Hash Function Security : Cryptanalysis of the Very Smooth Hash
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Modern Cryptography: Lecture 13 Digital Signatures
Modern Cryptography: Lecture 13 Digital Signatures Daniel Slamanig Organizational ● Where to find the slides and homework? – https://danielslamanig.info/ModernCrypto18.html ● ow to conta!t me? – [email protected] ● #utor: Karen Klein – [email protected] ● Offi!ial page at #', )o!ation et!. – https://tiss.tuwien.ac.at/!ourse/!o$rseDetails.+html?dswid=86-2&dsrid,6/0. !ourseNr,102262&semester,2018W ● #utorial, #U site – https://tiss.tuwien.ac.at/!ourse/!o$rseAnnouncement.+html?dswid=4200.dsr id,-51.!ourseNum6er,10206-.!ourseSemester,2018W ● 8+am for the se!ond part: Thursday 31.21.2210 15:00-1/:00 (Tutorial slot; 2/26 Overview Digital Signatures message m / :m( σ; secret key skA Inse!$re !hannel p$bli! key pkA p$bli! key pkA σ σ :, 7igskA:m; 6 :, =rfypkA:m( ; 3: pkA -/26 Digital Signatures: Intuitive Properties Can 6e seen as the p$6li!9key analog$e of M3Cs with p$6li! >erifiability ● Integrity protection: 3ny modifi!ation of a signed message !an 6e detected ● 7o$r!e a$thenti!ity: The sender of a signed message !an be identified ● Non9rep$diation: The signer !annot deny ha>ing signed :sent) a message 7e!$rity :intuition;: sho$ld 6e hard to !ome $p with a signat$re for a message that has not 6een signed by the holder of the pri>ate key 5/26 Digital Signatures: pplications *igital signat$res ha>e many applications and are at the heart of implementing p$6lic9key !ryptography in practice ● <ss$ing !ertifi!ates 6y CAs (?$6lic %ey <nfrastr$!t$res;: 6inding of identities to p$6lic keys ● @$ilding authenticated !hannels: a$thenti!ate parties :ser>ers; in sec$rity proto!ols :e.g.( TL7; or se!$re messaging :Whats3pp( 7ignal, ...; ● Code signing: a$thenti!ate software/firmware :$pdates; ● 7ign do!$ments :e.g.( !ontra!ts;: )egal reg$lations define when digital signat$res are eq$ivalent to handwritten signat$res ● 7ign transa!tions: $sed in the !rypto!$rren!y realm ● et!. -
Second Preimage Attacks on Dithered Hash Functions
Second Preimage Attacks on Dithered Hash Functions Elena Andreeva1, Charles Bouillaguet2, Pierre-Alain Fouque2, Jonathan J. Hoch3, John Kelsey4, Adi Shamir2,3, and Sebastien Zimmer2 1 SCD-COSIC, Dept. of Electrical Engineering, Katholieke Universiteit Leuven, [email protected] 2 École normale supérieure (Département d’Informatique), CNRS, INRIA, {Charles.Bouillaguet,Pierre-Alain.Fouque,Sebastien.Zimmer}@ens.fr 3 Weizmann Institute of Science, {Adi.Shamir,Yaakov.Hoch}@weizmann.ac.il 4 National Institute of Standards and Technology, [email protected] Abstract. We develop a new generic long-message second preimage at- tack, based on combining the techniques in the second preimage attacks of Dean [8] and Kelsey and Schneier [16] with the herding attack of Kelsey and Kohno [15]. We show that these generic attacks apply to hash func- tions using the Merkle-Damgård construction with only slightly more work than the previously known attack, but allow enormously more con- trol of the contents of the second preimage found. Additionally, we show that our new attack applies to several hash function constructions which are not vulnerable to the previously known attack, including the dithered hash proposal of Rivest [25], Shoup’s UOWHF[26] and the ROX hash construction [2]. We analyze the properties of the dithering sequence used in [25], and develop a time-memory tradeoff which allows us to apply our second preimage attack to a wide range of dithering sequences, including sequences which are much stronger than those in Rivest’s proposals. Fi- nally, we show that both the existing second preimage attacks [8, 16] and our new attack can be applied even more efficiently to multiple target messages; in general, given a set of many target messages with a total of 2R message blocks, these second preimage attacks can find a second preimage for one of those target messages with no more work than would be necessary to find a second preimage for a single target message of 2R message blocks. -
(1) Hash Functions (2) MAC MDC OWHF CRHF UOWHF
