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Explorer.

Marmite through 0.4.2 contains a path traversal vulnerability in the development server started by --serve that allows unauthenticated attackers to read arbitrary files. The handle_request function in src/server.rs fails to reject .. segments after percent-decoding and joining the request path to the output folder, enabling attackers to request encoded traversal sequences to access files readable by the marmite process.

PX4 Autopilot through 1.17.0 contains an uncontrolled stack allocation vulnerability in the file2 test command that fails to validate the write chunk size parameter. Attackers with shell access can supply an excessively large value to the -c option to trigger stack overflow and crash the flight controller.

PX4 Autopilot through 1.17.0 contains a NULL pointer dereference vulnerability in the sd_stress command where the -b byte count parameter is parsed without validation before being passed to malloc() and memset(). Attackers with shell access, including through MAVLink, can supply invalid byte count values to crash the flight controller.

OpenClaw before 2026.9.4 contains an incorrect authorization vulnerability in the mcp.app.view method that allows read-scoped operators to execute MCP App tools requiring operator.write scope. Attackers with operator.read tokens can obtain a standalone ticket from mcp.app.view and redeem it at the MCP app view endpoint to invoke state-changing tools without proper authorization checks.

OpenClaw before 2026.9.5 contains an incorrect authorization vulnerability in the Gateway's local media root allowlist that breaks filesystem isolation between sandboxed sessions. Sandboxed sessions or untrusted content can cause the Gateway to read files from sibling session sandboxes or shared workspace directories through media pipeline functions that fail to restrict reads to the active session.

The NetX Duo MQTT client leaks the packet carrying a malformed PUBLISH message. Each malformed PUBLISH costs one packet, or one chain of packets, from the network driver's receive pool, and nothing returns it. A peer that can deliver a few dozen such messages exhausts the pool and stops all inbound network traffic on the device until it is rebooted.

NetX Duo's WebSocket client resets the unmasking cursor to the first `NX_PACKET` each time it advances through a chained packet, while the loop's upper bound belongs to the current packet. With the standard contiguous packet-pool layout, a masked server frame split across two packets therefore drives the XOR loop through the first packet's unused payload area and on through the second packet's `NX_PACKET` control block. The four-byte WebSocket masking key controls the bytes written, so the corruption is attacker-chosen rather than incidental.

When NetX Secure is built with `NX_SECURE_KEY_CLEAR`, every TLS record sent on an active session is wiped after it has been handed to TCP. By then the TCP layer owns the packet chain and may already have released it to the packet pool. The wipe therefore writes zeros into packets that are free or in use by another thread, and when a reused packet's pointers no longer describe the old data, the length of the wipe underflows and it runs past the end of the packet pool.

NetX Secure TLS accepts an empty application-data record without verifying its message authentication code. In `_nx_secure_verify_mac`, a decrypted application record whose length equals the negotiated MAC size is treated as valid and returns success after advancing the receive sequence number. The received MAC is never generated or compared. Empty TLS application-data records are legal, and are commonly emitted by TLS 1.0 implementations as a BEAST mitigation.

The `_nx_secure_x509_asn1_tlv_block_parse()` function parses ASN.1 TLV (tag-length-value) blocks out of DER-encoded data. It is the primitive underneath all X.509 certificate parsing in NetX Secure, and therefore runs on certificates supplied by a remote peer during the TLS handshake. The function reads the one-byte ASN.1 tag from the caller's buffer *before* checking that the buffer holds at least one byte. When a caller passes a remaining length of zero, the guard correctly returns `NX_SECURE_X509_ASN1_LENGTH_TOO_LONG`, but the read has already happened one byte past the end of the buffer. code: nx_secure/src/nx_secure_x509_asn1_tlv_block_parse.c ``` UINT _nx_secure_x509_asn1_tlv_block_parse(const UCHAR *buffer, ULONG *buffer_length, USHORT *tlv_type, USHORT *tlv_tag_class, ULONG *tlv_length, const UCHAR **tlv_data, ULONG *header_length) { UINT current_index; USHORT current_tag; ULONG length; ULONG length_bytes; current_index = 0; current_tag = buffer[current_index]; /* <-- read before the bounds check */ if (*buffer_length < 1) { return(NX_SECURE_X509_ASN1_LENGTH_TOO_LONG); } ``` The remainder of the function is correctly ordered. The multi-byte length path is guarded by `length_bytes > 4 || length_bytes > *buffer_length` before its read loop, the decoded value is checked against `length > *buffer_length`, and the second single-byte length read follows its own `*buffer_length < 1` guard. The tag read is the only load placed ahead of its check.

An unprivileged, memory-protected ThreadX module can have the kernel read and write memory at addresses of its choosing, in privileged mode, and can use that to clear the MPU enable bit and remove its own isolation boundary. The Module Manager decided whether a privileged service could dereference an object address a module named by asking only whether that address fell outside the module. The manager's object pool is outside every module, so the test was satisfied by an address shifted into the interior of one of the module's own privileged allocations, which denotes no object at all. The bytes such an address presents as a control block are bytes the module put there through ordinary create and set services, so the control block ID at the front of them could be made to read as any type the module chose, and the `_txe_` layer's ID test then agreed. The reported chain uses that to reach a privileged `memset` across an attacker-chosen range.

