a type-error that is due to an error in a prior pass.

Don’t read this flag directly, call is_tainted_by_errors() and set_tainted_by_errors().

err_count_on_creation: usize

Track how many errors were reported when this infcx is created. If the number of errors increases, that’s also a sign (line tained_by_errors) to avoid reporting certain kinds of errors.

in_snapshot: Cell<bool>

This flag is true while there is an active snapshot.

universe: Cell<UniverseIndex>

What is the innermost universe we have created? Starts out as UniverseIndex::root() but grows from there as we enter universal quantifiers.

N.B., at present, we exclude the universal quantifiers on the item we are type-checking, and just consider those names as part of the root universe. So this would only get incremented when we enter into a higher-ranked (for<..>) type or trait bound.

Implementations

Canonicalizes a query value V. When we canonicalize a query, we not only canonicalize unbound inference variables, but we also replace all free regions whatsoever. So for example a query like T: Trait<'static> would be canonicalized to

T: Trait<'?0>

with a mapping M that maps '?0 to 'static.

To get a good understanding of what is happening here, check out the chapter in the rustc dev guide.

Canonicalizes a query response V. When we canonicalize a query response, we only canonicalize unbound inference variables, and we leave other free regions alone. So, continuing with the example from canonicalize_query, if there was an input query T: Trait<'static>, it would have been canonicalized to

T: Trait<'?0>

with a mapping M that maps '?0 to 'static. But if we found that there exists only one possible impl of Trait, and it looks like

impl<T> Trait<'static> for T { .. }

then we would prepare a query result R that (among other things) includes a mapping to '?0 := 'static. When canonicalizing this query result R, we would leave this reference to 'static alone.

To get a good understanding of what is happening here, check out the chapter in the rustc dev guide.

A variant of canonicalize_query that does not canonicalize 'static. This is useful when the query implementation can perform more efficient handling of 'static regions (e.g. trait evaluation).

This method is meant to be invoked as the final step of a canonical query implementation. It is given:

  • the instantiated variables inference_vars created from the query key
  • the result answer of the query
  • a fulfillment context fulfill_cx that may contain various obligations which have yet to be proven.

Given this, the function will process the obligations pending in fulfill_cx:

  • If all the obligations can be proven successfully, it will package up any resulting region obligations (extracted from infcx) along with the fully resolved value answer into a query result (which is then itself canonicalized).
  • If some obligations can be neither proven nor disproven, then the same thing happens, but the resulting query is marked as ambiguous.
  • Finally, if any of the obligations result in a hard error, then Err(NoSolution) is returned.

A version of make_canonicalized_query_response that does not pack in obligations, for contexts that want to drop pending obligations instead of treating them as an ambiguity (e.g. typeck “probing” contexts).

If you DO want to keep track of pending obligations (which include all region obligations, so this includes all cases that care about regions) with this function, you have to do it yourself, by e.g., having them be a part of the answer.

Helper for make_canonicalized_query_response that does everything up until the final canonicalization.

Given the (canonicalized) result to a canonical query, instantiates the result so it can be used, plugging in the values from the canonical query. (Note that the result may have been ambiguous; you should check the certainty level of the query before applying this function.)

To get a good understanding of what is happening here, check out the chapter in the rustc dev guide.

An alternative to instantiate_query_response_and_region_obligations that is more efficient for NLL. NLL is a bit more advanced in the “transition to chalk” than the rest of the compiler. During the NLL type check, all of the “processing” of types and things happens in queries – the NLL checker itself is only interested in the region obligations ('a: 'b or T: 'b) that come out of these queries, which it wants to convert into MIR-based constraints and solve. Therefore, it is most convenient for the NLL Type Checker to directly consume the QueryOutlivesConstraint values that arise from doing a query. This is contrast to other parts of the compiler, which would prefer for those QueryOutlivesConstraint to be converted into the older infcx-style constraints (e.g., calls to sub_regions or register_region_obligation).