Hash functions (1) are secure; they can be reduced to @ @ 2 classes based on linear transfor- @ @ mations of variables. The properties @ of these 12 schemes with respect to @ @ Hash Functions: Past, Present and Future weaknesses of the underlying block @ @ cipher are studied. The same ap- proach can be extended to study keyed hash functions (MACs) based - -63102392168 on block ciphers and hash functions h Bart Preneel based on modular arithmetic. Fi- nally a new attack is presented on a scheme suggested by R. Merkle. Katholieke Universiteit Leuven This slide is now shown at the Asi- acrypt 2005 in the beautiful city of bartDOTpreneel(AT)esatDOTkuleuvenDOTbe Chennai during a presentation on the state of hash functions. http://homes.esat.kuleuven.be/ preneel ∼ 5 December 2005 3 Outline Hash functions (2) Definitions • cryptographic hash function Z Z Applications Z Z • Z Z General Attacks = ZZ~ • MAC MDC Constructions @ @ • @ @ Custom Designed Hash Functions @ • © @R Hash Functions Based on Block Ciphers OWHF ? CRHF • Hash Functions Based on Algebraic Operations UOWHF • Pseudo-randomness • This talk: only MDCs (Manipulation Detection Codes), which are Conclusions often called `hash functions' • 2 4 Informal definitions (1) Informal definitions (3) preimage resistant 2nd preimage resistant 6) take a preimage resistant hash function; add an input bit b and • replace one input bit by the sum modulo 2 of this input bit and b 2nd preimage resistant preimage resistant 6) if h is OWHF, h is 2nd preimage resistant but not preimage • resistant -
A Full Key Recovery Attack on HMAC-AURORA-512
A Full Key Recovery Attack on HMAC-AURORA-512 Yu Sasaki NTT Information Sharing Platform Laboratories, NTT Corporation 3-9-11 Midori-cho, Musashino-shi, Tokyo, 180-8585 Japan [email protected] Abstract. In this note, we present a full key recovery attack on HMAC- AURORA-512 when 512-bit secret keys are used and the MAC length is 512-bit long. Our attack requires 2257 queries and the off-line com- plexity is 2259 AURORA-512 operations, which is significantly less than the complexity of the exhaustive search for a 512-bit key. The attack can be carried out with a negligible amount of memory. Our attack can also recover the inner-key of HMAC-AURORA-384 with almost the same complexity as in HMAC-AURORA-512. This attack does not recover the outer-key of HMAC-AURORA-384, but universal forgery is possible by combining the inner-key recovery and 2nd-preimage attacks. Our attack exploits some weaknesses in the mode of operation. keywords: AURORA, DMMD, HMAC, Key recovery attack 1 Description 1.1 Mode of operation for AURORA-512 We briefly describe the specification of AURORA-512. Please refer to Ref. [2] for details. An input message is padded to be a multiple of 512 bits by the standard MD message padding, then, the padded message is divided into 512-bit message blocks (M0;M1;:::;MN¡1). 256 512 256 In AURORA-512, compression functions Fk : f0; 1g £f0; 1g ! f0; 1g 256 512 256 512 and Gk : f0; 1g £ f0; 1g ! f0; 1g , two functions MF : f0; 1g ! f0; 1g512 and MFF : f0; 1g512 ! f0; 1g512, and two initial 256-bit chaining U D 1 values H0 and H0 are defined . -
A Provably-Unforgeable Threshold Eddsa with an Offline Recovery Party
A Provably-Unforgeable Threshold EdDSA with an Offline Recovery Party Michele Battagliola,∗ Riccardo Longo,y Alessio Meneghetti,z and Massimiliano Salax Department of Mathematics, University Of Trento Abstract A(t; n)-threshold signature scheme enables distributed signing among n players such that any subset of size at least t can sign, whereas any subset with fewer players cannot. The goal is to produce threshold digital signatures that are compatible with an existing centralized sig- nature scheme. Starting from the threshold scheme for the ECDSA signature due to Battagliola et al., we present the first protocol that supports EdDSA multi-party signatures with an offline participant dur- ing the key-generation phase, without relying on a trusted third party. Under standard assumptions we prove our scheme secure against adap- tive malicious adversaries. Furthermore we show how our security notion can be strengthen when considering a rushing adversary. We discuss the resiliency of the recovery in the presence of a malicious party. Using a classical