Threats affecting pkg:bitnami/couchdb

### Summary In affected versions, the SDK's Streamable HTTP and SSE client transports followed HTTP redirects to any host. If the configured MCP endpoint answered with a redirect to a different origin: - custom headers set on the client (for example an `X-API-Key` credential) were sent to that origin, and - on a `307` or `308` redirect the request body was re-sent there too. The SDK's OAuth client providers followed redirects on their own discovery, registration and token requests in the same way. A lone `Authorization` bearer header was not exposed; the HTTP library already drops it on cross-origin redirects. Anyone able to make an endpoint you trust redirect elsewhere (a stale redirect to a lapsed domain, a misrouted proxy rule, redirect logic an attacker can influence) could capture that material. A server that is itself malicious gains nothing this way; it already receives your requests directly. ### Am I affected? Yes, if your code uses the SDK as an MCP client over HTTP through any of: - `streamable_http_client` (on 2.x also `Client` given an `http://` or `https://` URL) - `streamablehttp_client` or `sse_client` - `ClientSessionGroup` with HTTP server parameters - the internal `create_mcp_http_client` helper This includes an HTTP client you passed in yourself with `follow_redirects=True`. Affected versions: 1.8.0 through 1.29.1, and 2.0.0 through 2.1.1. Not affected: - MCP servers - stdio clients - a client you supplied with `follow_redirects` left at its default of `False` ### Fix Upgrade to `mcp` 1.30.0 (1.x) or 2.2.0 (2.x) or later; no code changes are needed. The transports, and the OAuth providers' own requests, now follow a redirect only when it stays on the endpoint's origin (same scheme, host and port, or an `http` to `https` upgrade on the same host) and keeps the request method. Any other redirect is not followed and the request fails with an error naming the target (`MCPError` on 2.x, `httpx.HTTPStatusError` on 1.x), whichever HTTP client the transport uses. The internal `create_mcp_http_client` helper no longer turns redirect following on, so code calling it directly now receives the redirect response instead. If your client currently reaches its server through a redirect to another host, including a server that needs no credentials, it will stop connecting after the upgrade: set the endpoint URL to the redirect's target. Until you can upgrade, supply your own HTTP client with `follow_redirects` left at `False` (`http_client=` on `streamable_http_client`; `httpx_client_factory=` on `sse_client` and `streamablehttp_client`; `ClientSessionGroup` has no such parameter). If a client may already have followed a redirect to a host you do not control, rotate the credentials it carried. <details> <summary>If you genuinely need the old behaviour (unsupported)</summary> This restores what this advisory fixes: redirects to any host are followed again, carrying your custom headers and, on `307`/`308`, the request body, OAuth token requests included. Prefer setting the endpoint URL to the redirect's target. If you cannot, and you accept forwarding credentials to the redirect target, give the transport an HTTP client that follows redirects regardless of what the SDK asks for: ```python import httpx2 # on 1.x: import httpx and subclass httpx.AsyncClient instead class FollowRedirectsAnyway(httpx2.AsyncClient): """Follows redirects to ANY origin. Deliberately gives up the SDK's same-origin protection.""" async def send(self, request, *, follow_redirects=False, **kwargs): return await super().send(request, follow_redirects=True, **kwargs) http_client = FollowRedirectsAnyway(timeout=httpx2.Timeout(30, read=300)) # streamable_http_client(url, http_client=http_client) # sse_client / streamablehttp_client take a factory instead: def client_factory(headers=None, timeout=None, auth=None): return FollowRedirectsAnyway(headers=headers, auth=auth, timeout=timeout if timeout is not None else httpx2.Timeout(30, read=300)) # sse_client(url, httpx_client_factory=client_factory) ``` The redirect handling is then the HTTP library's own, as before the fix: a lone `Authorization` header is still dropped on cross-origin hops and `301`/`302`/`303` become `GET`. It is not something the SDK supports or tests. </details> ---

### Summary In affected versions, the SDK's server-side bearer authentication had no way to check that a token was issued for your server (its audience). Where one authorization server issues tokens for several services, a valid token for another service was also accepted by your MCP server. ### Am I affected? Yes, if your HTTP server uses the SDK's bearer authentication (`auth=AuthSettings(...)` with `token_verifier=`), its authorization server also issues tokens for other services, and your `TokenVerifier` does not check the token's audience (`aud`) itself. Affected versions: - `mcp` 1.10.0 through 1.29.1 - `mcp` 2.0.0 through 2.1.1 ### Fix Upgrade to: - 1.x: `mcp` 1.30.0 or later - 2.x: `mcp` 2.2.0 or later **Upgrading alone changes nothing.** The patched versions add a `validate_token_resource` setting that is off unless you set it. To turn the check on, make both of these changes together: 1. Set `validate_token_resource=True` in `AuthSettings`, with `resource_server_url` set to the audience your authorization server puts in tokens for your server. 2. Return the token's audience from `verify_token()` as `AccessToken.resource`. A token for another service then gets `401`. With only the first change, every request gets `401`. If your `TokenVerifier` already checks the audience, set `validate_token_resource=False` to silence the deprecation warning. The setting will default to `True` in 3.0. If you cannot upgrade yet, reject any token whose `aud` does not include your server inside `verify_token()`. That closes the issue on every version.

### Summary Authlib's RFC 9101 (JAR) extension passes the attacker-controlled `request_uri` authorization parameter straight to the `get_request_object()` fetch hook with no validation, at a pre-authentication endpoint. Authlib already defines the pre-registration allowlist for this (`request_uris` client metadata and `require_request_uri_registration` server metadata) but the extension never consults it, and both docstrings instruct integrators to implement the hook as an unrestricted `requests.get(request_uri)`. Deployments following the documented pattern get an unauthenticated SSRF primitive. ### Details Verified against authlib 1.7.2 and current `main`. All line numbers below are from `authlib/oauth2/rfc9101/authorization_server.py`. The extension registers itself on the `before_get_authorization_grant` hook (lines 62-65), so it runs on every authorization request before any user or client authentication. `support_request_uri` defaults to `True` (line 58). The only gate before the sink is that `client_id` names an existing client (lines 91-103). A `client_id` is a public, non-secret identifier. The sink at line 159 forwards the raw parameter with no scheme, host, or allowlist check: ```python def _get_raw_request_object(self, request: OAuth2Request) -> str: if "request_uri" in request.payload.data: raw_request_object = self.get_request_object( request.payload.data["request_uri"] ) if not raw_request_object: raise InvalidRequestUriError(state=request.payload.state) ``` `get_request_object` is abstract (line 213, `raise NotImplementedError()` at line 225), so authlib itself performs no outbound request. The defect is that authlib supplies unvalidated attacker input to that extension point and then documents the insecure implementation twice — in the class docstring (lines 34-38) and in the hook's own docstring (lines 218-223): ```python def get_request_object(self, request_uri: str): try: return requests.get(request_uri).text except requests.Exception: return None ``` Two points sharpen this beyond a generic documentation issue: - **The allowlist already exists and is ignored.** Authlib validates `request_uris` as client metadata (`authlib/oauth2/rfc7591/claims.py:319`) and `require_request_uri_registration` as server metadata (`authlib/oauth2/rfc8414/models.py:263`). The `rfc9101` package contains zero references to either name, so the pre-registration model is never enforced at the point of use. - **RFC 9101 §10.4.1 asks for controls that are absent.** It states the server should "a) check that the value of the `request_uri` parameter does not point to an unexpected location, b) check that the media type of the response is `application/oauth-authz-req+jwt`, c) implement a timeout for obtaining the content of `request_uri`, and d) not perform recursive GET on the `request_uri`." The extension implements none of these and the documented example implements none of them either. The two failure paths are distinguishable, which supplies the inference channel for a blind SSRF: a falsy fetch result raises `InvalidRequestUriError` (`invalid_request_uri`, lines 162-163), while a successful fetch of non-JWT content raises `InvalidRequestObjectError` (`invalid_request_object`, line 186). ### PoC This demonstrates the library-level defect with no network egress required: it shows the unvalidated URI reaching the fetch hook pre-authentication. ```bash python -m venv .venv && .venv/bin/pip install authlib ``` ```python from authlib.oauth2.rfc6749.requests import BasicOAuth2Payload, OAuth2Request from authlib.oauth2.rfc9101 import JWTAuthenticationRequest reached = [] class Extension(JWTAuthenticationRequest): def get_request_object(self, request_uri): reached.append(request_uri) # the docstring puts requests.get(request_uri) here return None def resolve_client_public_key(self, client): return {"keys": []} def get_server_metadata(self): return {} def get_client_require_signed_request_object(self, client): return False class AuthorizationServer: def query_client(self, client_id): return object() uri = "http://169.254.169.254/latest/meta-data/" request = OAuth2Request("GET", "https://as.example/authorize") request.payload = BasicOAuth2Payload({"client_id": "demo", "request_uri": uri}) try: Extension().parse_authorization_request(AuthorizationServer(), request) except Exception as exc: print("error:", type(exc).__name__) print("fetch hook received:", reached) ``` Output on authlib 1.7.2: ```text error: InvalidRequestUriError fetch hook received: ['http://169.254.169.254/latest/meta-data/'] ``` Against a deployment that used the docstring implementation, the equivalent unauthenticated request is: ```text GET /authorize?response_type=code&client_id=demo&request_uri=http%3A%2F%2F169.254.169.254%2Flatest%2Fmeta-data%2F ``` Returning a fetched