Therefore, instantiate_nll_query_response_and_region_obligations performs the same basic operations as instantiate_query_response_and_region_obligations but it returns its result differently:

  • It creates a substitution S that maps from the original query variables to the values computed in the query result. If any errors arise, they are propagated back as an Err result.
  • In the case of a successful substitution, we will append QueryOutlivesConstraint values onto the output_query_region_constraints vector for the solver to use (if an error arises, some values may also be pushed, but they should be ignored).
  • It can happen (though it rarely does currently) that equating types and things will give rise to subobligations that must be processed. In this case, those subobligations are propagated back in the return value.
  • Finally, the query result (of type R) is propagated back, after applying the substitution S.

Given the original values and the (canonicalized) result from computing a query, returns a substitution that can be applied to the query result to convert the result back into the original namespace.

The substitution also comes accompanied with subobligations that arose from unification; these might occur if (for example) we are doing lazy normalization and the value assigned to a type variable is unified with an unnormalized projection.

Given the original values and the (canonicalized) result from computing a query, returns a guess at a substitution that can be applied to the query result to convert the result back into the original namespace. This is called a guess because it uses a quick heuristic to find the values for each canonical variable; if that quick heuristic fails, then we will instantiate fresh inference variables for each canonical variable instead. Therefore, the result of this method must be properly unified

Given a “guess” at the values for the canonical variables in the input, try to unify with the actual values found in the query result. Often, but not always, this is a no-op, because we already found the mapping in the “guessing” step.

See also: query_response_substitution_guess

Converts the region constraints resulting from a query into an iterator of obligations.

Given two sets of values for the same set of canonical variables, unify them. The second set is produced lazily by supplying indices from the first set.

Creates a substitution S for the canonical value with fresh inference variables and applies it to the canonical value. Returns both the instantiated result and the substitution S.

This is only meant to be invoked as part of constructing an inference context at the start of a query (see InferCtxtBuilder::enter_with_canonical). It basically brings the canonical value “into scope” within your new infcx.

At the end of processing, the substitution S (once canonicalized) then represents the values that you computed for each of the canonical inputs to your query.

Given the “infos” about the canonical variables from some canonical, creates fresh variables with the same characteristics (see instantiate_canonical_var for details). You can then use substitute to instantiate the canonical variable with these inference variables.

Given the “info” about a canonical variable, creates a fresh variable for it. If this is an existentially quantified variable, then you’ll get a new inference variable; if it is a universally quantified variable, you get a placeholder.

Unifies the const variable target_vid with the given constant.

This also tests if the given const ct contains an inference variable which was previously unioned with target_vid. If this is the case, inferring target_vid to ct would result in an infinite type as we continuously replace an inference variable in ct with ct itself.

This is especially important as unevaluated consts use their parents generics. They therefore often contain unused substs, making these errors far more likely.

A good example of this is the following:

#![feature(generic_const_exprs)]

fn bind<const N: usize>(value: [u8; N]) -> [u8; 3 + 4] {
    todo!()
}

fn main() {
    let mut arr = Default::default();
    arr = bind(arr);
}

Here 3 + 4 ends up as ConstKind::Unevaluated which uses the generics of fn bind (meaning that its substs contain N).

bind(arr) now infers that the type of arr must be [u8; N]. The assignment arr = bind(arr) now tries to equate N with 3 + 4.

As 3 + 4 contains N in its substs, this must not succeed.

See src/test/ui/const-generics/occurs-check/ for more examples where this is relevant.

Extracts data used by diagnostic for either types or constants which were stuck during inference.

If the FnSig for the method call can be found and type arguments are identified as needed, suggest annotating the call, otherwise point out the resulting type of the call.

Adds a note if the types come from similarly named crates

Given that other_ty is the same as a type argument for name in sub, populate value highlighting name and every type argument that isn’t at pos (which is other_ty), and populate other_value with other_ty.

Foo<Bar<Qux>>
^^^^--------^ this is highlighted
|   |
|   this type argument is exactly the same as the other type, not highlighted
this is highlighted
Bar<Qux>
-------- this type is the same as a type argument in the other type, not highlighted

If other_ty is the same as a type argument present in sub, highlight path in t1_out, as that is the difference to the other type.

