(i32 (at xs i)) inside a body bounded integer? was refused with "i32
converts a number, found t". Arithmetic, comparison, min/max, the
bitwise fold and the shifts all ask the where clause; the conversions
were the family nobody had gone back to, and the cast block held three
arms of it.
The machine-type target asked Types.is_numeric of its operand and the
enum target asked Types.Int _, so a variable fell through both to the
refusal however it was bounded. The variable target had the opposite
defect: it asked the bound of the target and then took any generic
operand, so a second variable declared only ordered? passed the abstract
pass on the strength of a sentence about a different one. Nothing wrong
was ever emitted through it — ordered? admits numbers and enums and both
convert at the instantiation — which is exactly why it is worth closing:
the hole opens the day ordered? admits a type that does not.
The rule is the repo's own, applied to a set instead of a type: a
conversion is legal at a bounded variable exactly when it is legal at
every type the bound admits. A machine-type target needs numeric?, an
enum target needs integer? because numeric? admits the floats the
concrete arm refuses, and ordered?/equal?/hashable? admit nothing — the
last by what the predicate says rather than by the set it denotes, since
hashable? already admits strings and ordered? may.
Both float targets and the narrowing i32 stay legal: (f64 i64-x) rounds
above 2^53 and (i32 f64-x) truncates where the types are written, and a
generic that refused what its copies accept would be the fork the rule
forbids. FIX.org, 2026-09-21, has the account, and records what this
costs: no predicate now licenses a generic enum to integer conversion,
and enum? is the eventual answer.
The refusal says what the variable is known to be and what to write, in
the clause spelling unconstrained already uses: a body with no clause
gets the clause, a body that has one is told which predicate to add.
Three things the review found, and the refusal it was right about.
The returned-Vec refusal is gone. It called a leak a dangle: the storage a
returned Vec owns outlives the expression, so the view reads what it says it
reads, and what is lost is the owner. (len (mk)) and (at (mk) 0) lose the same
owner and compile, spec-memory.md already says an overwritten global Vec leaks
its first block, and under a region there is nothing to leak at all. "We're
purposely doing manual memory management for the static side, so whatever."
The array refusal stays exactly as it is — that one is a view into a frame
that is gone and answers bytes the frame has since reused. Wrong answers are
the compiler's business and leaks are the program's, and both docs now draw
that line, because the two forms look alike.
The -1 sentinel was reachable from user syntax: (slice v 0 -1) answered the
whole Vec on both backends while (slice a 0 -1) was refused as a negative
bound. The refusal now runs on the bounds the reader wrote, before the
implicit hi is built — the only order that works, since the sentinel is itself
a -1 and a check on the finished pair would refuse (slice v). The
backwards-pair check moved into the branch where both ends are written.
The bounds seam is closed toward index_expr, and the tiebreaker is not which
half is older. indexed and vec_at both take their index through it, so
(at a c) over a u32 compiled where (slice a c) did not: the fork was between
slice and at as much as between two targets. A bound is a subscript.
Also an x86 row for vec.flan, so the new arity is pinned on both backends in
CI rather than by hand, and the comment columns the sweep shifted left in
slurp, into, format and algorithms.
as-slice was a warning, not an operation. The input type already decides
which of the two things happens — a Vec can only be borrowed, an array or a
string can only be viewed, and no call site picks between them — so the second
name expressed no choice a reader could make. And it warned at the moment the
view is taken, which is the one moment nothing is wrong; the danger arrives
later, at the push. slice now takes a Vec at all three arities and as-slice
is gone.
(slice v lo) was free, and is the arity the Vec never had: the runtime already
reads a hi of -1 as "to the end", so the tail form passes the caller's lo and
the same -1 — no slot, no length read, no second evaluation. The merge is
entirely in the checker; the Vec path builds the flan_vec_as_slice call it
always built and neither backend has a line about any of it.
A Vec a call returned is refused at every arity, and not for the array's
reason. (slice (mk)) over an array dangles. (slice (make-vec)) does not — the
storage outlives the expression — but the header is a temporary, so nothing
can ever free the block. The refusal says that and names the let.
The name's own refusal sits in ordinary_call after every table, so a program
that defines an as-slice still reaches its own. It reads for somebody who has
never heard of the old name and writes the call back out, spelling each
argument that is a name or a number.
The warning moved to where it bites: BUILT.md gains a section beside the Vec
table and the push row points at it, spec-memory.md's Borrowing says the same.
Investigated and deliberately not built — a diagnostic for a live view at the
push. (reserve v 100) then a slice, a push and a read is correct code under
the contract the spec chose, so any flag on it is a false positive by the
language's own semantics rather than by an approximation. FIX.org has the
finding and the syntactic sketch that does not work.