## Report metadata | Field | Value | | --- | --- | | Package | `authlib` (PyPI, `pkg:pypi/authlib`) | | Repository | https://github.com/authlib/authlib | | Component | `authlib.oidc.core.grants.implicit.OpenIDImplicitGrant.validate_authorization_request` | | Vulnerability class | Authorization bypass: a client's scope restriction is bypassed for OpenID Connect ID token issuance | | Verified against | `c529a61af40e3efe05286140e00fbdced07d7987` (v1.8.0). Earlier releases were not checked. | | API surface | Public API (`OpenIDImplicitGrant`, registered with `server.register_grant(...)`) | | Affected in default configuration | Yes. No non-default option is needed once `OpenIDImplicitGrant` is registered. Client metadata decides exposure: Authlib's standard `ClientMixin` checks response type and scope independently, so a client can be permitted `id_token` responses without being allowed the `openid` scope. | ## Summary `OpenIDImplicitGrant.validate_authorization_request()` first runs the parent `ImplicitGrant` validation, which filters the requested scope through `client.get_allowed_scope()` and stores the result in `request.scope`. It then decides whether this is an OpenID request by checking the raw, client-supplied `request.payload.scope` instead of that filtered value. A client that is allowed `profile` but not `openid` can therefore request `scope=openid profile`, pass the check, and receive a signed ID token (with `sub` and profile claims) once the user consents. This happens even when Authlib's built-in, scope-filtering `BearerTokenGenerator` is in use. The tainted input is the authorization request's `scope` parameter. The OAuth client fully controls it, and the client is the very party the scope restriction is meant to constrain. Any registered client can add `openid` to its request if it is permitted an `id_token` or `id_token token` response type and its allowed scopes exclude `openid` but include a claim-bearing scope such as `profile`. Sibling paths treat the same client correctly, which suggests the raw-scope check is a bug rather than intended behaviour: - `ImplicitGrant.validate_authorization_request()` -> filters the requested scope through `client.get_allowed_scope()` into `request.scope` (safe, [`authlib/oauth2/rfc6749/grants/implicit.py` lines 141-147](https://github.com/authlib/authlib/blob/c529a61af40e3efe05286140e00fbdced07d7987/authlib/oauth2/rfc6749/grants/implicit.py#L141-L147)) - `OpenIDImplicitGrant.validate_authorization_request()` -> **checks the raw `request.payload.scope` (unsafe, [`authlib/oidc/core/grants/implicit.py` line 72](https://github.com/authlib/authlib/blob/c529a61af40e3efe05286140e00fbdced07d7987/authlib/oidc/core/grants/implicit.py#L72))** - `UserInfoEndpoint` -> rejects the same client's access token with 403 `insufficient_scope` (safe; observed during verification, line not recorded) - OIDC authorization code flow -> issues no `id_token` for the same client (safe; observed during verification, line not recorded) ## Impact A registered OAuth client that the operator has excluded from the `openid` scope can get an OpenID Connect ID token for any user who logs in and approves its authorization request. During verification the provider returned an RS256-signed ID token carrying `iss`, `aud` (the requesting client), `nonce`, `auth_time`, `at_hash`, `sub` and `name`, while the granted scope was only `profile`. A consent page built the way the Authlib docs show lists only `profile`, so the user is not shown that an identity token will be issued. Without this bug, the same request fails with `InvalidScopeError` ("Missing 'openid' scope") because the client's resolved scope does not include `openid`. The new capability is the ID token itself: a signed assertion of the user's identity (`sub`) plus claims from the client's other allowed scopes. Gating that token is exactly what the `openid` scope is for. The access token stays restricted when the built-in token generator is used: Authlib's `UserInfoEndpoint` rejects it with 403 `insufficient_scope`. **Scoring note:** we did not compute a CVSS score. An initial triage rated this High. After dynamic verification we assess practical severity as closer to Medium, because: 1. The attacker must be a registered client that is permitted `id_token` response types. 2. The user must log in and consent. 3. The ID token's `aud` is the attacking client. Two kinds of deployment are not affected: - Deployments that use only the OIDC authorization code flow. During verification, that flow issued no ID token for the same client. - Deployments where every client permitted an `id_token` or `id_token token` response type is also allowed the `openid` scope. ## Preconditions 1. The authorization server registers `OpenIDImplicitGrant` (or a subclass), e.g. `server.register_grant(MyOpenIDImplicitGrant)`. The vulnerable method runs on every OIDC implicit authorization request. 2. A client's metadata permits an OIDC implicit response type

## Description ### Summary Authlib's default RFC 7523 JWT bearer grant leaves `get_audiences()` empty, so `verify_claims()` only checks that an `aud` claim *exists* instead of requiring it to match the current authorization server's token endpoint. An attacker holding a legitimately issued JWT assertion for *any* audience can present it to a different authorization server sharing the same signing key and obtain an access token. To be completely transparent, AI tools helped surface it. However, we have independently reproduced and carefully validated the issue. We follow responsible disclosure practices and are sharing this privately. ### Affected Entrypoints - `authlib.oauth2.rfc7523.JWTBearerGrant` — default `get_audiences()` returns empty list - `authlib.jose.jwt.decode()` with `claims_options` for audience validation - `authlib.integrations.flask_oauth2.ResourceProtector.validate_request()` when audience checking is enabled ### Exploit Path ``` 1. Attacker authenticates to Service A (low-privilege) 2. Authorization server issues JWT with "aud": "https://evil.test/token" 3. Attacker presents this assertion to Service B's token endpoint 4. Service B uses default JWTBearerGrant (get_audiences() = []) 5. verify_claims() only checks aud *exists*, not its value 6. Service B issues an access token — audience bypass achieved ``` ### Proof of Concept ```python #!/usr/bin/env python3 """ Demonstrates that the default JWTBearerGrant accepts JWT assertions whose audience does not match the token endpoint, while a strict audience override correctly rejects them. """ import json import os import sys from joserfc.jwk import KeySet, OctKey WRONG_AUDIENCE = "https://evil.test/token" EXPECTED_AUDIENCE = "https://provider.test/token" GRANT_TYPE = "urn:ietf:params:oauth:grant-type:jwt-bearer" def build_and_exercise(strict_audience: bool) -> tuple[int, dict]: from authlib.oauth2.rfc7523 import JWTBearerGrant as BaseJWTBearerGrant # Uses Authlib's own Flask test fixtures from tests.flask.test_oauth2.models import Client, User, db from tests.flask.test_oauth2.oauth2_server import ( create_authorization_server, create_flask_app, ) class JWTBearerGrant(BaseJWTBearerGrant): def resolve_issuer_client(self, issuer): return Client.query.filter_by(client_id=issuer).first() def resolve_client_public_key(self, client): return KeySet([ OctKey.import_key("foo", {"kid": "1"}), OctKey.import_key("bar", {"kid": "2"}), ]) def authenticate_user(self, subject): return None def has_granted_permission(self, client, user): return True # Only override get_audiences when testing strict mode if strict_audience: def get_audiences(self): return [EXPECTED_AUDIENCE] app = create_flask_app() os.environ["AUTHLIB_INSECURE_TRANSPORT"] = "true" with app.app_context(): db.init_app(app) db.create_all() user = User(username="demo-user") db.session.add(user) db.session.commit() client = Client( user_id=user.id, client_id="client-id", client_secret="client-secret", ) client.set_client_metadata({ "scope": "profile", "redirect_uris": ["https://client.test/authorized"], "grant_types": [GRANT_TYPE], }) db.session.add(client) db.session.commit() server = create_authorization_server(app) server.register_grant(JWTBearerGrant) # Sign assertion with WRONG audience assertion = JWTBearerGrant.sign( "foo", issuer="client-id", audience=WRONG_AUDIENCE, # <-- Not the expected audience subject=None, header={"alg": "HS256", "kid": "1"}, ) rv = app.test_client().post( "/oauth/token", data={"grant_type": GRANT_TYPE, "assertion": assertion}, ) body = json.loads(rv.data) db.session.remove() db.drop_all() return rv.status_code, body def main() -> int: # Test 1: Default grant (no audience enforcement) vuln_status, vuln_body = build_and_exercise(strict_audience=False) # Test 2: Strict audience grant (correct behavior) strict_status, strict_body = build_and_exercise(strict_audience=True) result = { "wrong_audience": WRONG_AUDIENCE, "expected_audience": EXPECTED_AUDIENCE, "vulnerable_status": vuln_status, "vulnerable_body": vuln_body, "strict_status": strict_status, "strict_body": strict_body, } print(json.dumps(result, indent=2, sort_keys=True)) if ( vuln_status == 200 and "access_token" in vuln_body and strict_body.get("error") == "invalid_grant" ): print( "POC_SUCCESS: default JWTBearerGrant issu