game-based argument, we prove that if there is an adversary capable of forging the scheme with non-negligible prob- ability, then we can build a forger for the centralized EdDSA scheme with non-negligible probability. Keywords| 94A60 Cryptography, 12E20 Finite fields, 14H52 Elliptic curves, 94A62 Authentication and secret sharing, 68W40 Analysis of algorithms 1 Introduction A(t; n)-threshold signature scheme is a multi-party computation protocol that en- arXiv:2009.01631v1 [cs.CR] 2 Sep 2020 ables a subset of at least t among n authorized players to jointly perform digital signatures. The flexibility and security advantages of threshold protocols have be- come of central importance in the research for new cryptographic primitives [9]. -
On Notions of Security for Deterministic Encryption, and Efficient Constructions Without Random Oracles
A preliminary version of this paper appears in Advances in Cryptology - CRYPTO 2008, 28th Annual International Cryptology Conference, D. Wagner ed., LNCS, Springer, 2008. This is the full version. On Notions of Security for Deterministic Encryption, and Efficient Constructions without Random Oracles Alexandra Boldyreva∗ Serge Fehr† Adam O’Neill∗ Abstract The study of deterministic public-key encryption was initiated by Bellare et al. (CRYPTO ’07), who provided the “strongest possible” notion of security for this primitive (called PRIV) and con- structions in the random oracle (RO) model. We focus on constructing efficient deterministic encryption schemes without random oracles. To do so, we propose a slightly weaker notion of security, saying that no partial information about encrypted messages should be leaked as long as each message is a-priori hard-to-guess given the others (while PRIV did not have the latter restriction). Nevertheless, we argue that this version seems adequate for certain practical applica- tions. We show equivalence of this definition to single-message and indistinguishability-based ones, which are easier to work with. Then we give general constructions of both chosen-plaintext (CPA) and chosen-ciphertext-attack (CCA) secure deterministic encryption schemes, as well as efficient instantiations of them under standard number-theoretic assumptions. Our constructions build on the recently-introduced framework of Peikert and Waters (STOC ’08) for constructing CCA-secure probabilistic encryption schemes, extending it to the deterministic-encryption setting and yielding some improvements to their original results as well. Keywords: Public-key encryption, deterministic encryption, lossy trapdoor functions, leftover hash lemma, standard model. ∗ College of Computing, Georgia Institute of Technology, 266 Ferst Drive, Atlanta, GA 30332, USA. -
Securing Threshold Cryptosystems Against Chosen Ciphertext Attack∗
Securing Threshold Cryptosystems against Chosen Ciphertext Attack∗ Victor Shoupy Rosario Gennaroz September 18, 2001 Abstract For the most compelling applications of threshold cryptosystems, security against chosen ciphertext attack is a requirement. However, prior to the results presented here, there appeared to be no practical threshold cryptosystems in the literature that were provably chosen-ciphertext secure, even in the idealized random oracle model. The contribution of this paper is to present two very practical threshold cryptosystems, and to prove that they are secure against chosen ciphertext attack in the random oracle model. Not only are these protocols computationally very efficient, but they are also non-interactive, which means they can be easily run over an asynchronous communication network. 1 Introduction In a threshold cryptosystem, the secret key of a public key cryptosystem is shared among a set of decryption servers, so that a quorum of servers can act together to decrypt a given ciphertext. Just as for ordinary, non-threshold cryptosystems, a natural and very useful notion of security is that of security against chosen ciphertext attack. In this paper, we consider the problem of designing threshold cryptosystems that are secure against chosen ciphertext attack. Our goal is to design a practical scheme, and provide strong evidence that it cannot be broken. Even though the most compelling applications of threshold cryptosystems seem to require chosen-ciphertext security, prior to the results presented here, there appeared to be no practi- cal threshold cryptosystems in the literature that were provably secure | even in the random oracle model, where one models a cryptographic hash function as a random oracle. -