Mounting an attacker-controlled NAND flash image (`lx_nand_flash_open()`) triggers an unbounded out-of-bounds heap **write** in LevelX's NAND flash-translation-layer metadata parser that overwrites a driver function pointer in the control block, giving a demonstrated control-flow hijack — RIP set to a full 8-byte attacker-chosen value (register-verified). Two accompanying OOB reads. All reproduced verbatim under ASan at HEAD `9f1cfdc`. (The affected metadata-parser header states "Some portions generated by Copilot (Sonnet 4.6)" — an AI-generated parser with an unchecked on-flash count.)

`gx_binres_theme_load()` sizes its theme buffer for the theme it was asked for, and allocates it even when the resource holds no theme with that id. A theme id at or past the theme count declared by the resource gets a buffer of zero bytes. The load pass then walks past the end of the theme table, takes whatever follows as a theme header, and writes a `GX_THEME` and its tables into that zero-byte buffer.

Two client-side TLS/DTLS handshake parsers in NetX Secure read fields from a server-supplied message before validating that the message is long enough to contain them. Both are bounded out-of-bounds reads on a remotely reachable path, both are reached from a TLS or DTLS client connecting to a malicious or malformed server, and both have the same shape: the bounds check exists and returns the correct status, but it runs after the read it is meant to guard.

FTP Passive Data Connection Not Bound to the Authenticated Control Peer

Unbounded PPP IPCP Option Parsing Causes a Worker Stall and Out-of-bounds Read

Out-of-bounds Read from Unvalidated MSRP Attribute List Length

NULL Pointer Dereference When Evicting the Sole MSRP Attribute

NULL Pointer Dereference on MSRP Attribute Table Exhaustion

In the IPv4 PASV path, the FTP Client accepts whatever address was sent in the server's `227` reply. Validation only covers the parse and the non-zero values, thus a malicious server can name any address and direct the Client there.

A TFTP server that answers with a short ERROR packet makes the client read up to 64 bytes past the received datagram. Each receive path checks only that the datagram is at least four bytes long (nxd_tftp_client.c:1229, 1521, 1984). When the opcode is NX_TFTP_CODE_ERROR the message string is copied with a loop whose only limits are the destination buffer and a NUL byte: ```c /* addons/tftp/nxd_tftp_client.c:1769 */ for (i = 0; (i < (sizeof(tftp_client_ptr -> nx_tftp_client_error_string) - 1)) && (*buffer_ptr); i++) ``` Nothing compares `buffer_ptr` against `nx_packet_append_ptr`. An ERROR packet that carries no terminating NUL, which a server controls completely, walks the loop off the end of the packet until it happens to meet a zero byte or fills the 64 byte destination. ``` ERROR: AddressSanitizer: heap-buffer-overflow READ of size 1 at 0x60d0000000c8 thread T4 #0 _nxd_tftp_client_file_read addons/tftp/nxd_tftp_client.c:1769 0x60d0000000c8 is 0 bytes to the right of 136-byte region ``` The open path has the same loop at :1327 and reports the same way. What is read lands in `nx_tftp_client_error_string`, which the application is expected to display or log, so adjacent packet pool memory ends up in whatever the device does with the error text. Add `(buffer_ptr < packet_ptr -> nx_packet_append_ptr)` to the loop condition in all three paths.

A DHCP server, or anyone on the LAN who answers a DISCOVER first, can make the client read about a kilobyte past the end of the received message. The option walk keeps a pointer and an offset in step, and the only bound check uses the offset: ```c /* addons/dhcp/nxd_dhcp_client.c:7538, 7572 */ while (i < length - 1) { ... size = *(++data); /* data moves 1: type -> length byte */ data += size + 1; /* data moves size + 1 more */ i += size + 1; /* i moves only size + 1 */ } ``` A TLV option occupies size + 2 bytes. `data` is advanced by size + 2 in total, `i` by size + 1, so the offset falls one byte behind the real read position for every option the walk skips. After enough skipped options the check `i < length - 1` still holds while `data` is already past the end of the message, and the subsequent read of the type and length bytes comes from whatever follows. A single OFFER carrying a long run of skippable options is enough: ``` ERROR: AddressSanitizer: heap-buffer-overflow READ of size 1 at 0x61b000000794 thread T5 #0 _nx_dhcp_search_buffer addons/dhcp/nxd_dhcp_client.c:7541 #1 _nx_dhcp_get_option_value addons/dhcp/nxd_dhcp_client.c:7082 0x61b000000794 is located 164 bytes to the right of 1648-byte region ``` A well formed OFFER through the same path is handled normally, the client records the offer and moves to REQUESTING, so the difference is the option layout rather than the harness. The read runs in the DHCP client thread while the client is still unconfigured, so it happens on every boot in reach of a hostile DHCP responder. The values read are used to configure the interface, which is how the disclosed bytes become observable. Advance `i` by size + 2, or derive the bound from `data` rather than keeping a second counter.

Predictable DTLS HelloVerifyRequest Cookie in NetX Secure

hey, `_nx_snmp_utility_object_id_get` in the NetX Duo SNMP addon does not validate the claimed OID data length against the actual buffer size when the OID uses BER multibyte length encoding, so a remote attacker can send a crafted SNMP packet with a multibyte OID length larger than the available buffer, causing the parser to read past the packet buffer boundary into adjacent heap memory. the OOB bytes are decoded as OID component values and written into the agents internal OID string buffer, corrupting agent state. on systems with memory protection the OOB read poses the risk of crashing the SNMP agent thread, causing denial of service. on bare metal embedded systems without memory protection the read silently succeeds and corrupts the agents internal state with heap data.