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net_icmpv6_send_error() in subsys/net/ip/icmpv6.c implemented only one of the three RFC 4443 section 2.4 suppression rules (do not answer an ICMPv6 error with an ICMPv6 error). It did not check whether the triggering packet's source address identifies a single node (rule e.6) or whether the packet was sent to a multicast destination (rule e.3, whose only exceptions are Packet Too Big and Parameter Problem Code 2). Of the five call sites, only the port-unreachable path in subsys/net/ip/connection.c carried an equivalent guard of its own; the extension-header, unknown-next-header and fragmentation paths in subsys/net/ip/ipv6.c and subsys/net/ip/ipv6_fragment.c had none. An unauthenticated attacker with access to the same link can exploit this in two ways. Sending a single IPv6 packet to the link-local all-nodes group ff02::1 carrying an unrecognized next-header value, with the source address spoofed to a chosen victim, causes every Zephyr node on the link to emit an ICMPv6 Parameter Problem message to that victim — a reflector with an amplification factor equal to the number of nodes. Alternatively, sending a unicast packet whose source address is a multicast address causes the node to transmit its ICMPv6 error to that multicast address, turning one unicast packet into a link-flooded multicast frame. Packets addressed to ff02::1 are accepted unconditionally by ipv6_input(), and no check rejects a multicast source address, so no special configuration is required. The impact is degraded availability of the shared link and of the reflection victim, together with the ability for the attacker to hide its own address behind the responding nodes. The effect is amplified on constrained mesh links such as 802.15.4/Thread, where link-local multicast is flooded hop by hop. There is no memory-safety consequence: the error packet itself is well formed, it is simply emitted in cases where the protocol forbids it. The fix adds both suppression checks at the single choke point in net_icmpv6_send_error(), before any reply packet is allocated, preserving the RFC-mandated exceptions for NET_ICMPV6_PACKET_TOO_BIG and Parameter Problem Code 2. Note that the IPv4 counterpart net_icmpv4_send_error() in subsys/net/ip/icmpv4.c still checks only for a broadcast destination and retains an equivalent gap for multicast destinations and non-unique sources.

gptp_mi_qualify_announce() in subsys/net/l2/ethernet/gptp/gptp_mi.c walks the Path Trace TLV of a received IEEE 802.1AS Announce message, comparing each clock identity against the local one. The loop bound was taken solely from the attacker-controlled wire field announce->steps_removed (accepted up to 254), never from announce->tlv.len, which is the field that states how many identities the TLV actually carries. Because path_sequence is the flexible member of the wire TLV (struct gptp_path_trace_tlv) and GPTP_ANNOUNCE() yields a raw pointer into the received packet buffer, the memcmp() inside the loop can address memory well past the end of the received frame. The stack's only length validation, GPTP_ANNOUNCE_CHECK_LEN(), requires the received gPTP payload to be exactly 68 + tlv.len bytes — so it does not constrain the loop, it guarantees the data is absent. An unauthenticated attacker on the same Ethernet segment can send a single Announce frame declaring tlv.len = 0 with steps_removed = 254; the frame passes the length check and reception path (net_gptp_recv() → gptp_handle_msg() → gptp_mi_qualify_announce()), which performs no authentication, and the loop then reads 255 entries of 8 bytes each — about 2 KB — beyond the end of the network buffer. The impact is an out-of-bounds read. The bytes read are only used as a memcmp() operand and are never returned to the attacker, so there is no meaningful information disclosure; the practical risk is that the overread crosses a network buffer pool boundary into unmapped or MPU-protected memory and faults the networking RX thread, causing a denial of service. Exposure is limited to builds that enable the opt-in, experimental CONFIG_NET_GPTP (TSN/AVB deployments) and to attackers with layer-2 adjacency, since gPTP frames are sent to a link-local multicast address and are not routed. The fix computes the true entry count as tlv.len / GPTP_CLOCK_ID_LEN and rejects the announce when steps_removed + 1 exceeds it, so the loop can no longer run past the data the packet-length check proved present.