### Summary `OpenIDMixin.parse_id_token()` reads the `nonce_supported` claim from the ID token it is validating. When that claim is boolean `false`, the expected nonce is set to `None` and nonce validation is skipped for that token. An ID token that carries this claim is therefore accepted in a session whose nonce does not match. A captured, validly signed ID token belonging to a victim can be replayed into an attacker-controlled session, authenticating the attacker as the victim at the relying party. The code is identical in `authlib/integrations/base_client/sync_openid.py:82-83` and `authlib/integrations/base_client/async_openid.py:84-85`, so all framework integrations are affected. Fixed versions: none; reproduced on 1.8.0 (commit c529a61a). Preconditions: the ID token must carry a valid signature and pass `iss` and `aud` validation, and the attacker must be able to supply it to `parse_id_token()`. Authorization code flow is not affected. Implicit and hybrid relying parties, and applications calling `parse_id_token()` directly, are affected. ### Details ## Affected code `authlib/integrations/base_client/sync_openid.py:80-85`, in `parse_id_token()`: ```python claims = claims_cls(token.claims, token.header, claims_options, claims_params) # https://github.com/authlib/authlib/issues/259 if claims.get("nonce_supported") is False: claims.params["nonce"] = None claims.validate(leeway=leeway) ``` `authlib/integrations/base_client/async_openid.py:82-86` contains the same code. ## Source of the claim `claims` is constructed from `token.claims`, which is the decoded payload of the ID token passed to `parse_id_token()`: ```python token = jwt.decode( token["id_token"], key=key_set, registry=JWSRegistry(algorithms=alg_values, strict_check_header=False), ) ... claims = claims_cls(token.claims, token.header, claims_options, claims_params) ``` `claims.get("nonce_supported")` therefore resolves against the ID token payload. It is not read from `load_server_metadata()`, from client configuration, or from any other source under the relying party's control. ## Effect on validation `IDToken.validate_nonce()` at `authlib/oidc/core/claims.py:69-83` performs the comparison only when the expected value is truthy: ```python nonce_value = self.params.get("nonce") if nonce_value: if "nonce" not in self: raise MissingClaimError("nonce") if nonce_value != self["nonce"]: raise InvalidClaimError("nonce") ``` Assigning `claims.params["nonce"] = None` makes `nonce_value` falsy, so both the presence check and the equality check are skipped. No error is raised and `claims.validate()` completes normally. The docstring of that same method states the requirement: > If present in the ID Token, Clients MUST verify that the nonce Claim Value is equal to the value of the nonce parameter sent in the Authentication Request. ## Trigger condition The comparison is `is False`, so only a JSON boolean `false` activates the branch. A string value `"false"` does not, and nonce validation proceeds normally in that case. ## Origin The branch was added in commit `3ca7333c` ("Skip verifying nonce for Apple case") to accommodate a provider that emits a `nonce_supported` claim, as referenced by the inline comment pointing to issue #259. ## Remediation Read the flag from server metadata or client configuration rather than from the token: ```python metadata = self.load_server_metadata() if metadata.get("nonce_supported") is False: claims.params["nonce"] = None ``` This preserves the behavior for relying parties configured against a provider that does not support nonces, while preventing the token from determining whether it is subject to nonce validation. ### Proof of concept ## Environment - authlib 1.8.0, commit `c529a61a` (tag `v1.8.0`) - Python 3.14 - joserfc 1.7.5 - No network access required ``` git clone https://github.com/authlib/authlib.git && cd authlib git checkout c529a61a python3 -m venv .venv .venv/bin/pip install -e . joserfc==1.7.5 .venv/bin/python poc.py ``` ## Configuration The relying party is a subclass of the shipped `OpenIDMixin` supplying only `client_id` and `load_server_metadata()`. `fetch_jwk_set()` returns `metadata["jwks"]` directly when the key set is present in metadata, so no HTTP request is made and no part of the validation path is stubbed. The signing key is a generated RSA key. All three tokens are signed with it, carry `iss` and `aud` matching the relying party configuration, and are within their validity window. The relying party's session nonce is `nonce-the-rp-actually-generated`; every token carries the different nonce `nonce-from-the-captured-token`. ## poc.py ```python from joserfc import jwt from joserfc.jwk import RSAKey from authlib.integrations.base_client.sync_openid import OpenIDMixin ISSUER = "https://as.example" CLIENT_ID = "rp-client" KEY = RSAKey.generate_key(2048, parameters={"kid": "k1"}) JWKS = {"keys": [KEY.as_dict(private=Fal

Authlib versions up to 1.7.2 accept an empty HMAC key for JWS/JWT signature verification using HS256, HS384, and HS512 algorithms. This allows an attacker to forge tokens with arbitrary claims that pass signature verification if the application verifies tokens with an empty key. The vulnerability arises because the library does not reject zero-length keys, resulting in a deterministic, publicly reproducible HMAC digest. This flaw can lead to token forgery and authentication bypass in OAuth 2.0 resource servers and OIDC relying parties using Authlib. A fix is available in version 2.15.0_5.

CVE-2026-114615 is a vulnerability in the mcpm product's use of authlib.jose where an incomplete fix for an algorithm confusion issue allows an attacker to forge HMAC signatures. The flaw arises because the check preventing asymmetric public keys from being used as HMAC secrets only matches keys starting exactly at byte 0, while the loader accepts keys with leading whitespace or comments. This discrepancy allows an attacker with only the issuer's public key to create a forged HS256 token that is accepted as authentic. The vulnerability affects versions >=2.1.0 and <2.15.0_5 and was fixed in version 2.15.0_5.

