* Remove the `pos` field, which was always being assigned Position::default()
* Remove one use of this `pos`, by removing the never-used SyntaxError::ConditionFailed variant
* Adjust the other use to do what was probably intended - which is to say, pointing to the beginning of the def with the error
* Rename to FileError, reuse `SourceError` as an inner field, to avoid duplicating the `bytes`
This will simplify parsing and make it possible to have a uniform lexer for the language. Previously unquoted package names were allowed to include '-'s, which aren't valid identifiers.
In the future, we'll distinguish local paths from packages in the package-manager by looking for a ".roc" suffix, which should only be present in local paths.
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
This reverts commit 6e4fd5f06a1ae6138659b0073b4e2b375a499588.
This idea didn't work out because cloning the type and storing it on a
variable still resulted in the solver trying to uify the variable with
the type. When there were errors, which there certainly would be if we
tried to unify the variable with a structure that had nested flex/rigid
vars, the nested flex/rigid vars would inherit those errors, and the
program wouldn't typecheck.
Since the motivation here was to expose the signature type to
`reporting` so that we could modify it with suggestions, we should
instead pass that information along in something analogous to the
`Expected` struct.
There is still a potential for conflicts here, because we don't look at
type variables introduced _prior_ to this annotation. However, this
should be okay in most cases.
To provide better error messages and suggestions related to changing
type annotations, we now pass annotation type signatures all the way
down through the constraint solver. At constraint generation we
associate the type signature with a unique variable, and during error
reporting, we pull out an `ErrorType` corresponding to the original type
signature, by looking up the unique variable. This gives us two nice
things:
1. It means we don't have to pass the original, AST-like type
annotation, which can be quite large, to everyone who looks at an
expectation.
2. It gives us a translation from a `Type` to an `ErrorType` for free
using the existing translation procedure in `roc_types::subs`,
without having to create a new translation function.
We now push analysis of when two wildcards are associated with each
other to the time when we try to give tips for a diff between types. Two
wildcards always have a diff, since they are associated with different
types.
This makes it easier for error reporting to find the relevant
annotations that were part of a type error, and display that in the
error message presented to a user.