Hash Functions and Thetitle NIST of Shapresentation-3 Competition
The First 30 Years of Cryptographic Hash Functions and theTitle NIST of SHAPresentation-3 Competition Bart Preneel COSIC/Kath. Univ. Leuven (Belgium) Session ID: CRYP-202 Session Classification: Hash functions decoded Insert presenter logo here on slide master Hash functions X.509 Annex D RIPEMD-160 MDC-2 SHA-256 SHA-3 MD2, MD4, MD5 SHA-512 SHA-1 This is an input to a crypto- graphic hash function. The input is a very long string, that is reduced by the hash function to a string of fixed length. There are 1A3FD4128A198FB3CA345932 additional security conditions: it h should be very hard to find an input hashing to a given value (a preimage) or to find two colliding inputs (a collision). Hash function history 101 DES RSA 1980 single block ad hoc length schemes HARDWARE MD2 MD4 1990 SNEFRU double MD5 block security SHA-1 length reduction for RIPEMD-160 factoring, SHA-2 2000 AES permu- DLOG, lattices Whirlpool SOFTWARE tations SHA-3 2010 Applications • digital signatures • data authentication • protection of passwords • confirmation of knowledge/commitment • micropayments • pseudo-random string generation/key derivation • construction of MAC algorithms, stream ciphers, block ciphers,… Agenda Definitions Iterations (modes) Compression functions SHA-{0,1,2,3} Bits and bytes 5 Hash function flavors cryptographic hash function this talk MAC MDC OWHF CRHF UOWHF (TCR) Security requirements (n-bit result) preimage 2nd preimage collision ? x ? ? ? h h h h h h(x) h(x) = h(x‘) h(x) = h(x‘) 2n 2n 2n/2 Informal definitions (1) • no secret parameters -
Hash Functions
11 Hash Functions Suppose you share a huge le with a friend, but you are not sure whether you both have the same version of the le. You could send your version of the le to your friend and they could compare to their version. Is there any way to check that involves less communication than this? Let’s call your version of the le x (a string) and your friend’s version y. The goal is to determine whether x = y. A natural approach is to agree on some deterministic function H, compute H¹xº, and send it to your friend. Your friend can compute H¹yº and, since H is deterministic, compare the result to your H¹xº. In order for this method to be fool-proof, we need H to have the property that dierent inputs always map to dierent outputs — in other words, H must be injective (1-to-1). Unfortunately, if H is injective and H : f0; 1gin ! f0; 1gout is injective, then out > in. This means that sending H¹xº is no better/shorter than sending x itself! Let us call a pair ¹x;yº a collision in H if x , y and H¹xº = H¹yº. An injective function has no collisions. One common theme in cryptography is that you don’t always need something to be impossible; it’s often enough for that thing to be just highly unlikely. Instead of saying that H should have no collisions, what if we just say that collisions should be hard (for polynomial-time algorithms) to nd? An H with this property will probably be good enough for anything we care about. -
Security of VSH in the Real World
Security of VSH in the Real World Markku-Juhani O. Saarinen Information Security Group Royal Holloway, University of London Egham, Surrey TW20 0EX, UK. [email protected] Abstract. In Eurocrypt 2006, Contini, Lenstra, and Steinfeld proposed a new hash function primitive, VSH, very smooth hash. In this brief paper we offer com- mentary on the resistance of VSH against some standard cryptanalytic attacks, in- cluding preimage attacks and collision search for a truncated VSH. Although the authors of VSH claim only collision resistance, we show why one must be very careful when using VSH in cryptographic engineering, where additional security properties are often required. 