Note that is still pretty limited. We only permit opaque types to
implement abilities, abilities cannot have type arguments, and also no
other functions may depend on abilities
Turns out that we can't always assume that a successful unification of
type alias type variables means that those aliases had the same real
type from the start. Because type variables may contain unbound type
variables and grow during their unification (for example,
`[InvalidNumStr]a ~ [ListWasEmpty]b` unify to give `[InvalidNumStr,
ListWasEmpty]`), the real type may grow as well.
For this reason, continue to explicitly unify alias real types for now.
We can get away with not having to do so when the type variable
unification causes no changes to the unification tree at all, but we
don't have a great way to detect that right now (maybe snapshots?)
Closes#2583
Previously we only registered record accessor closures in anonymous
contexts, where we assume they must already be specialized based on the
surrounding contexts. This is not true in general since one might bind
an accessor to a name.
Closes#2567
Now, when we have two aliases like
```
T a : [ A, B (U a) ]
U a : [ C, D (T a) ]
```
during the first pass, we simply canonicalize them but add neither to
the scope. This means that `T` will not be instantiated in the
definition of `U`. Only in the second pass, during correction, do we
instantiate both aliases **independently**:
```
T a : [ A, B [ C, D (T a) ] ]
U a : [ C, D [ A, B (U a) ] ]
```
and now we can mark each recursive, individually:
```
T a : [ A, B [ C, D <rec1> ] ] as <rec1>
U a : [ C, D [ A, B <rec2> ] ] as <rec2>
```
This means that the surface types shown to users might be a bit larger,
but it has the benefit that everything needed to understand a layout of
a type in later passes is stored on the type directly, and we don't need
to keep alias mappings.
Since we sort by connected components, this should be complete.
Closes#2458
This work is related to restricting tag union sizes in input positions.
As an example, for something like
```
\x -> when x is
A M -> X
A N -> X
A _ -> X
```
we'd like to infer `[A [M, N]* ]` rather than the `[A, [M, N]* ]*` we
infer today. Notice the difference is that the former type tells us we
only accepts `A`s, but the argument of the `A` can be `M`, `N` or
anything else (hence the `_`).
So what's the idea? It's an encoding of the "must have"/"might have"
design discussed in https://github.com/rtfeldman/roc/issues/1758. Let's
take our example above and walk through unification of each branch.
Suppose `x` starts off as a flex var `t`.
```
\x -> when x is
A M -> X
```
Now we introduce a new kind of constraint called a "presence"
constraint. It says "t has at least [A [M]]". I'll notate this as `t +=
[A [M]]`. When `t` is free as it is here, this is equivalent to `t ~
[A [M]]`.
```
\x -> when x is
...
A N -> X
```
At this branch we introduce the presence constraint `[A [M]] += [A [N]]`.
Notice that there's two tag unions we care about resolving here - one is
the toplevel one that says "I have an `A ...` inside of me", and the
other one is the tag union that's the tyarg to `A`. They are distinct
and at different depths.
For the toplevel one, we first figure out if the number of tags in the
union needs to expand. It does not - we're hoping to resolve the type
`[A [M, N]]`, which only has `A` in the toplevel union. So, we don't
need to do anything extra there, other than the merge the nested tag
unions.
We recurse on the shared tags, and now we have the presence constraint
`[M] += [N]`. At this point it's important to remember that the left and
right hand types are backed by type variables, so this is really
something like `t11 [M] += t12 [N]`, where `[M]` and `[N]` are just what
we know the variables `t11` and `t12` to be at this moment. So how do we
solve for `t11 [M, N]` from here? Well, we can encode this constraint as
a type variable definition and a unification constraint we already know
how to solve:
```
New definition: t11 [M]a (a fresh)
New constraint: a ~ t12 [N]
```
That's it; upon unification, `t11 [M, N]` falls out.
Okay, last step.
```
\x -> when x is
...
A _ -> X
```
We now have `[A [M, N]] += [A a]`, where `a` is a fresh unbound
variable. Again nothing has to happen on the toplevel. We walk down and
find `t11 [M, N] += t21 a`. This is actually called an "open constraint"; we
differentiate it at the time we generate constraints because it follows
syntactically from the presence of an `_`, but it's semantically
equivalent to the presence constraint `t11 [M, N] += t21 a`. It's just
called opening because literally the only way `t11 [M, N] += t21 a` can
be true is if we set `t11 a`. Well, actually, we assume `a` is a tag
union, so we just make `t11` the open tag union `[M, N]a`. Since `a` is
unbound, this eventually becomes a wildcard and hence falls out `[M, N]*`.
Also, once we open a tag union with an open constraint, we never close
it again.
That's it. The rest falls out recursively. This gives us a really easy
way to encode these ordering constraints in the unification-based system
we have today with minimal additional intervention. We do have to patch
variables in-place sometimes, and the additive nature of these
constraints feels about out-of-place relative to unification, but it
seems to work well.
Resolves#1758
All we have to do is introduce a new, unconstrained type variable at
underscore sites, and let the type reconstructor work its magic! The
unconstrained type variable will become a `FlexVar` that absorbs
constraints given to it, so it'll behave like a proper inference
variable. That's it!
Part of #1804