### Summary `authlib.common.security.is_secure_transport()` is used throughout Authlib to enforce the OAuth 2.0 / OIDC requirement that endpoint and redirect URIs use TLS, with an RFC 8252 §7.3 exemption for loopback `http://` URIs. The check is implemented as a textual `str.startswith` prefix match, so a URL such as `http://localhost:80@evil.example/cb` — whose actual host is `evil.example` and whose scheme is plain `http` — is accepted as "secure". An attacker who can supply a URL to any of the sinks that rely on this check (OIDC RP-Initiated Logout dynamic client registration, RFC 8414 authorization-server metadata validation, error-redirect rendering) can smuggle a cleartext non-loopback URL past the TLS-required guard. This is a defense-in-depth / spec-conformance failure; severity is low. ### Details **Affected versions:** `authlib >= 0.13, <= 1.7.2` (all releases containing the loopback prefix exemption; verified against 1.7.2, the current latest) The vulnerable function, from `authlib/common/security.py` at v1.7.2: ```python 13 def is_secure_transport(uri): 14 """Check if the uri is over ssl.""" 15 if os.getenv("AUTHLIB_INSECURE_TRANSPORT"): 16 return True 17 18 uri = uri.lower() 19 return uri.startswith( 20 ("https://", "http://localhost:", "http://127.0.0.1:", "http://[::1]:") 21 ) ``` Per RFC 3986 §3.2 the authority component of a URI is `[ userinfo "@" ] host [ ":" port ]`. The URL `http://localhost:80@evil.example/cb` therefore has userinfo `localhost:80` and host `evil.example`. Because the check is a raw prefix match against the full URL string, the `http://localhost:` prefix matches the userinfo portion and the function returns `True` even though the scheme is `http` and the host is an arbitrary external name. The trailing `:` in each allow-list entry — presumably intended to force a `host:port` shape and reject `http://localhost.evil.com` — is also satisfied by the `user:password` separator inside userinfo, so `http://localhost:@evil.example/` matches too. The same construction works against all three loopback prefixes (`http://127.0.0.1:...@evil.example/`, `http://[::1]:...@evil.example/`). `is_secure_transport()` is consumed at the following locations in v1.7.2, none of which independently reject URLs containing a userinfo component: - `authlib/oidc/rpinitiated/registration.py:50-57` — validation of `post_logout_redirect_uris` during OIDC dynamic client registration for public clients (`token_endpoint_auth_method == "none"`). The preceding `is_valid_url()` check (`authlib/common/urls.py:142-146`) only requires `parsed.scheme and parsed.hostname` and does **not** reject userinfo, so the crafted URL passes both guards. A public client can therefore register `http://localhost:80@attacker.example/cb` as a post-logout redirect target; the OpenID Provider will later 302 the end-user's browser to that cleartext non-loopback URL (carrying `state`). - `authlib/oauth2/rfc8414/models.py:61,75,100,115,123,248,284` — validation of `issuer`, `authorization_endpoint`, `token_endpoint`, `jwks_uri`, `registration_endpoint`, `revocation_endpoint`, `introspection_endpoint` in Authorization Server Metadata / OIDC Discovery documents. A relying party using `AuthorizationServerMetadata.validate()` would accept endpoint values of this form as satisfying the "MUST use https" requirement when they do not. - `authlib/oidc/rpinitiated/discovery.py:12` — validation of `end_session_endpoint` in provider metadata. - `authlib/oauth2/rfc6749/errors.py:64` and `authlib/oauth1/rfc5849/errors.py:33` — governs how `redirect_uri` is rendered in error bodies (cosmetic). The `http://localhost:` prefix was introduced in commit `0225c86b` (first released in v0.13); `http://127.0.0.1:` and `http://[::1]:` were added later in the 1.6.x line. All variants share the same prefix-match weakness. ### PoC Against the current latest release (1.7.2): ```sh python3 -m venv venv ./venv/bin/pip install 'authlib==1.7.2' ./venv/bin/python poc.py ``` `poc.py`: ```python #!/usr/bin/env python3 """ is_secure_transport() must return True only for https:// URLs, or http:// URLs whose host is a loopback address (localhost / 127.0.0.1 / ::1). Bypass: http://localhost:80@evil.example/cb has host 'evil.example' (userinfo = 'localhost:80') per RFC 3986, but matches the prefix 'http://localhost:' and is therefore accepted as secure. """ from urllib.parse import urlparse from authlib.common.security import is_secure_transport cases = [ "http://localhost:80@evil.example/cb", "http://127.0.0.1:80@evil.example/cb", "http://localhost:@evil.example/cb", ] vulnerable = False for url in cases: parsed = urlparse(url) ok = is_secure_transport(url) print(f"is_secure_transport({url!r}) = {ok} " f"[actual host = {parsed.hostname!r}, scheme = {parsed.scheme!r}]") if ok and parsed.hostname not in ("localhost", "127.0.0.1", "::1") and parsed.scheme != "https": vulner

A vulnerability in dnspython's dns.name.from_wire_parser() function allows a maliciously crafted DNS message to cause excessive CPU usage during DNS name decompression. This can degrade application performance or lead to denial of service (DoS) when processing untrusted DNS wire format messages. The issue is fixed in dnspython version 2.15.0_5. No known workarounds exist.

`SoftReadWriteLock` (and `AsyncSoftReadWriteLock`, which wraps one) checks once per lock object, by name, that `<path>.rw`, `<path>.rw/gen` and `<path>.rw/holders` are real directories and not symbolic links (files that redirect to another path). It then keeps only a boolean. Every later record operation resolves the full path again, and `O_NOFOLLOW` (a flag that makes an open fail when the final name is a symbolic link) protects the last component only. Another local user (the other user below) who can write the directory holding the lock, or who created `<path>.rw` first in a sticky directory such as `/tmp` (the sticky bit is a directory flag that lets only a file's owner rename or remove it), can put a tree under that name whose `gen` or `holders` is a symbolic link into a directory of the user running the lock (the lock user below). A long-running process of the lock user that has already passed the check then creates, renames over and deletes files there with the lock user's privileges, including in `0700` directories the other user cannot open. The names and bytes are filelock's own lock records, not chosen by the other user. The scanner's reproducer replaces `.git/HEAD` in the lock user's private repository so that `git status` fails. There is no race. Affected versions: filelock >= 4.1.0 and <= 4.2.0. Anthropic's OSS Scanner reported it in private as `ANT-2026-WXXRI4M4` [high, CWE-367], titled "SoftReadWriteLock follows gen dir swapped for a symlink after first acquire". ## Severity **CVSS:3.1/AV:L/AC:L/PR:L/UI:N/S:U/C:N/I:L/A:N, 3.3 (Low).** `AV:L` (local): the other user needs an account on the same host. `AC:L` (low attack complexity): the swap happens between two acquisitions, with no race to win. `PR:L` (low privileges): a local user with ordinary privileges is enough. `UI:N` (no user interaction): the lock user's process acts on its own. `C:N` (no confidentiality impact): the other user learns nothing. `I:L` (low integrity impact): the lock user's process replaces a file named `HEAD`, creates `epoch` and generation records, and deletes files whose names match the protocol's patterns, in any directory the lock user can write, with the lock user's privileges. The other user does not choose the bytes, but the files are gone and the chosen directory (a git repository) stops working. `A:N` (no availability impact): the lock itself keeps working and the lock user's process does not stall. The scanner rated it high; we scored the vector for a lock user with ordinary privileges. Classification from the external review: conditional security. It is a cross-user replacement of a cached `.rw` tree that redirects later writes of the lock user through an intermediate symbolic link. It needs a planted tree in sticky `/tmp` or a writable parent without the sticky bit. Scoring note: we rate integrity low rather than high. The bytes written through the swapped tree are filelock's own records, not content the other user chose, so the lower reading of the CVSS integrity metric applies. ## Scope and preconditions - Trust boundary: the other party is a different local account with write access to the lock's parent directory. Without the sticky bit (a `0777` scratch or spool directory, or a group-writable project or cache directory shared with that account's group) write access alone is enough. The other user renames the lock user's own `0700` `<path>.rw` aside and puts its tree in place. In a sticky parent such as `/tmp` the extra precondition is that it created `<path>.rw` (with real `gen` and `holders` directories, mode `0777`) before the lock user's first acquire. `prepare()` accepts an existing tree whoever owns it, and the other user later replaces its own `gen` with a symbolic link. `fs.protected_symlinks=1` (a Linux setting that refuses to follow another user's symbolic link in a world-writable sticky directory) does not intervene, because the link sits inside the other user's own non-sticky `<path>.rw`, not in the sticky parent (the scanner ran with that setting). - Lock user: any process that keeps one `SoftReadWriteLock` or `AsyncSoftReadWriteLock` object (a singleton per path by default) and acquires it more than once, or is waiting for it when the swap happens. A fresh process that meets the planted tree gets `RuntimeError`. Between two acquisitions there is no timing to win. - Targets: any directory the lock user can write, on any filesystem. The other user needs only to know its path (`/home/victim/project/.git` in the reproducer, under a `0700` home directory the other user cannot open). - Platform: observed on Linux. The code path is the same on every POSIX platform and on Windows, where a junction (a Windows directory that points at another directory) at a directory component plays the symbolic link's part. The scanner ran Linux only. - Ancestor boundary: protection against another local user is possible only while no other user can replace the lock's directory or any of its ancestors. That