TraceLogLevel carried `warning` beside `log-warning` so that sand.flan's
one call kept working while the rename landed. The review found it was not
inert: render.ml folds members last-wins, so a 4 read back as :warning in
the break loop, the did-you-mean offered it, and every TraceLogLevel error
listed it. A spelling nobody should write was the one the compiler taught.
So the call is respelled and the alias is gone. Every member of every mapped
enum carries its enum's prefix now, with no exception to explain.
"Is there a way to do dotimes or a loop in reverse?" — the answer was a
hand-written let plus set. Now it is (dotimes [i 9 -1 -1]).
Three arities: [i n], [i start stop], [i start stop step]. The stop is
exclusive in all of them, so [i 0 n] is [i n] — one rule, not two — and a
negative step counts down, testing with > instead of <.
A literal step of 0 is refused where it is written. One that is only a value
cannot be, so the condition asks the sign first and 0 falls out of it as a
loop that runs no times: terminating and deterministic, and free, because a
literal step still emits the single comparison it always did.
Each bound is evaluated once, left to right, before the counter exists: the
start into the counter, the stop into the hidden slot it always had, the
step into one of its own unless it is a literal.
Still a special form, still a Let and a While with the step in the latch, so
neither backend learned anything — the new program prints the same thing
under --x86 and at -O0. load.ml's Form-level walk had to learn more than one
bound for the same reason parse.ml did; it is part of this feature and not a
bug that was sitting there, because before this a three-bound dotimes was a
parse error long before that walk could reach it.
The trio the author decided on 2026-09-20 is now all built: def is CL's
defparameter — its initialiser runs on every daemon re-run, unguarded, so
an edited initialiser repaints the same storage on C-c C-c plus re-run —
defonce (Clojure's name for CL's defvar, per the author) initialises once
behind the .init~once. flag, and defconst stays the image.
One parse arm reads both forms; the difference is Ast.reinit, carried to
Tast.global's grerun. Emit.startup_plan gives a def no guard flag, and
Check.check_global lifts every def initialiser — zero and literal
included — into global/<n>, so the host's startup reaches it through the
function cell and a re-evaluated def swaps it (Session's def_inits;
Emit.redefinition declares the cell for a non-sibling target). The old
defvar spelling is refused with the rename and both compiling spellings,
and every program, test, doc and editor list is swept — except sand.flan,
the author's live WIP, whose seven defvar lines are flagged in FIX.org
and keep its three dependent tests red on this branch.
A fixed array does not decay to a slice at a call, so passing one to a
function over [$t] meant writing (slice a 0 (len a)) at every call site.
(slice a) is the whole of it now and (slice a n) is the tail from n, filled
in by check.ml into the three-argument form: same node, same static bound
checks, same runtime trap, and on a fixed array the implicit length is the
constant (len a) already folds to. Neither backend grew an arity case. A
target that is not already a name goes through a slot first, so (slice (f x))
calls f once.
at and slice also reach a string, because (bytes s) was the only route to a
byte and it is about to start copying. (at s i) is the byte, bounds-checked;
(slice s ...) at all three arities answers a string viewing the same bytes,
not a [u8], which would be a writable-looking view of storage the program
does not own.
Neither is a place, and the refusal lives in [indexed] rather than in
check_place, which is the part that matters. There are three routes to a
Pindex and they share no code: check_place, the single-index set arm that
checks its own target, and addr. Asked in check_place, the question is
answered for two of them and missed for the one a person writes — a store
into a string literal compiled, and the backends disagreed about it. So
[indexed] takes a ~place location and asks at every dimension, because
(at g 0 0) over a [[2 string]] reaches the string only at the last step.
One message, and addr gets it too, so it reads as value-versus-place rather
than as a rule about assignment.
Slicing an array a call returned is refused at every arity. The view
outlives the temporary, both backends print whatever the frame reused, and
nothing traps — which was already true of (slice (mk) 0 3) and only
survivable while nobody wrote it. (slice (mk)) is short enough to become a
habit. An array literal is not this case and stays legal.
Two backend cases. emit.ml's element_addr grew the String arm beside the
Slice one. x86.ml's index_len had answered None for a string — correct while
nothing could index one, and a skipped bounds check the moment something
could — and now reads the length word, so both check the same thing.
- SA_NODEFER. sigaction without it blocks the handler's own signal for the
whole handler, and here the handler is the park — it never returns. A
hardware SIGSEGV delivered while SIGSEGV is blocked is not handled: the
kernel forces the default action. Fault, park, eval something at the
break loop that faults, daemon gone, exactly the author's session one
level in. Measured both ways; flan_crash_entered is cleared before the
hook so each break-loop fault still gets its line, and the case is pinned
(trap_park ~refault:true), confirmed to fail without the flag.