gptp_handle_msg() in subsys/net/l2/ethernet/gptp/gptp.c dereferenced the gPTP header returned by GPTP_HDR() and switched on hdr->message_type without first checking that the received frame carries at least sizeof(struct gptp_hdr) (34) bytes of payload. The header accessor gptp_get_hdr() deliberately never fails for a short buffer — it returns pkt->frags->data and leaves validation to its callers — so a truncated frame produced a header pointer covering memory beyond the received data. The per-message-type checks that follow do not compensate: GPTP_VALID_LEN() reduces to len > 60 once the Ethernet header has been pulled, which is false for every fixed-size gPTP message, so GPTP_CHECK_LEN() never rejects a truncated SYNC, FOLLOWUP, PDELAY_RESP or SIGNALING message. The defect is reached by an unauthenticated peer on the same link sending an Ethernet frame with ethertype 0x88F7 to the PTP multicast address on an interface configured as a gPTP port, with CONFIG_NET_GPTP enabled. Because conformant Ethernet pads frames to 60 bytes, a payload shorter than 34 bytes generally requires a link that can deliver sub-minimum frames — for example the native_sim TAP driver (drivers/ethernet/eth_native_tap.c), which forwards whatever length the host device supplies, or a MAC configured to accept undersized frames. The short packet is retained (net_pkt_ref() into rcvd_sync_ptr, rcvd_follow_up_ptr, rcvd_pdelay_resp_ptr or rcvd_announce_ptr) and later parsed by the media-dependent and media-independent state machines in subsys/net/l2/ethernet/gptp/gptp_md.c and subsys/net/l2/ethernet/gptp/gptp_mi.c, which read tens of further bytes and copy some of them (the announce priority vector, hdr->port_id) into state that is subsequently transmitted. Under the default fixed-size buffer allocator (CONFIG_NET_BUF_FIXED_DATA_SIZE, 128-byte fragments) the accesses stay inside the allocated fragment and disclose stale recycled buffer contents; under the experimental CONFIG_NET_BUF_VARIABLE_DATA_SIZE allocator, where fragments are heap-allocated at the exact frame length, they are genuine out-of-bounds reads. There is no write and no availability impact.

A flaw was found in the DERDecoder class within wildfly-elytron-asn1. A remote attacker can exploit this resource exhaustion vulnerability by sending a specially crafted DER (Distinguished Encoding Rules) payload. The decoder attempts to allocate excessive memory based on an inflated length value without proper validation, leading to Java Virtual Machine (JVM) memory exhaustion. This results in a remote Denial of Service (DoS) for services that process untrusted DER/ASN.1 input, including SASL (Simple Authentication and Security Layer) authentication mechanisms and X.500 certificate principal parsing paths.

IBM Controller 11.0.0 through 11.0.1 FP7, and 11.1.0 through 11.1.3 FP1 could allow a remote attacker to obtain sensitive information when a detailed technical error message is returned in the browser. This information could be used in further attacks against the system.

IBM Sterling Partner Engagement Manager Essentials Edition 6.3.0.0 through 6.3.0.2, and 6.2.4.0 through 6.2.4.4 and IBM Sterling Partner Engagement Manager Standard Edition 6.2.4.0 through 6.2.4.4 could allow an unauthenticated user to cause a denial of service in the email service due to improper control of interaction frequency.

IBM Cognos Analytics 12.0.4 through 12.0.4 FP2, and 12.1.0 through 12.1.3 FP1 could allow a remote attacker to obtain sensitive information, caused by the failure to properly enable HTTP Strict Transport Security. An attacker could exploit this vulnerability to obtain sensitive information using man in the middle techniques.

vm2 (npm) versions 3.12.0 and earlier contain a sandbox escape in `VM` and `NodeVM`. When an embedder exposes a host API that returns a host-realm Promise, the bridge's rejection sanitizer (hostPromiseSanitizeReject / makeSanitizedPromiseCallback / normalizeHostPromiseCallbacks in lib/bridge.js) only wraps `then`/`catch` rejection slots that hold a function, and the sandbox-side `Symbol.species`/`.then` neutralization is installed only on the sandbox intrinsic `Promise.prototype`, so it never applies to a host Promise. Code running inside the sandbox can overwrite `p.constructor[Symbol.species]` on the host Promise and then call `p.then()` with no `onRejected` handler; V8 substitutes its internal Thrower, which re-throws the raw host rejection value into a resolve/reject closure captured by the attacker. This delivers an unsanitized, fully functional bridge proxy of the host object to sandboxed code, bypassing handleException and hostPromiseSanitizeReject. If the rejection value is host-pivotable (for example a host `process` object), this results in arbitrary code execution on the host. Fixed in 3.12.1.

vm2 NodeVM versions before 3.12.1 contain a sandbox escape vulnerability where the DANGEROUS_BUILTINS denylist omits child_process despite blocking other host-spawning modules. Attackers can require child_process and execute arbitrary commands on the host system when NodeVM is configured with builtin:['*'] or explicit child_process allowance.