1 Introduction Many existing cryptographic hash functions were originally designed to be message di- gests for use in digital signature schemes. However, they are also often used as building blocks for other cryptographic primitives, such as pseudorandom number generators (PRNGs), message authentication codes, password security schemes, and for deriving keying material in cryptographic protocols such as SSL, TLS, and IPSec. These applications may use truncated versions of the hashes with an implicit as- sumption that the security of such a variant against attacks is directly proportional to the amount of entropy (bits) used from the hash result. An example of this is the HMAC−n construction in IPSec [1]. Some signature schemes also use truncated hashes. Hence we are driven to the following slightly nonstandard definition of security goals for a hash function usable in practice: 1. Preimage resistance. For essentially all pre-specified outputs X, it is difficult to find a message Y such that H(Y ) = X. -
A (Second) Preimage Attack on the GOST Hash Function
A (Second) Preimage Attack on the GOST Hash Function Florian Mendel, Norbert Pramstaller, and Christian Rechberger Institute for Applied Information Processing and Communications (IAIK), Graz University of Technology, Inffeldgasse 16a, A-8010 Graz, Austria [email protected] Abstract. In this article, we analyze the security of the GOST hash function with respect to (second) preimage resistance. The GOST hash function, defined in the Russian standard GOST-R 34.11-94, is an iter- ated hash function producing a 256-bit hash value. As opposed to most commonly used hash functions such as MD5 and SHA-1, the GOST hash function defines, in addition to the common iterated structure, a check- sum computed over all input message blocks. This checksum is then part of the final hash value computation. For this hash function, we show how to construct second preimages and preimages with a complexity of about 2225 compression function evaluations and a memory requirement of about 238 bytes. First, we show how to construct a pseudo-preimage for the compression function of GOST based on its structural properties. Second, this pseudo- preimage attack on the compression function is extended to a (second) preimage attack on the GOST hash function. The extension is possible by combining a multicollision attack and a meet-in-the-middle attack on the checksum. Keywords: cryptanalysis, hash functions, preimage attack 1 Introduction A cryptographic hash function H maps a message M of arbitrary length to a fixed-length hash value h. A cryptographic hash function has to fulfill the following security requirements: – Collision resistance: it is practically infeasible to find two messages M and M ∗, with M ∗ 6= M, such that H(M) = H(M ∗). -
The Hitchhiker's Guide to the SHA-3 Competition
History First Second Third The Hitchhiker’s Guide to the SHA-3 Competition Orr Dunkelman Computer Science Department 20 June, 2012 Orr Dunkelman The Hitchhiker’s Guide to the SHA-3 Competition 1/ 33 History First Second Third Outline 1 History of Hash Functions A(n Extremely) Short History of Hash Functions The Sad News about the MD/SHA Family 2 The First Phase of the SHA-3 Competition Timeline The SHA-3 First Round Candidates 3 The Second Round The Second Round Candidates The Second Round Process 4 The Third Round The Finalists Current Performance Estimates The Outcome of SHA-3 Orr Dunkelman The Hitchhiker’s Guide to the SHA-3 Competition 2/ 33 History First Second Third History Sad Outline 1 History of Hash Functions A(n Extremely) Short History of Hash Functions The Sad News about the MD/SHA Family 2 The First Phase of the SHA-3 Competition Timeline The SHA-3 First Round Candidates 3 The Second Round The Second Round Candidates The Second Round Process 4 The Third Round The Finalists Current Performance Estimates The Outcome of SHA-3 Orr Dunkelman The Hitchhiker’s Guide to the SHA-3 Competition 3/ 33 History First Second Third History Sad A(n Extremely) Short History of Hash Functions 1976 Diffie and Hellman suggest to use hash functions to make digital signatures shorter. 1979 Salted passwords for UNIX (Morris and Thompson). 1983/4 Davies/Meyer introduce Davies-Meyer. 1986 Fiat and Shamir use random oracles. 1989 Merkle and Damg˚ard present the Merkle-Damg˚ard hash function.