For the following code:

let x: Foo<Bar<Qux>> = foo::<Bar<Qux>>();

The type error output will behave in the following way:

Foo<Bar<Qux>>
^^^^--------^ this is highlighted
|   |
|   this type argument is exactly the same as the other type, not highlighted
this is highlighted
Bar<Qux>
-------- this type is the same as a type argument in the other type, not highlighted

Adds a , to the type representation only if it is appropriate.

For generic types with parameters with defaults, remove the parameters corresponding to the defaults. This repeats a lot of the logic found in ty::print::pretty.

Given two fn signatures highlight only sub-parts that are different.

Compares two given types, eliding parts that are the same between them and highlighting relevant differences, and return two representation of those types for highlighted printing.

A possible error is to forget to add .await when using futures:

async fn make_u32() -> u32 {
    22
}

fn take_u32(x: u32) {}

async fn foo() {
    let x = make_u32();
    take_u32(x);
}

This routine checks if the found type T implements Future<Output=U> where U is the expected type. If this is the case, and we are inside of an async body, it suggests adding .await to the tail of the expression.

When encountering a case where .as_ref() on a Result or Option would be appropriate, suggests it.

Returns a string of the form “expected {}, found {}”.

Determine whether an error associated with the given span and definition should be treated as being caused by the implicit From conversion within ? desugaring.

This rather funky routine is used while processing expected types. What happens here is that we want to propagate a coercion through the return type of a fn to its argument. Consider the type of Option::Some, which is basically for<T> fn(T) -> Option<T>. So if we have an expression Some(&[1, 2, 3]), and that has the expected type Option<&[u32]>, we would like to type check &[1, 2, 3] with the expectation of &[u32]. This will cause us to coerce from &[u32; 3] to &[u32] and make the users life more pleasant.

The way we do this is using fudge_inference_if_ok. What the routine actually does is to start a snapshot and execute the closure f. In our example above, what this closure will do is to unify the expectation (Option<&[u32]>) with the actual return type (Option<?T>, where ?T represents the variable instantiated for T). This will cause ?T to be unified with &?a [u32], where ?a is a fresh lifetime variable. The input type (?T) is then returned by f().

At this point, fudge_inference_if_ok will normalize all type variables, converting ?T to &?a [u32] and end the snapshot. The problem is that we can’t just return this type out, because it references the region variable ?a, and that region variable was popped when we popped the snapshot.

So what we do is to keep a list (region_vars, in the code below) of region variables created during the snapshot (here, ?a). We fold the return value and replace any such regions with a new region variable (e.g., ?b) and return the result (&?b [u32]). This can then be used as the expectation for the fn argument.

The important point here is that, for soundness purposes, the regions in question are not particularly important. We will use the expected types to guide coercions, but we will still type-check the resulting types from those coercions against the actual types (?T, Option<?T>) – and remember that after the snapshot is popped, the variable ?T is no longer unified.

Replaces all regions (resp. types) bound by binder with placeholder regions (resp. types) and return a map indicating which bound-region placeholder region. This is the first step of checking subtyping when higher-ranked things are involved.

Important: You have to be careful to not leak these placeholders, for more information about how placeholders and HRTBs work, see the rustc dev guide.

See infer::region_constraints::RegionConstraintCollector::leak_check.

Registers that the given region obligation must be resolved from within the scope of body_id. These regions are enqueued and later processed by regionck, when full type information is available (see region_obligations field for more information).

Trait queries just want to pass back type obligations “as is”

Process the region obligations that must be proven (during regionck) for the given body_id, given information about the region bounds in scope and so forth. This function must be invoked for all relevant body-ids before region inference is done (or else an assert will fire).

See the region_obligations field of InferCtxt for some comments about how this function fits into the overall expected flow of the inferencer. The key point is that it is invoked after all type-inference variables have been bound – towards the end of regionck. This also ensures that the region-bound-pairs are available (see comments above regarding closures).