vm2 through 3.12.0 exposes Node.js's crypto.setFips() function to untrusted guest code when an embedder explicitly allowlists the crypto builtin for a NodeVM (require.builtin: ['crypto']). The builtin sanitizer (sanitizeCryptoModule in lib/builtin.js) replaces crypto.setEngine but leaves crypto.setFips callable, and the readonly wrapper used to expose the host module does not localize side effects of forwarded host functions. Guest code can therefore call crypto.setFips() to change the FIPS mode of the entire host process; the modified mode is subsequently observed by trusted host code (crypto.getFips() changed from 0 to 1 in the reported test), crossing the NodeVM isolation boundary. Fixed in vm2 3.12.1.

vm2 through 3.12.0 (fixed in 3.12.1) does not correctly handle a nullish `this` receiver in the apply trap of its bridge (lib/bridge.js): when sandboxed code calls a host-provided non-strict (sloppy-mode) function without a receiver — e.g. `fn()`, a detached method, `fn.call()`, `fn.apply(undefined)`, `Reflect.apply(fn, undefined, [])`, or `fn.bind()()` — the undefined receiver is passed straight through to the host call, and V8 substitutes the host realm's global object for `this`. vm2 then wraps and returns that object to the sandbox, giving sandboxed script a live proxy of the host global. This allows a complete sandbox escape: untrusted script can reach `process` and execute arbitrary code/commands on the host (for example via `process.getBuiltinModule('child_process').execSync`). Exploitation requires that the embedding application expose at least one non-strict host function to the sandbox; strict-mode and ES module host functions are not affected.

rustls-webpki versions before 0.103.10 and 0.104.0-alpha.5 contain faulty CRL authority-matching logic that compares only the first distributionPoint against each CRL's IssuingDistributionPoint, ignoring additional distributionPoints. Attackers with a compromised trusted issuing authority can present revoked certificates that pass revocation checks under UnknownStatusPolicy::Allow, or cause incorrect errors under the default deny policy.

rustls-webpki (the Rust webpki fork used by rustls) versions >= 0.101.0 and prior to 0.103.12 and 0.104.0-alpha.6 incorrectly accepted permitted-subtree DNS name constraints for certificates asserting a wildcard name. For example, a name constraint of accept.example.com was treated as satisfied by a certificate for *.example.com, which could feasibly assert reject.example.com — a name outside the permitted subtree. Because name constraints are restrictions applied to otherwise properly issued certificates, the issue is only reachable after signature verification succeeds and requires a misissued wildcard certificate to exploit.

rustls-webpki (rustls/webpki) versions 0.101.0 through 0.103.11 and 0.104.0-alpha releases before 0.104.0-alpha.6 ignore X.509 name constraints that apply to URI names, causing such constraints to be accepted rather than enforced. Because name constraints are restrictions on otherwise properly issued certificates, the flaw is only reachable after successful signature verification and requires a misissued certificate to exploit; the library also provides no API for asserting URI names, and URI name constraints are otherwise unimplemented. Versions 0.103.12 and 0.104.0-alpha.6 reject URI name constraints unconditionally.

rustls-webpki through 0.103.12 (and 0.104.0-alpha releases before 0.104.0-alpha.7) contains a reachable panic in bit_string_flags() in src/der.rs. The input guard fails to reject a named-bit BIT STRING whose content is exactly [0x00] (zero padding bits and no data bytes), so raw_bits.len() - 1 underflows on the empty slice and the subsequent index operation panics (subtract-with-overflow in debug, index-out-of-bounds in release). The condition is reachable through the public API BorrowedCertRevocationList::from_der() when a CRL contains an issuingDistributionPoint extension with such an onlySomeReasons value. Exploitation requires an application that explicitly opts in to CRL revocation checking by passing RevocationOptions to verify_for_usage() and that parses CRL bytes obtained from a source the attacker can influence; the default rustls configuration, which does not use RevocationOptions, is unaffected. A crafted CRL causes a denial of service via the panic. Fixed in 0.103.13 and 0.104.0-alpha.7.

ArcadeDB (Maven artifact com.arcadedb:arcadedb-engine) through 26.8.1 contains an incomplete deny-list in the polyglot script sandbox: com.arcadedb.query.polyglot.HostClassLookupFilter.DENIED lists java.util.ResourceBundle as a bare class name, which is matched by exact equality and therefore does not cover its subclasses, while ScriptTriggerExecutor.ALLOWED_PACKAGES permits java.util.*. A user with the UPDATE_SCHEMA privilege (sufficient to create or alter a JavaScript trigger; no server-admin rights required) can reference java.util.PropertyResourceBundle or java.util.ListResourceBundle and invoke the inherited static ResourceBundle.getBundle(String) to read .properties resources from the application classpath, which the sandbox (IOAccess.NONE, with java.io.**, java.nio.** and java.net.** denied) is intended to make unreachable. This can disclose packaged application configuration such as database credentials and API keys; the advisory states the issue does not provide arbitrary host filesystem read or remote code execution. Fixed in 26.9.1.