A vulnerability in filelock's ReadWriteLock and AsyncReadWriteLock components allows a local user with write permissions to the directory containing the SQLite lock database to manipulate symlinks or journal files. This manipulation can cause the lock user’s SQLite-backed lock to write arbitrary data into their own files, create or unlink files, or cause lock acquisition failures. The issue affects filelock versions from 3.20.4 through 4.2.0, with the fixed version being 1.79.0_1. The vulnerability requires a writable directory without the sticky bit, such as a 0777 or group-writable directory, and is limited to local users on the same host. The CVSS 3.1 score is 7.1 (High), reflecting high integrity and availability impacts but no confidentiality impact.

`SoftFileLock`, `MarkerSoftFileLock`, `SoftFileLease`, their async variants and a `FileLock` that has fallen back to a soft lock on `ENOSYS` decide from the record inside the marker file whether its owner is gone. The marker is the file whose presence says a process holds the lock. They do not check who could have written that record. A local user who can write the marker but cannot remove it rewrites the holder's record to name a dead PID (process id). That position arises with an explicit `mode` with group or other write bits, or the default mode under a lax umask (the process setting that strips permission bits from new files), in a sticky or otherwise non-removable directory. The sticky bit is a directory flag that lets only a file's owner remove or rename it. The next contender running as the holder's account, or root, judges the lock stale, removes the live marker on that user's behalf and acquires it. Two processes then run the critical section together and neither gets an error. Affected versions are filelock 3.22.0 through 4.2.0 (finding `ANT-2026-W1H9NXUH`). ## Severity **CVSS 3.1 `CVSS:3.1/AV:L/AC:H/PR:L/UI:N/S:U/C:N/I:H/A:N` scores 4.7 (Medium).** `AV:L` (local): the other user needs an account on the same host. `PR:L` (low privileges): an ordinary account is enough. `UI:N` (no user interaction). `AC:H` (high attack complexity): the marker must carry group or other write bits (an explicit permissive `mode`, or umask `002`/`000` with a shared group), and a contender of the holder's account must ask for the lock while the forged record is in place. `I:H` (high integrity impact): two holders then write whatever the lock protects, and the holder is not told. `C:N` and `A:N` (no confidentiality or availability impact). `S:U` (scope unchanged). Classification from the review: **security, conditional** on another user being able to write the live marker. The scanner rated it high (CWE-345). The default mode under umask `022` is not affected. ## Scope and preconditions - The other user can write the marker. The application passes a `mode` with group or other write bits, which `fchmod` applies as given since 4.1.0. `0o666` is a common choice for a lock shared between accounts, although a soft-lock contender of another account waits as well on a `0o644` marker, since contenders only read and rename. Or the application uses the default mode (`0o666` through the umask) under umask `002` in a directory whose group the other user belongs to, or under umask `000`. The default mode under umask `022` is not affected. - The other user cannot remove the marker itself: the directory is sticky, or the other user cannot write it at all (a `0755` directory owned by the lock's user gives the same overlap). In a non-sticky shared directory the other user can unlink the marker without filelock, and filelock adds nothing. - A contender that may rename the marker asks for the lock: another process of the holder's account (several workers of one user) or root. A contender of another unprivileged account cannot rename the marker in a sticky directory and times out. - The finding reaches every class that publishes a soft marker: `SoftFileLock`, `MarkerSoftFileLock`, `SoftFileLease`, their async variants, and `FileLock(mode=0o666)` on a filesystem where `flock` (a kernel lock on an open file) fails with `ENOSYS`. These protections against another local user hold only when no other user can replace the lock's directory or any of its ancestors. That holds when each ancestor belongs to the user or root and is either not writable by others or sticky. A user who can rename entries in a non-sticky directory above the lock controls every name below it, which no file-based lock can defend against. ## Affected code At the scanned commit b831496: the create mode in [`SoftFileLock._acquire`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_soft.py#L67-L71), the explicit-mode `fchmod` in [`_apply_explicit_mode`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_soft.py#L100-L105), the trusting verdict in [`_try_break_stale_lock`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_soft.py#L107-L123) and the [`owner_is_stale`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_identity.py#L64-L79) it relies on; the same call in [`MarkerSoftFileLock`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_marker.py#L74-L81) and [`SoftFileLease`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_lease.py#L229-L256). ## Introduced The stale verdict that trusts the record came in with e35c3afac473 ("feat(soft): detect and break stale locks", #476, 2026-02-13), first released in 3.22.0. From then on a marker left group- or other-writable by the umask is forgeable. The re

`StrictSoftFileLock` and `AsyncStrictSoftFileLock` check `<path>.filelock` (the coordination directory that holds the lock's state) with one `lstat` call on its name. `lstat` reports what a name is without following a symbolic link (a file that redirects to another path). After that check, the code reaches `<path>.filelock/claims` by pathname for every later operation (`mkdir`, scan, publish, link, unlink). `_open_directory` passes `O_NOFOLLOW` (a flag that makes an open fail when the final name is a symbolic link), but the flag covers only the final `claims` component. The kernel follows a symbolic link in any earlier component. Another local user (the other user below) who can rename `<path>.filelock` exchanges it for a symbolic link after the check. In a shared directory without the sticky bit (a directory flag that lets only a file's owner rename or remove it), any user with write access can do this. Where the shared directory is sticky, such as `/tmp`, only the user who created `<path>.filelock` before the user running the lock (the lock user below) first used it can. The lock user's process (root's, if root takes the lock) then creates a `claims` directory and claim files (the files whose presence says a process wants or holds the lock) inside a directory the other user chooses but only the lock user can write. When the link points at another strict lock's `.filelock` directory, the stranded claims make that lock time out for every process until an operator finds and force-breaks each one. The `claims` property and `force_break()` resolve the same path with no check at all. Affected versions: filelock >= 3.30.0 and <= 4.2.0 (finding `ANT-2026-SVFEYX89`). ## Severity **CVSS:3.1/AV:L/AC:H/PR:L/UI:N/S:U/C:L/I:L/A:H, 5.8 (Medium).** `AV:L` (local): the other user needs an account on the same host. `AC:H` (high attack complexity): the swap must land between the `lstat` and the next `mkdir`. The other user does not aim at that window. It flips the name in a loop with `renameat2(RENAME_EXCHANGE)` (a system call that swaps two names in one step) across repeated acquires, and won after 1 to 31 runs of the lock user's program in the scanner's trials. A sticky directory also requires it to have created `<path>.filelock` first. `PR:L` (low privileges): an unprivileged account is enough. `UI:N` (no user interaction): the lock user's process acts on its own. `C:L` (low confidentiality impact): through `claims`, one file name per planted link from a directory only the lock user can list. `I:L` (low integrity impact): a directory named `claims` and files with filelock's fixed claim names and contents appear, created with the lock user's privileges, in a directory the other user chooses but cannot write. The process overwrites or truncates nothing that exists. `A:H` (high availability impact): aimed at another strict lock of the lock user, the stranded claims deny that lock to every process until an operator finds and force-breaks each one. Classification from the review: security, conditional on the other user being able to rename the intermediate component. The scanner rated it high (CWE-363). ## Scope and preconditions - The other user can rename `<path>.filelock`. In a writable directory without the sticky bit (a `0777` or group-writable project or cache directory), any user with write permission on the directory can, even though the lock user created and owns `<path>.filelock`. In a sticky directory such as `/tmp`, only the user who created `<path>.filelock` before the lock user's first use can, because that user then owns both the directory and the symbolic link (the planting precondition of GHSA-9c4x-gm8v-wgc4). - The link's target is a directory the lock user can write. The effect that matters is on that directory. An acquire that completes through the link also holds the shared lock with its claims elsewhere, but a user who can rename `<path>.filelock` can defeat that lock's exclusion anyway. - `fs.protected_symlinks=1` (a Linux setting that refuses to follow another user's symbolic link in a world-writable sticky directory) does not interfere. The link is an intermediate path component, not the last one. In the sticky-directory case it also sits in a directory the other user owns. - Missed attempts show up to the lock user as `SoftFileLockProtocolError` or `FileNotFoundError`. The swap therefore works against a lock that a program takes more than once: a periodic job, a worker pool, or a caller that retries or waits with a timeout (each poll of a waiting acquisition is a new attempt). - The two entry points that need no race (`claims` and `force_break()` on a resting symbolic link) depend on the lock user inspecting or recovering the lock. The planted link invites this by making `acquire()` fail with a protocol error. The `force_break()` variant works only when the lock user breaks claims that name a live process on its own host without checking them first, as the recovery loop in `docs/tutorials.rst