- Scope the handler to the thread it was armed on. A disposition is per
process and a merged dev session is one process, so this was shadowing
OCaml's SIGSEGV handler — and Stack_overflow — for the daemon's whole
life. Other threads chain to what was installed before. Arming per run
would leave the parked prompt's evaluations unprotected, since those are
program code too; the comment says so. Also makes the per-thread
sigaltstack honest.
- Sweep dyn-view.flan and string-eq.flan, which dev-loop added after the
first sweep. string-eq:46 wanted the aliasing outright: its comment is
about two slices sharing a base pointer.
- A StorageExhausted row for bytes, asserting the retry copies once and
whole rather than re-evaluating its argument.
- Gate the flan_dev_crash_enable declare to dev builds, so this lane adds
no dev-only text to a release module. flan_bytes_dup stays ungated: a
release build really calls it.
- Guard the section for wasm32, which compiles this file and has no
signals.
The INSERTIONSORT crash, all three rulings (FIX.org 2026-09-20):
- (bytes s) allocates a writable copy through the allocator surface —
context or (bytes s a), StorageExhausted with retry, a registry note in
dev builds (flan_bytes_dup, lowered like vec-new). (bytes-view s) is the
old zero-cost reinterpret, renamed, read-only by convention; every
in-repo reader swept over to it. (string b) unchanged.
- String constants were already read-only on both backends at -O0; now
pinned — bytes-copy.flan rows on LLVM/-O0/--x86, and dies_segv rows
asserting the write-through-view trap on both backends.
- A dev build installs a SIGSEGV/SIGBUS handler by the same dev-only
constructor slot that arms the registry: one line naming the address and
the innermost frame, then the trap-hook park — stopped, not dead, the
daemon serving. No agent: message and re-raise. Release builds untouched.
Pinned by trap_park over dev-segv.flan.
Five fixes off the independent review, plus the author's u8 ruling.
x86 parity: the bad-index block always ran x86 (it is flan dev's
default) and now says so with an explicit --x86; the condition render
gets an assertion under the x86 backend too, beside the LLVM one, and
a user error is pinned as carrying no site on both.
ArithError's layout is now pinned: {i32 op; i64 lhs, rhs} in C against
the prelude's defstruct, read field by field through the break loop's
render, driven from the editor through a divide under a restart-case.
That also covers condition and site on LLVM.
Three refusals that were wrong: trap_site tested the prefix "err"
and so ate any site whose path began with those letters; source_line
let Sys_error from input_line escape and take the whole break reply
with it, leaking the handle; and a condition with no fields was
reported as a name no struct has. The daemon now sends its own field
count and the buffer tells the two empties apart.
Nits taken: an over-long site is dropped rather than silently
truncated into a plausible one; the caret pads with the source line's
own tabs; the headline says when it has cut the field list;
flan-cnr-layout is live again as the single spelling of that request
rather than dead beside an inlined copy.
And the ruling: a u8 renders as 97 (\a) where a person is inspecting
and stays 97 where the program is printing.
Arguments print in order with a single space between each pair, println
ending the line; (println) is the newline alone and (print) is nothing.
The checker's arm renders each argument exactly as it did alone, so typed
and dyn values mix in one call, one-argument sites are byte-identical, and
an unprintable argument is still refused at its own span.
A narrower scalar at a $t a slice already fixed widens into the fixed
type — the same cast a monomorphic parameter applies — where the old
rule refused both directions. One accepts pin, one runtime line in
int-generic.flan, and the web page's predicate table catches up: five
predicates, integer? at the head, and the entailment chain grown one
link.
The fifth predicate: integer? admits every integer kind and no float,
entails numeric? (and through it ordered? and equal?), and gates what
only integers support — the bitwise fold asks for it, the shifts admit
a bounded variable under it, and the float literal in an integer? body
is refused in the bound's own words. The literal arm needed nothing:
the entailment admits an integer constant under either bound.
abs-i32 and abs-i64 collapse into one integer?-bounded generic whose
i32/i64 copies even keep the old symbols; abs-f32/abs-f64 stay as the
float spellings because the right float abs is a sign-bit clear no
integer body spells, and (abs 1.5) now refuses naming the bound — the
where clause is checked before the name-collision check, which used to
answer that call with 'abs-f64 is already defined'.