ArcadeDB versions before 26.9.1 fail to validate IPv6 transition addresses in the SSRF guard used by IMPORT DATABASE and server commands. Authenticated attackers can supply URLs resolving to NAT64, 6to4, or Teredo addresses embedding RFC 1918 or loopback IPv4 payloads to reach internal services and cloud metadata endpoints.

ArcadeDB before 26.9.1 (com.arcadedb:arcadedb-engine <= 26.8.1) fails to bind the authenticated principal onto the DatabaseAsyncTransaction async worker threads used by the parallel edge-connect phase of POST /api/v1/batch/{database}. Because those workers have no current user, LocalDatabase.checkPermissionsOnFile returns early and allows the write, bypassing per-type CREATE_RECORD/UPDATE_RECORD ACL enforcement. In deployments that rely on per-type or per-group ACLs, an authenticated low-privilege user holding CREATE_RECORD on an edge type E but with CREATE_RECORD/UPDATE_RECORD revoked on a vertex type V can submit a graph edge-load batch request (with parallelFlush at its default value of true) and durably append edges to protected vertices of type V by writing records into V's <V>_out_edges/<V>_in_edges buckets, resulting in unauthorized modification of graph adjacency. Setting parallelFlush=false causes the request to be correctly rejected. This is an incomplete fix of GHSA-c23x-pqcj-7hfm, which bound the principal only on the HTTP handler thread.

ArcadeDB before 26.9.1 contains an access control bypass vulnerability in the query_database tool exposed through the AI chat endpoints. The tool executes queries without binding the authenticated principal to DatabaseContext, causing per-type and per-bucket ACL checks to silently no-op and allowing authenticated users to read data they are explicitly denied at the per-type level. Attackers can prompt the AI assistant to execute queries against restricted types or buckets to retrieve sensitive data that would be rejected through normal query endpoints.

ArcadeDB (Maven artifact com.arcadedb:arcadedb-engine) through 26.8.1 enforces its per-type/per-record access-control rules only in LocalBucket, keyed on file id. Query-execution paths that reach record data through LSM index files or the TimeSeries engine never invoke that permission check, so an authenticated user who is denied readRecord/deleteRecord on a type can still, with a single ordinary SQL statement, read the type's indexed key values and record IDs (e.g. SELECT key, rid FROM INDEX:Type[field]), read MAX/MIN values via the index shortcut, read and count TimeSeries samples, learn the type's record count, and delete index entries (DELETE FROM INDEX:Type[field]), which desynchronizes the index from the data and can defeat unique constraints. Index and type names needed for exploitation are discoverable because SELECT FROM schema:indexes is unfiltered. The issue affects both embedded and server deployments and all transports (HTTP, Bolt, Postgres, Gremlin) once a principal is bound. Fixed in 26.9.1.

ArcadeDB before 26.9.1 fails to enforce security-group types ACL entries for TimeSeries types because the ACL resolver builds permissions from bucket IDs, but TimeSeries types do not own normal record buckets. An authenticated low-privilege user can read or insert TimeSeries samples despite explicit deny rules by exploiting the missing type-name-based access check that causes permission lookups to fail open.

vLLM versions before 0.28.0 fail to validate the lower bound of token IDs in the /v1/embeddings and /pooling endpoints, allowing unauthenticated attackers to crash the engine by submitting negative token IDs. A single request with a negative token ID triggers a CUDA device-side assertion that poisons the GPU context, causing all subsequent requests to fail until the process restarts.

SiYuan versions before 3.8.3 contain an SQL injection vulnerability in the graph.go query2Stmt function where tag values are concatenated raw into SQL string literals without escaping single quotes. A publish-mode reader or anonymous visitor can inject SQL via inline HTML span tags in the getGraph endpoint to execute arbitrary queries on the read-write database and exfiltrate private data across notebooks.

ImageMagick before 7.1.2-31 contains a policy bypass vulnerability in the UHDR encoder that fails to perform policy checks during buffer allocation for image pixels. Attackers can bypass resource policies by processing specially crafted UHDR images, potentially causing denial of service through excessive memory allocation.