`ReadWriteLock` and `AsyncReadWriteLock` (the SQLite-backed reader/writer lock) remove their private `.filelock-*` link directories with `shutil.rmtree` (a recursive delete) on a remembered path. They do not check that the path still names the directory they created. This happens on the hard-link route (a hard link is a second name for the same file). That route is every connection on macOS since 4.1.1 and any POSIX process without a usable `/proc/self/fd` (a Linux path that names the process's own open files), such as a chroot or container that does not mount `/proc`. Another local user who can rename entries in the directory that holds the lock database can rename one of the directories of the user running the lock (below: the lock user) onto the link directory's name, or onto a forged dead-holder name. Such a lock directory is a `0777` or group-writable cache, build or project directory without the sticky bit (a directory flag that lets only a file's owner remove or rename it). The lock user's process then deletes that tree and everything in it with the lock user's permissions, and reports no error. Stock Linux with `/proc` mounted is not affected. Affected versions are filelock 4.1.0 through 4.2.0. Anthropic's OSS Scanner reported this in private as `ANT-2026-LSSZIUEO` [high, CWE-367]: ReadWriteLock deletes any directory another user renames to .filelock-*. ## Severity **CVSS 3.1 `CVSS:3.1/AV:L/AC:L/PR:L/UI:N/S:U/C:N/I:H/A:L` scores 6.1 (Medium).** `AV:L` (local): the other user needs an account on the same host. `PR:L` (low privileges): an ordinary account is enough. `UI:N` (no user interaction). `AC:L` (low attack complexity): two `rename` calls and no race against filelock's own code. `I:H` (high integrity impact): the other user destroys a directory tree owned by the lock user, and the lock user's program reports no error. `A:L` (partial availability loss): the Python 3.11 `RecursionError` variant makes the lock user's first lock construction fail. `C:N` (no confidentiality impact): the other user learns nothing. `S:U` (scope unchanged): the effect stays within the lock user's own privileges. Classification from the external review: **conditional security**, a cross-user rename in a non-sticky shared parent that turns private-link cleanup into recursive deletion of the lock user's tree. The scanner rated it high. The review accepts the mechanism, notes that the macOS route rests on a Linux run with `/proc` hidden rather than on a run on macOS, and narrows the finding to that precondition and route. ## Scope and preconditions - The other party is a different local account with write permission on the directory that holds the lock database, where that directory has no sticky bit. That is a `0777` directory, or a group-writable one (in a setgid `2775` directory a group member can rename the lock user's sub-directory the same way). Renaming an entry needs write permission on the parent only, not on the entry. Anyone who can write the parent can rename a `0700` directory of the lock user. - Sticky directories (`/tmp` itself, any `1777` directory) stop the release variant: the rename of an entry owned by the lock user fails with `EPERM`. The dead-owner sweep still reaches a lock user's tree that sits inside a directory the other account owns there. That account may rename its own directory to a forged dead-owner name, and the lock user's sweep deletes everything inside it. The Python 3.11 `RecursionError` variant also works in a sticky directory. - Platform and route. The lock user must connect through the private hard link. That is every `ReadWriteLock` or `AsyncReadWriteLock` on macOS (since 4.1.1, #820), or a POSIX process whose `/proc/self/fd/<n>` (`/dev/fd/<n>` elsewhere) does not exist, such as a chroot or container without `/proc`. Linux with `/proc` mounted connects through the descriptor and creates no `.filelock-*` directory (checked: none appears, also with two holders in one process), so stock Linux is not affected at 4.2.0. The macOS statement rests on the `descriptor_usable` branch at line 984 and `docs/how-to.rst`. The reproducer runs the same Python code on Linux with `/proc` hidden, which takes root and is test scaffolding, not a step the other user performs. Windows does not take this route. - Target set. Only directories that sit in the shared parent itself, or that the other account can already write, are reachable. The kernel refuses to move a `0700` directory of the lock user in from another parent. A tree the other account can already write (a group-writable project tree created with umask `002`) is no gain, since that account can delete it without filelock. A lock user running as root deletes a tree of any owner. - Ancestor boundary. Protection against another local user is possible only while no other user can replace the lock's directory or any of its ancestors. That holds when each ancestor belongs to the user or root and is either not writable by others or sticky. ## Af

### Summary `ReadWriteLock` and `AsyncReadWriteLock` resolve the lock path with `pathlib.Path.resolve()` and pass it to `sqlite3.connect()` without refusing a symlink. A local user who can create names in the lock's directory, such as `/tmp` or a shared cache, can plant a symlink at the lock path and make the victim's process create, lock, or write the file it points to, or break mutual exclusion between the victim's own processes. ### Details `ReadWriteLock.__init__` stores `pathlib.Path(lock_file).resolve()`, which follows a final symlink, and every connection opens that path through `sqlite3.connect()` with no `O_NOFOLLOW` or regular-file check. SQLite's own VFS also resolves the final symlink in user space, so `fs.protected_symlinks` and the sticky bit do not help: the kernel never sees a symlink to refuse. The other lock classes do not follow a final symlink: `FileLock` opens with `O_NOFOLLOW`, and `SoftReadWriteLock` coordinates through `<path>.rw/`. ### Proof of concept On Linux, with the victim and attacker as different users and `/shared` mode 1777 with `fs.protected_symlinks=1`: 1. The attacker runs `ln -s /home/victim/private/pwned.flag /shared/app.rwlock.db`. 2. The victim constructs `ReadWriteLock("/shared/app.rwlock.db")`. A plain `os.open(..., O_NOFOLLOW)` on the same path fails, but the lock creates `/home/victim/private/pwned.flag`, owned by the victim, inside a directory the attacker cannot write. 3. With `/shared/cache.rwlock.db -> /shared/a.db`, one victim process holds the write lock. The attacker repoints the link to `/shared/b.db`, and a second victim process acquires the write lock while the first still holds it. The same behavior reproduces on macOS, on Windows 11, and through `AsyncReadWriteLock`. ### Impact A local attacker with write access to the lock directory can make the victim create empty files it owns at paths the attacker cannot write, make the victim hold a SQLite lock on another application's database so that application gets `database is locked`, and give two victim processes the write lock at once, letting them corrupt the resource the lock protects. ### Workarounds Keep `ReadWriteLock` paths in directories that only trusted users can write.