Mixed widths at one $t join at the wider type now, in either argument
order — the author reversed the refuse-both rule on 2026-09-20. A
joinless pair is deferred and re-asked against the final binding, so a
later wider argument settles u32-vs-i32; u64-vs-i64 still refuses, and
a container-bound variable still binds exactly. The out-widened
arguments catch up through the ordinary Cast.
Two review follow-ups folded in: a struct field's unknown-lowercase
message stops suggesting a parameter vector it does not have, and the
tyvar-at-dyn message says defgeneric/defmethod in words instead of a
schematic that does not compile.
(array-gen [3 4] (fn [i j] ...)) — the canonical form — was refused:
check_fn saw no (Fn ...) want and no position to take types from. But the
form knows them: one i32 index per dimension is the rank's own promise.
check_array_gen now hands an inline fn its parameter types directly, with
the annotated element type as the return want where the annotation reaches
that deep, and the return left for the body to say where it does not — so
a bare inline fn infers its element type the way a fill value does, and a
body that disagrees with an annotated element is reported at the
generator's answer, per element. Named defn generators check as before.
check_fn grows a ?gen way in for exactly this: parameter types without a
Fn want, return optional. An inferred-return body sees Unit as ctx.ret, a
rough edge left rough on purpose.
Pins: inline at rank 1 and 2, inferred element, annotated defvar, the
per-element mismatch, inline arity. The acceptance program gains the
inline form, a struct-valued fill (the per-element store is a struct
copy), and evaluated-once (a counting fill value called one time for four
elements) — riding the three existing rows, no new ones. And the FIX.org
entry the pass never wrote: dims by the [n T] rule, one index per
dimension, the Zero+While/Set/Pindex lowering with no backend edits,
composition by nesting the forms, and this fix.
The two compositions the milestone owed, pinned, and the record of the
whole lane.
A package whose exports are generic: pkgs/gen, imported by
pkg-generic.flan at three shapes. One generic at two element types.
One that calls another in its own package at its own variable, so the
transitive copy is generated from a call site two files away. And a
generic written in the program calling one written in the package at
its own $t, which only resolves once Load has flattened both bodies
into one namespace -- the thing that has to change the day a package
becomes a real compilation unit, because a copy is made from a body
and a body that did not cross cannot be copied. Plus the call-site
half of a bound written in another file, quoted here rather than
pointed at in a file the caller cannot change.
And the composition with the widening trial. A binary operator
re-checks its right operand at its left one's type inside a trial, so
a generic call written there is checked twice and once thrown away.
The discarded pass's instantiation does not go back out: instantiate
rewinds a copy whose *body* refused, which is a different event. It
does not have to, and the reason is this lane's own rule rather than
luck -- a generic call's instantiation is read off its arguments and
never off the ambient want, so both passes ask for the same types and
the second ask is a cache hit. Pinned by counting the copies in the
checked program.
The widening lane's note said that cache already rewinds itself. It
does not. Corrected in the comment and in FIX.org, in place.
The refusals generics obsoleted, swept. Every message that sent
somebody to a schedule now says what is actually true of the thing in
front of them.
An unknown lowercase type name used to be reported as unimplemented
generic code over a type variable. Generics are implemented, and
resolve_name consults env.tyvars and env.subst long before anything
reaches that arm -- so a lowercase name arriving there is a typo too
far from any type to guess at, or a type variable nobody introduced.
The sentence names the sigil that would introduce it.
A capitalised name given type arguments is the other half, and it is
still genuinely unbuilt: Types.Named is a bare string with no room for
parameters, and giving it some is a change to Types.t and therefore to
the layout calculator, both backends, Render and DWARF. Both sites
that reported it -- the type resolver and the value-position fork --
now say a generic *type* is not there yet and point at the generic
function that is.
Plus the prelude's side of it. pos?, neg? and zero? are three
questions about a number's sign, one body each, answering at every
numeric type -- the family the whole feature was asked for, and the
one thing the landed generics could not write until a literal was
allowed to stand at a bounded type variable.
Two collapses examined and declined, with the real reason written
where the old one was. abs stays per width because numeric? is the
only bound that admits a written 0 and it admits floats too, and the
integer body is the wrong abs for a float: it hands back a negative
zero. It waits on an integer? predicate, which is language surface.
min and max stay builtins because they are variadic and slot each
operand so it is evaluated once; a binary prelude generic would put
the double evaluation back at the call site. Their generic half was
never missing -- ordered? already admits them in any body that
declares it.
pos? over every numeric type from one definition was the motivating
example for milestone 5 and was the one thing the landed generics could
not write: (> x 0) refused with "expected t, found the integer literal
0", because int_literal had no arm for a want that is a type variable.