Parameters
  • region_bound_pairs: the set of region bounds implied by the parameters and where-clauses. In particular, each pair ('a, K) in this list tells us that the bounds in scope indicate that K: 'a, where K is either a generic parameter like T or a projection like T::Item.
  • implicit_region_bound: if some, this is a region bound that is considered to hold for all type parameters (the function body).
  • param_env is the parameter environment for the enclosing function.
  • body_id is the body-id whose region obligations are being processed.
Returns

This function may have to perform normalizations, and hence it returns an InferOk with subobligations that must be processed.

Instead of normalizing an associated type projection, this function generates an inference variable and registers an obligation that this inference variable must be the result of the given projection. This allows us to proceed with projections while they cannot be resolved yet due to missing information or simply due to the lack of access to the trait resolution machinery.

calls tcx.try_unify_abstract_consts after canonicalizing the consts.

Returns the origin of the type variable identified by vid, or None if this is not a type variable.

No attempt is made to resolve ty.

Like freshener, but does not replace 'static regions.

Clear the “currently in a snapshot” flag, invoke the closure, then restore the flag to its original value. This flag is a debugging measure designed to detect cases where we start a snapshot, create type variables, and register obligations which may involve those type variables in the fulfillment cx, potentially leaving “dangling type variables” behind. In such cases, an assertion will fail when attempting to register obligations, within a snapshot. Very useful, much better than grovelling through megabytes of RUSTC_LOG output.

HOWEVER, in some cases the flag is unhelpful. In particular, we sometimes create a “mini-fulfilment-cx” in which we enroll obligations. As long as this fulfillment cx is fully drained before we return, this is not a problem, as there won’t be any escaping obligations in the main cx. In those cases, you can use this function.

Executes f and commit the bindings.

Execute f and commit the bindings if closure f returns Ok(_).

Execute f then unroll any bindings it creates.

If should_skip is true, then execute f then unroll any bindings it creates.

Scan the constraints produced since snapshot began and returns:

  • None – if none of them involve “region outlives” constraints
  • Some(true) – if there are 'a: 'b constraints where 'a or 'b is a placeholder
  • Some(false) – if there are 'a: 'b constraints but none involve placeholders

Require that the region r be equal to one of the regions in the set regions.

Processes a Coerce predicate from the fulfillment context. This is NOT the preferred way to handle coercion, which is to invoke FnCtxt::coerce or a similar method (see coercion.rs).

This method here is actually a fallback that winds up being invoked when FnCtxt::coerce encounters unresolved type variables and records a coercion predicate. Presently, this method is equivalent to subtype_predicate – that is, “coercing” a to b winds up actually requiring a <: b. This is of course a valid coercion, but it’s not as flexible as FnCtxt::coerce would be.

(We may refactor this in the future, but there are a number of practical obstacles. Among other things, FnCtxt::coerce presently records adjustments that are required on the HIR in order to perform the coercion, and we don’t currently have a way to manage that.)

Number of type variables created so far.

Creates a fresh region variable with the next available index. The variable will be created in the maximum universe created thus far, allowing it to name any region created thus far.

Creates a fresh region variable with the next available index in the given universe; typically, you can use next_region_var and just use the maximal universe.

Return the universe that the region r was created in. For most regions (e.g., 'static, named regions from the user, etc) this is the root universe U0. For inference variables or placeholders, however, it will return the universe which which they are associated.

Number of region variables created so far.

Just a convenient wrapper of next_region_var for using during NLL.

Just a convenient wrapper of next_region_var for using during NLL.

Given a set of generics defined on a type or impl, returns a substitution mapping each type/region parameter to a fresh inference variable.

Returns true if errors have been reported since this infcx was created. This is sometimes used as a heuristic to skip reporting errors that often occur as a result of earlier errors, but where it’s hard to be 100% sure (e.g., unresolved inference variables, regionck errors).

Set the “tainted by errors” flag to true. We call this when we observe an error from a prior pass.