The stale-lock break shared by `SoftFileLock`, `MarkerSoftFileLock` and `SoftFileLease` (and their async variants, and a `FileLock` that has fallen back to a soft lock on `ENOSYS`, the "not implemented" error) recognises the marker it judged stale by two values. The marker is the lock file at `<path>`, whose presence says a process holds the lock. The values are its inode number (the kernel's identity for a file, independent of its name) and its modification time (mtime) not being newer. The check runs after the contender has already closed the marker, so nothing keeps the inode allocated. On a filesystem that hands a freed inode number straight to the next file (ext4, xfs, overlayfs on them) the next holder's marker can carry that number. A contender still between its read and its break then renames and unlinks the live marker. Another local user (the other user below) who can create files in the lock's directory, a sticky `/tmp` included (the sticky bit is a directory flag that lets only a file's owner remove it), forces this at will. It plants a marker with a stale owner record and a modification time in the future and unlinks it as soon as a contender has read it. Two processes of the user running the lock (the lock user below) then hold the same default-configured lock at once, and nothing raises or logs. Affected versions: filelock >= 3.22.0 and <= 4.2.0 (finding `ANT-2026-KIIS96IX`). ## Severity **CVSS:3.1/AV:L/AC:H/PR:L/UI:N/S:U/C:N/I:H/A:N, 4.7 (Medium).** `AV:L` (local): the other user needs an account on the same host. `AC:H` (high attack complexity): a race, though one the other user starts, lengthens (by making the lock user's `/proc` read slow) and retries at every release. The scanner measured 10 to 26 overlaps per 20-second run. `PR:L` (low privileges): an unprivileged account is enough. `UI:N` (no user interaction): the lock user's processes act on their own. `C:N` (no confidentiality impact): the other user reads nothing. `I:H` (high integrity impact): two holders write the data the lock protects, and neither learns of the other. `A:N` (no availability impact): the lock keeps working. Classification from the review: security, conditional on a sticky shared directory, ext4-style inode reuse and at least two contenders of the lock user. Our review verified it across UIDs (a UID is a user account's numeric id): the other user as uid 1001, the lock user's processes as uid 1000, BUG on 4.2.0 over ext4. The scanner rated it high (CWE-367). ## Scope and preconditions - The other user can create files in the lock's directory; a root-owned `1777` directory such as `/tmp` or `/var/tmp` is enough. It creates, `utime`s (sets the timestamps of) and unlinks only its own file. The sticky bit stops it removing the lock user's marker (checked: `EPERM`, operation not permitted), so the lock user's own stale break does the deletion. - The directory is on a filesystem that hands a freed inode number straight to the next file. ext4 does (six create/unlink rounds returned one number six times, in the image's overlayfs `/tmp` and on a loop-mounted ext4), and xfs does. tmpfs returned six increasing numbers and the same run there gave no overlap, and btrfs does not hand a freed number back. - The lock user has at least two processes contending for the lock, and the displaced holder is still inside when the next contender polls (the breaker itself comes back one `poll_interval`, 50 ms by default, later). - The lock is `SoftFileLock`, `MarkerSoftFileLock` or `SoftFileLease` (or async forms). The default `flock`-based `FileLock` joins them only after it has fallen back to `SoftFileLock` on `ENOSYS`. `StrictSoftFileLock` does not call `break_lock_file`, so it is not affected. - The same overlap also occurs with no other user involved, under heavy same-account contention, when a contender breaks a dead holder's marker and a successor creates its marker within the same timestamp tick (about once in 750 crashes with 64 workers on a 2-CPU machine, not on tmpfs). filelock's checks against another local user hold only when no other user can replace the lock's directory or any of its ancestors. That is the case when each ancestor belongs to the lock user or root and is either not writable by others or sticky. A user who can rename entries in a non-sticky directory above the lock controls every name below it. No file-based lock can defend against that. ## Affected code At the scanned commit b831496, the re-check sits in [`break_lock_file`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_util.py#L113-L118). Its callers are [`SoftFileLock._try_break_stale_lock`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_soft.py#L107-L123), [`MarkerSoftFileLock._try_break_stale_lock`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_marker.py#L74-L81) and [`SoftFileLease._try_break_stale_l

`SoftReadWriteLock` (and `AsyncSoftReadWriteLock`, which wraps one) refreshes its holder record (the file under `<path>.rw/holders/` that says a process holds or wants the lock) on every poll of a waiting acquire and on every heartbeat (the periodic refresh a holder runs to keep its record fresh). It does so by reopening `<path>.rw/holders/<token>` by name with a plain blocking `O_WRONLY | O_NOFOLLOW` open and writing at offset 0, without checking what it opened. `O_NOFOLLOW` makes the open fail only when the final name is a symbolic link (a file that redirects to another path). A different local user (the other user below) who owns the lock's `.rw` tree reads the token of the user running the lock (the lock user below) from the `holders/` listing and renames another node over the record. The other user owns the tree because it created it first in a sticky directory such as `/tmp` (the sticky bit is a directory flag that lets only a file's owner rename or remove it), or because it can write a lock directory without the sticky bit. A FIFO (a named pipe: a file whose open for writing blocks until some process opens it for reading) makes the lock user's `write_lock()` / `read_lock()` hang regardless of `timeout`. It also stops a lock holder's heartbeat thread without `on_compromise` (the callback that tells a holder it lost the lock) ever running, so the lock grants a second process while the first still believes it holds it. This works on a default Linux. Where the kernel lets a user hard-link a file it does not own (a hard link is a second name for the same file; Linux with `fs.protected_hardlinks=0`; macOS and the BSDs by their defaults, not executed), a hard link makes the lock user overwrite the first ~135 bytes of one of its own private files with its holder record. Affected versions: filelock >= 4.0.0 and <= 4.2.0. Anthropic's OSS Scanner reported it in private as `ANT-2026-AT33VEVC` [medium, CWE-62], titled "SoftReadWriteLock holder refresh writes through hard links, hangs on FIFOs". ## Severity **CVSS:3.1/AV:L/AC:L/PR:L/UI:N/S:U/C:N/I:L/A:H, 6.1 (Medium).** `AV:L` (local): the other user needs an account on the same host. `AC:L` (low attack complexity): on a default Linux there is no race. `PR:L` (low privileges): a local user with ordinary privileges is enough. `UI:N` (no user interaction): the lock user's process acts on its own. `C:N` (no confidentiality impact): the other user learns nothing. `I:L` (low integrity impact): where the kernel permits hard links to files one does not own, the lock user also writes its holder record over the first ~135 bytes of one of its private files. The bytes are filelock's record, not chosen by the other user, so the change stays within that record. `A:H` (high availability impact): the other user makes a lock user's acquire outlast any `timeout` and leaves a holder's heartbeat thread asleep. The lock then evicts the holder without telling it, and two processes believe they hold the write lock. Classification from the external review: conditional security. The owner of a planted `.rw` tree can make the refresh open a FIFO and stall a lock user, including its heartbeat. Overwriting a file of the lock user through a hard link also needs a permissive hard-link policy. The scanner rated it medium. ## Scope and preconditions - Trust boundary: the other party is a different local account that owns the lock's `.rw` tree. Either it created `<path>.rw` (with `gen/` and `holders/`) before the lock's first use in a sticky directory such as `/tmp`, where `prepare()` adopts an existing tree whoever owns it and whatever its mode. Or the lock lives in a directory without the sticky bit that the account can write (the scanner checked a root-created `0777` directory). There being first is not needed, because the other user renames the lock user's own `0700` tree aside and puts its own in place; `prepare()` does not run again for a live lock object, and a waiting lock user recreates its record in the replacement. A tree the lock user already created in a sticky directory (mode `0700`) is out of reach. - FIFO variant: needs only that boundary. It works on a default Linux. `fs.protected_hardlinks` plays no part, and `fs.protected_fifos=1` (a Linux setting that refuses some opens of FIFOs in sticky world-writable directories) does not help, since it covers `O_CREAT` opens in sticky directories only, and the other user renames the FIFO into place inside its own `holders/`. - Hard-link variant: also needs a kernel that permits a hard link to a file the caller does not own. That is Linux with `fs.protected_hardlinks=0` (the kernel's built-in value; observed), while most distributions and the scanner's test image boot with `1`, under which the other user's `link()` fails with `EPERM` (operation not permitted) and the file stays untouched. macOS and the BSDs have no such restriction by default; that follows from their `link(2)` semantics, and the scanner did not execute it. The tar