It has one now, and the bound is what makes it sound rather than
optimistic. Every type numeric? admits is an integer or a float, and an
untyped integer constant is usable at all of them, so there is no
instantiation of a numeric? variable at which the literal has no
meaning. Under a weaker bound there is -- ordered? admits an enum -- so
numeric? is what is asked for and the refusal names it.
The float literal is refused at a type variable even under numeric?,
and that asymmetry is the concrete arms' own: an integer constant is
usable where a float is wanted and a float literal is never usable
where an integer is wanted, so a body written with 0.5 has no meaning
at the integer half of its own bound. Refusing at the definition is
what the abstract pass is for; the alternative is a surprise at
whichever call site first asks for i32.
The node the abstract pass builds is never emitted. Each copy
re-checks the same form with the variable substituted, and that is
where the literal is built at the concrete width and range-checked --
so (+ x 300) is fine at i32 and a refusal at u8, and u8 is where it is
refused.
A defn named after a builtin wins for its whole file, and until now that
was the end of it: the builtin had no remaining spelling, so a defn that
meant to wrap one was unbounded recursion. builtin/len is the builtin len
wherever it is written, shadowed or not.
The qualifier is the package one's, and builtin is reserved rather than
resolved: Load refuses it as an import alias, Check refuses it as a
declaration's name, and those two doors are the only ways a qualifier can
be made. named_call and var each strip the prefix and re-enter with a flag
that the shadowing guard consults, so every arm below sees the bare name
and refuses in the builtin's own words.
The shadow warning now names the escape in its second half.
The bug review found: [start_on] claimed [started] at the top and every
failure exit left it claimed. Under [flan dev] the constructor is the first
caller and reports to nobody, so a path nothing could bind disarmed the
program's own (agent/start ...) as well — it answered 0 with no socket, no
listener and no hooks, where before this lane the explicit form answered -1.
Success reported for nothing at all is worse than the error it replaced.
So every way out that is not a listening socket unwinds: the fd is closed, a
file the bind managed to make is unlinked, and [started] goes back to 0 so a
later start is a real attempt. Pinned by running the zero-argument fixture
with FLAN_AGENT_SOCKET pointing nowhere — constructor fails silently, main's
own call then fails loudly, "cannot listen" and exit 1.
Two arguments to (agent/start) are refused, which nothing held: the macro's
[& args] cannot say "one at most", so what says it is the expansion splicing
every argument into a function that declares one. The message names
agent/start-at and carries the expanded-from note, and that is what the
acceptance row asserts.
And the reply a delivery gets when there is no agent in the process, which
nothing held either. dev-noagent.flan parks, so it was never this case;
dev-noagent-running.flan keeps running, and the answer is a refusal naming the
socket that could not be reached — not install_note's "queued", which would
promise a poll with nothing to drain. Which leaves that note unreachable in
all three shapes rather than merely unpinned, worked through in FIX.org.
FIX.org also now says what an exported FLAN_AGENT_SOCKET would do: start_on
unlinks before it binds, so an agent-linked program started in that
environment takes the path away from whoever bound it first.
The leak review found: an importer's (defn len ...) reached inside an
imported package's (defvar sz i32 (len "abcd")) and made it 999. A global
initialiser is checked with no enclosing function, so the qualified name the
first cut asked about was not there to ask. The file the definition was
written in is what the shadow follows now, which is what FIX.org had already
named as the fix if it ever mattered. It mattered.
builtin_set beside builtin_names: the guard is the first arm of the dispatch
and ran a linear walk of eighty-odd strings at every named call. The list
stays for the did-you-mean, whose order is its order.
Pinned: a shadowed operator warns and lowers to a Call, and a call carrying
another file's name reaches the builtin. The corpus program grew both cases
and the package grew the initialiser that demonstrated the leak.
And the int/float section's sentence about "the arity precedent, where the
builtin wins" now says that the precedent was deleted the same day, since
this lane is what deleted it.
The author's rule: "allow shadowing but warn". A user (defn get ...) is
legal, the user's definition wins at every call site in the file that wrote
it, and the compiler warns once at the definition.
Builtin-wins was never a rule anybody wrote: named_call is one match on the
name, the builtin arms are string literals, and the three arms that look a
name up are the last three in it. So a guard goes first, the trailing three
are factored into ordinary_call, and both routes into it resolve a name the
same way.
The shadow stops at the file that declared it. An imported package's names
were qualified at the import, so a get written inside one is the builtin's
and stays the builtin's; the prelude is excluded by its file for the same
reason. programs/shadow-builtin.flan is both halves at once.
The warning prints from build_program, which is what every command and the
dev daemon's reload go through, in the shape --warn-memory established:
file:line:col, the squiggle, and an exit status that does not move.