Process the region constraints and report any errors that result. After this, no more unification operations should be done – or the compiler will panic – but it is legal to use resolve_vars_if_possible as well as fully_resolve.

Obtains (and clears) the current set of region constraints. The inference context is still usable: further unifications will simply add new constraints.

This method is not meant to be used with normal lexical region resolution. Rather, it is used in the NLL mode as a kind of interim hack: basically we run normal type-check and generate region constraints as normal, but then we take them and translate them into the form that the NLL solver understands. See the NLL module for mode details.

Gives temporary access to the region constraint data.

Takes ownership of the list of variable regions. This implies that all the region constraints have already been taken, and hence that resolve_regions_and_report_errors can never be called. This is used only during NLL processing to “hand off” ownership of the set of region variables into the NLL region context.

If TyVar(vid) resolves to a type, return that type. Else, return the universe index of TyVar(vid).

Resolve any type variables found in value – but only one level. So, if the variable ?X is bound to some type Foo<?Y>, then this would return Foo<?Y> (but ?Y may itself be bound to a type).

Useful when you only need to inspect the outermost level of the type and don’t care about nested types (or perhaps you will be resolving them as well, e.g. in a loop).

Where possible, replaces type/const variables in value with their final value. Note that region variables are unaffected. If a type/const variable has not been unified, it is left as is. This is an idempotent operation that does not affect inference state in any way and so you can do it at will.

Returns the first unresolved variable contained in T. In the process of visiting T, this will resolve (where possible) type variables in T, but it never constructs the final, resolved type, so it’s more efficient than resolve_vars_if_possible().

Attempts to resolve all type/region/const variables in value. Region inference must have been run already (e.g., by calling resolve_regions_and_report_errors). If some variable was never unified, an Err results.

This method is idempotent, but it not typically not invoked except during the writeback phase.

See the region_constraints::RegionConstraintCollector::verify_generic_bound method.

Obtains the latest type of the given closure; this may be a closure in the current function, in which case its ClosureKind may not yet be known.

Clears the selection, evaluation, and projection caches. This is useful when repeatedly attempting to select an Obligation while changing only its ParamEnv, since FulfillmentContext doesn’t use probing.

Creates and return a fresh universe that extends all previous universes. Updates self.universe to that new universe.

Resolves and evaluates a constant.

The constant can be located on a trait like <A as B>::C, in which case the given substitutions and environment are used to resolve the constant. Alternatively if the constant has generic parameters in scope the substitutions are used to evaluate the value of the constant. For example in fn foo<T>() { let _ = [0; bar::<T>()]; } the repeat count constant bar::<T>() requires a substitution for T, if the substitution for T is still too generic for the constant to be evaluated then Err(ErrorHandled::TooGeneric) is returned.

This handles inferences variables within both param_env and substs by performing the operation on their respective canonical forms.

If typ is a type variable of some kind, resolve it one level (but do not resolve types found in the result). If typ is not a type variable, just return it unmodified.

ty_or_const_infer_var_changed is equivalent to one of these two:

  • shallow_resolve(ty) != ty (where ty.kind = ty::Infer(_))
  • shallow_resolve(ct) != ct (where ct.kind = ty::ConstKind::Infer(_))

However, ty_or_const_infer_var_changed is more efficient. It’s always inlined, despite being large, because it has only two call sites that are extremely hot (both in traits::fulfill’s checking of stalled_on inference variables), and it handles both Ty and ty::Const without having to resort to storing full GenericArgs in stalled_on.

Trait Implementations

Auto Trait Implementations

Blanket Implementations

Gets the TypeId of self. Read more

Immutably borrows from an owned value. Read more

Mutably borrows from an owned value. Read more

Performs the conversion.

Performs the conversion.

The type returned in the event of a conversion error.

Performs the conversion.

The type returned in the event of a conversion error.

Performs the conversion.

Layout

Note: Most layout information is completely unstable and may even differ between compilations. The only exception is types with certain repr(...) attributes. Please see the Rust Reference’s “Type Layout” chapter for details on type layout guarantees.

Size: 760 bytes