`ReadWriteLock` and `AsyncReadWriteLock` (the SQLite-backed reader/writer lock) run `PRAGMA journal_mode=MEMORY` on a fresh connection for every acquire. That statement makes SQLite load the whole schema (the `sqlite_master` table, which lists every table and index with its `CREATE` text) of whatever file sits at the lock path. The caller's `timeout` reaches SQLite only as `busy_timeout`, which bounds waits for another connection's lock, not schema loading. The only content checks reject non-regular files and WAL mode (write-ahead log, an SQLite mode that keeps changes in a side file). A local user who can place or overwrite the file at a `ReadWriteLock`'s database path can therefore make every `acquire_read` / `acquire_write` of every process using that lock ignore its `timeout` and `blocking=False`. That position needs a non-sticky shared directory, or a database owned by the user running the lock (below: the lock user) that other users may write. One 37 KB crafted file stalls each acquire for as long as its author chooses while the process allocates about 1 GB. A second 28 KB layout makes the acquire of a free lock run without end, spinning at 100% CPU and ignoring Ctrl-C. The effect is availability only: the other user reads nothing and corrupts nothing. Affected versions are filelock 3.20.4 through 4.2.0. Anthropic's OSS Scanner reported this in private as `ANT-2026-NFPRHMYJ` [medium, CWE-400]: ReadWriteLock: crafted lock database hangs acquire regardless of timeout. ## Severity **CVSS 3.1 `CVSS:3.1/AV:L/AC:L/PR:L/UI:N/S:U/C:N/I:N/A:H` scores 5.5 (Medium).** `AV:L` (local): the other user needs an account on the same host. `PR:L` (low privileges): an ordinary account is enough. `AC:L` (low attack complexity): the other user plants one file; no race. `UI:N` (no user interaction). `A:H` (high availability impact): every acquire of every process using the lock runs for as long as that user chose, or does not return, with `timeout` and `blocking=False` ignored and `SIGINT` not delivered, so only killing the process ends it. `C:N` and `I:N` (no confidentiality or integrity impact): the other user reads nothing and corrupts nothing. `S:U` (scope unchanged). Classification from the external review: **conditional security**, an availability concern only when an untrusted actor can supply the database file (it needs a writable or replaceable database path). The scanner rated it medium. The review agrees with the mechanism and the precondition. ## Scope and preconditions - The other party is a different local account that can create or replace the file at the lock path. One way: the lock directory is writable by that account and not sticky (the sticky bit is a directory flag that lets only a file's owner remove or rename it), for example a group-writable project or cache directory. There the account can be the first to create the database, or rename the lock user's database aside and put the crafted one in its place. The other way: the lock user's own database is writable by that account (`0666`), which is the setup a lock shared between accounts needs. In a `1777` directory the scanner wrote the crafted file over such a database in place, and the lock user's next acquire hung. The lock user must be able to open the file read-write, so a file the other user creates is `0666`. - Sticky directories and kernel settings. In a sticky world-writable directory such as `/tmp`, Linux with `fs.protected_regular=2` (a kernel setting) refuses the lock user's `O_CREAT` open of a file owned by the other account with `EACCES`. A database owned by the other user does not work there. That does not cover a `0666` database owned by the lock user. The scanner did not test systems with `fs.protected_regular=0` (the kernel's own default). - Platform. Every platform runs the same statements. On Windows the documentation already requires a lock directory that untrusted users cannot write, so the shared-directory setup is outside what the project supports there. - Ancestor boundary. Protection against another local user is possible only while no other user can replace the lock's directory or any of its ancestors. That holds when each ancestor belongs to the user or root and is either not writable by others or sticky. ## Affected code At the scanned commit `b831496b0273`: [`_configure_and_begin` runs `PRAGMA busy_timeout=...; PRAGMA journal_mode=MEMORY;` on a fresh connection](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_read_write.py#L814-L816), and for a read lock [`SELECT name FROM sqlite_master LIMIT 1` at line 832](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_read_write.py#L832). The code in [`_do_acquire_inner` closes the previous connection and opens a new one on every acquire](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_read_write.py#L745-L754). The only content checks

When a soft-lock stale break finds that the marker (the lock file at `<path>`) it renamed aside was a live one recreated by a successor, the restore branch of `break_lock_file()` checks the break name with `lstat` (a check that reads a name without following a symbolic link) and then calls `os.link(break_path, lock_file)` by name. On CPython 3.12 and later on Linux (and on macOS) that call follows a symbolic link (a file that redirects to another path). A local user (the other user below) who can write a shared lock directory without the sticky bit (a directory flag that lets only a file's owner rename or remove it) replaces the break name with a symbolic link between those two calls. The `SoftFileLock`, `MarkerSoftFileLock`, `SoftFileLease` or `lifetime` break of the user running the lock (the lock user below) then creates a hard link (a second name for the same file), in that directory, to any of the lock user's own files on the same filesystem. That includes files inside directories the other user cannot enter and links that `fs.protected_hardlinks` (a Linux setting that forbids hard links to files one does not own) refuses the other user when it asks itself. The link exposes the file's size, times, mode and owner, keeps the inode (the kernel's identity for a file, independent of its name) alive, and gives the other user a name it can move. On 4.2.0 a later `FileLock` of the lock user on that name truncated the file. Affected versions: filelock >= 4.1.0 and <= 4.2.0 (finding `ANT-2026-SB29HIAL`). ## Severity **CVSS:3.1/AV:L/AC:H/PR:L/UI:N/S:U/C:L/I:H/A:N, 5.3 (Medium).** `AV:L` (local): the other user needs an account on the same host. `AC:H` (high attack complexity): two short races against a few lines of Python, timed by inotify (a Linux facility that reports file events), and the lock user must take the lock again and again (the scanner won 10 runs out of 10 after 9 to 910 lock cycles). `PR:L` (low privileges): an unprivileged account is enough. `UI:N` (no user interaction): the lock user's process acts on its own. `C:L` (low confidentiality impact): the file's metadata through the new name, not its content. `I:H` (high integrity impact): the other user chooses the file, and whatever the lock user later does to names in that directory lands on it. On 4.2.0 the lock user's own `FileLock` truncated the 17-byte private file to 0 bytes and, with a permissive `mode`, would have changed its mode too. `A:N` (no availability impact): the lock keeps working. Classification from the review: security, conditional on a shared parent without the sticky bit, which crosses the protected-directory boundary. The scanner rated it high (CWE-363). This is an earlier-public-context finding. #786 added the restore branch and guarded a symbolic link already present when `lstat` runs, not one swapped in after it. ## Scope and preconditions - The other user can write the lock directory, and it has no sticky bit: a `0777` or group-writable cache or project directory. In a root-owned `1777` directory the unprivileged lock user cannot rename the other user's marker and only waits. In a `1777` directory the lock user owns, `fs.protected_symlinks=1` (a Linux setting that refuses to follow another user's symbolic link in a world-writable sticky directory) makes the `link` fail with `EACCES` (permission denied). Testing showed no effect in sticky directories. - The interpreter's `os.link` follows symbolic links. CPython 3.14 on Linux issues `linkat(..., AT_SYMLINK_FOLLOW)`. CPython 3.11 issues `link(2)`, which links the symbolic link itself, and is not affected. The scanner did not test 3.12 and 3.13. On macOS `link(2)` follows (confirmed in our review on macOS 27.0.1: a plain `os.link` of a symbolic link gave the target `st_nlink` 2, that is two names). - The target file and the lock directory are on the same filesystem (hard links cannot cross filesystems), and the lock user takes the lock more than once. - Every soft-lock path reaches the branch: `SoftFileLock`, `MarkerSoftFileLock`, `SoftFileLease` and the `lifetime` break. The native `FileLock` does not, but it is the consumer that turns the planted link into a truncation. filelock's checks against another local user hold only when no other user can replace the lock's directory or any of its ancestors. That is the case when each ancestor belongs to the lock user or root and is either not writable by others or sticky. A user who can rename entries in a non-sticky directory above the lock controls every name below it, which no file-based lock can defend against. This finding is about what the lock itself adds inside such a directory, a hard link the other user cannot make on its own. ## Affected code At the scanned commit b831496, the restore branch of [`break_lock_file`](https://github.com/tox-dev/filelock/blob/b831496b0273ecd11bf02b8d080ca8b673a538c1/src/filelock/_util.py#L113-L122) runs for [`SoftFileLock._try_break_stale_lock`](https://github.com/tox-dev/filelock/bl