And the message that described the old world is gone — the builtin-arity
note said a defn does not replace a builtin, which is no longer true and is
no longer reachable.
The author's exception to the foreign-spelling list: int is i32 and float
is f32, and nothing else on that list moves.
Spelled in Types.ikind_of_name and Types.fkind_of_name rather than as two
prelude defaliases, because Check.is_cast asks those two functions and never
the alias table — a prelude alias would have left (int x) with no reading
while (i32 x) had one. Both names join primitive_names for the same reason
one layer down: that list is what decides (vec-new int) and the three-element
(defvar x int).
Nothing reverses: ikind_name still says i32, so every message, signature,
inspector line and DWARF name shows the machine type whichever spelling was
written.
A defalias restating the builtin is the no-op it says it is; one pointing the
name anywhere else is refused, since the alias table is never consulted and
the declaration would otherwise mean i32 in silence.
F1 was the blocker and it was the worst kind of fault this pass can have: the
condition message told the reader to write (not= x 0), and not= does not
exist — the operator is !=. Applying the compiler's own advice got 'unknown
function not= — did you mean not?'. Both branches say != now, and all three
— the named form, the float zero, and the unnamed one — were checked by
compiling the sentence the compiler prints.
F5: a typo of a declared capitalised name got the generics lecture. (Piont 1
2) with Point declared was told that a capitalised name given type arguments
is milestone 5 work, which is a confident answer about a feature nobody was
reaching for. The did-you-mean runs first and, for a capitalised head only,
asks the type tables as well; the generics sentence is left for a head that
resembles nothing.
F2: flan_dyn_cast_kind had the site live and passed NULL on the trapping
path — the one entry point on this side that had a location and threw it
away. The acceptance row now pins the prefix it prints.
F3: the case-typo row used (data ...), which is not a top-level form, so it
refused as an unknown top-level form and the needle 'unknown' matched that
rather than the rule. Rewritten with defdata, and as a pair: a capitalised
head gets no accessor advice, a lowercase one does. Both halves were checked
to fail when perturbed.
F4: an end-to-end pin for the headline. programs/dyn-trap-site.flan is
compiled, run, and its stderr read for the file:line:col in front of the
sentence, on both backends and at -O0. Proven live: three failures when the
expected line is wrong.
F8: usize and size_t stay off the foreign-spelling list, and the comment now
says why — the honest answer is pointer-width, which is u64 here and u32 on
wasm32, and a tree that builds both cannot name one of them.
F10 pins the fourth dot shape. F6 moves the not-reached reasons out of the
commit bodies and into FIX.org, where they can be read without git.
DISCUSS.org's "need a value-producing array constructor": the author
wanted grid filled with 255 as part of its declaration and could not
write it. (array n T) produces the zeroed array only, and dotimes is
Unit, so it can mutate a place that already exists but cannot be the
initialiser expression -- which has to produce the whole value in one
go. The grid was declared zeroed and filled in main instead.
Two forms, both expressions, both any rank:
(array-fill [rows cols] 255) every element that value
(array-gen [rows cols] cell) every element (cell i j)
Spelled apart rather than one form dispatching on the third element's
type, because an array *of* function values is a thing to want and one
form would have to decide whether (array-fill [4] f) meant four copies
of f or four calls of it.
The dimensions are read in Parse, and that is the whole reason they are
recognised there: handed through as an ordinary call, [rows cols] is an
array literal of two names, and where those names are defconsts it is a
perfectly good two-element array of integers -- the wrong reading, and a
silent one. Read in Parse they are the same len the [n T] type spelling
takes, resolved by the same array_len, with one extra condition of their
own: the fill counts in i32 like every index in the language, so a
dimension no i32 can reach has no loop that could end.
The lowering is a loop over a slot, not an aggregate. Tast.Arr is the
node the backends have and both build it element by element from a list
as long as the array; a fill of [600 [800 u8]] is half a million
elements and there is no list to be had. So these bind the array to a
slot, zero it, run one While per dimension writing through Set of a
Pindex, and answer with the slot -- While, Set and Pindex, which is the
argument check_loop already makes for recur. Nothing new reaches a
backend and all three get the form with no edit. The value stays
value-like: the slot is the form's own, and the Local at the end copies
out the way any array-typed expression does.
Row-major is pinned, not incidental: the first dimension is the
outermost loop, and a generator that counts observes it. The fill value
and the generator value are each bound once before any loop starts, so
(array-fill [n] (next-id)) is one call and n copies of its answer.
What falls out for the defvar the note was written about, and neither
half is a carve-out:
(defvar grid [rows [cols u8]] (array-fill [rows cols] 255))
is the spelling that works -- a typed global with a computed
initialiser, which is the startup-lifted path with the init-once guard
that defvar already had, so the fill runs once and the value survives a
re-run like any other computed one. The three-element spelling means
what the 2026-09-20 rule says it means: not a type, so a dyn global, and
a typed fixed array crosses into dyn only as a view of storage that
outlives the view. A freshly built array is a temporary, so it is
refused -- by the element rule where the elements are themselves an
array, by the lifetime rule where they are one of the three scalars a
view carries. Both refusals are the ones any other temporary gets.
The type an array-fill builds never goes through resolve, so resolve's
own guard is asked again where it is built: a fixed array of function
values would be zeroed, and a zeroed function value is a null pointer.
The author's revision. The name says what it writes, and the pattern is the
program's to choose: (dead-beef) is DEADBEEF, (dead-beef 0xBAADF00D) is
BA AD F0 0D. One byte-order rule covers both — a pattern's ascending bytes
are its big-endian bytes, which is how the hex literal reads left to right —
so every candidate DISCUSS.org listed is now spellable without the compiler
naming any of them.
The bare form is not a case a backend knows about: the checker writes
Tast.dead_beef_default in where the argument would have been, so
(dead-beef) and (dead-beef 0xDEADBEEF) are the same node and an acceptance
row prints both to say so.
The operand is an ordinary u32 expression, which is what the byte arm
already accepts for its byte. A literal is byte-reversed at compile time and
still reaches the loop as an immediate; a computed one is reversed at run
time, by llvm.bswap.i32 on one backend and bswap on the other, after which
the tail shifts its bytes out of the word rather than folding them. The
program runs a computed pattern over lengths 6 and 7 deliberately: that is
the case a constant-only implementation would pass by accident.
filled is untouched, and so is the fill boundary.
(defmacro do-grid [[r rows c cols] & body] ...) — positional names, a [ ]
pattern wherever an argument is a vector, and & for the tail. The reading of
the list lives in Expand, below both sides that need it: Parse turns it into
the bindings a macro body opens with, and Macro checks a call against the same
reading before expanding it, so arity and shape are refused with the call's own
location rather than with the Loc.from_macro stamp every node of an expansion
carries.
The breaking half: [args] used to bind the whole argument list and now binds
the first argument. The whole list is [& args], and every defmacro in the tree
— prelude, vendor, tests, the elisp fixtures — was migrated to it. One grammar,
not a legacy mode.
DISCUSS.org's sentinel-fill idea, built as two builtins because the author
asked for both: a memset with a byte the program picks, and the fixed
DE AD BE EF pattern a hex dump reads as DEADBEEF.
Both are spelled the way (zeroed) is — the value of whatever type is
expected of them — so (set grid (filled 0xFF)) fills a place and there is
no second, place-taking form beside set.
What may be filled is numbers, and structs and fixed arrays built out of
them. Everything else is refused by name: a filled dyn is a collector root
pointing at nothing, a filled Vec header frees a wild address, a filled
slice length is a bounds check that passes, and a filled bool is an i1 to
LLVM and a whole byte to x86, which is the one divergence this feature
cannot have.
The byte fill is llvm.memset / rep stosb. The four-byte pattern cannot be
a memset on either side — the intrinsic takes one repeated i8 — so it is a
counted dword loop in emit.ml and rep stosd in x86.ml, with the pattern
bytes and their little-endian word living once, in Emit. A size that is
not a multiple of four ends on DE, DE AD, or DE AD BE.
A bare {.field v} had its refusal in Parse.expr, before any checking, so a
defn whose return type was the only place the struct's name appeared could
not build one. The refusal moves to Check: Parse builds an Ast.Bare out of
the same struct_fields the named form uses, and check_bare reads the type
name off the expectation and hands that very list to check_struct. ZII, the
unknown-field refusal and the duplicate-field refusal are therefore not
copies of the named form's rules but the named form's rules.
Braces at a dyn want are the dyn map literal and stay exactly that. A
.field-keyed brace was never part of that spelling, and at a dyn want it is
refused by name rather than given a second meaning.
(Cell 1 2) is the other half, and it is character-for-character an ordinary
call, so only the symbol table separates them. It is decided on the last arm
of named_call, after a local of function type, a generic and the function
table -- so a defclass constructor, which is a real defn, resolves above it
and is untouched. Arity is exact: ZII is what the braces do, and a positional
list cannot say which field it left out, so it is not allowed to leave one
out. The refusal names the first field it did not reach and points at the
spelling that does mean "zero the rest".
Both are gone before any backend sees them -- Tast.Make either way -- and the
three acceptance rows print the same lines to say so.
A let binds in sequence, so binding a method's names pairwise from the
generic's reads a name it has just bound. A generic [a b] with a method
[b a] -- a swap, which is what renaming parameters most often is -- was
handed its first argument twice and could not reach its second at all;
[b c] is the same bug one step shorter. Every argument is now copied
into a temp in the unspellable ~ namespace first and every method name
bound from a temp, uniformly rather than only for the pairs that
collide, because a rule that fires on the tangled case alone is one
nobody exercises. Both shapes are in dyn-class.flan, where the values
are what is wrong rather than the types, and across all three rows.
With it, two things the descriptor fix left behind. descriptors_asm
wrote the descriptors into .rodata and a descriptor holds the address of
its own offset table, so every one of them was a relocation in a
read-only section -- a DT_TEXTREL, which ld warns about in a PIE and
refuses in a shared object, and which was warning in the new daemon
case's own output. They go in .data.rel.ro now, in both the executable
and the reload module; readelf -d on a reload module from each backend
shows no TEXTREL. And FIX.org: the stale held line for item 6, the
fourth read site of the shape tag (say_render, not just print), the
warning that a class's qualifier is the importer's alias so a
hand-written :a/point is coupled to one import's name, and the gap
flagged for the next sweep -- marking through a descriptor an x86 reload
module emitted is still unexercised.
A defclass is a named dyn map with a shape tag, and a generic function
dispatches on it two ways: CLOS's, where the dispatch value is the class
of the first argument, and Clojure's, where a body computes it. They are
one mechanism and not two — a class dispatcher is (class-of arg0) as the
dispatch function, which is what lets a method written for the class
point and one written for the value :point be the same branch.
(defclass point [x y])
(point 3 4) ; the constructor, positional
(class-of p) ; :point, or nil for anything else
(defgeneric area [self] dyn)
(defmethod area point [p] (* (get p :x) (get p :y)))
(defmulti describe [x] dyn (get x :kind))
(defmethod describe :square [s] ...)
(defmethod describe :else [s] ...)
A slot is a key in the instance's own map, so get, put and has-key? are
how one is read and written and no operation was added for any of it.
What the class adds is the tag, and the tag lives in the object's header
rather than in a reserved entry — the queue's note said a reserved key
and this departs from it, because a key would be counted by len, walked
by the renderer and compared by equality, so every instance would answer
a length one larger than its slot count and print a key nobody wrote. A
header field cannot be reached by get or put at all, so no user key can
collide with it. It costs nothing: the map arm of flan_obj's union grows
to the size the view arm already had, and sizeof(flan_obj) is unchanged.
It needs no tracing either — the tag is an interned keyword entry, which
is immortal and is not a collector object.
The tag shows up in exactly three places: class-of answers it, equality
compares it (two instances of one class compare by their slots; an
instance and a plain map with the same entries do not, which is
Clojure's answer for a record beside a map), and both renderers print it
— #point{ :x 1 :y 2}, Clojure's own spelling.
None of the four forms reaches the checker. lib/classes.ml turns the
whole declaration list into ordinary defns at the top of build_program,
the way Shim.expand already turns a declare-c into a declare plus a
defn: a class becomes its constructor, a generic becomes one function
whose body binds the dispatch value and compares it down a chain, and a
method becomes a branch of that chain. It is a pass and not a macro
because a macro sees one form and the generic's body is not decidable
until every method is in hand — a method may be written above its
generic, below it, or arrive at a reload an hour later.
That last case is why the method bodies are inlined rather than lifted.
A generic is exactly one top-level name, so adding a method to a running
program is the ordinary redefinition of one function, through the cell
every call site already goes through. session.ml names the generic
alongside the method's own declaration name for that reason. The cost,
recorded rather than hidden: a method is not separately callable and is
not a frame of its own.
A dispatch that finds no method signals NoMethod, a prelude struct
carrying the generic's name and the dispatch value that missed. A
condition and not a trap, because a miss is something a program can be
written to answer, and handler-case around the call is the shape. Its
value field is dyn, the first condition here with one; the per-type
descriptor an item-2 struct carries is what the collector reaches it by.
No restart is established at the miss, which is BoundsError's decision
taken for BoundsError's reason.
Both backends, identically: the two new runtime entry points are
declared in emit.ml and the x86 backend needs nothing, since a dyn call
is a dyn call there. Deferred and written down in FIX.org: inheritance,
multi-argument dispatch, :before/:after/:around, named-slot
construction, unknown-slot checking, and computed dispatch values.
