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Suppose I have given a number n. I want to find out all then even numbers which are less than n, and also have a greater exponent of 2 in its prime factorization than that of the exponent of 2 in the prime factorization of n.
if n=18 answer is 4 i.e, 4,8,12,16.
Using a for loop from i=2 to less than n and checking for every i will show time limit exceeded in the code.
My approach is to count no of times i will continue to divide by 2. But constraints of n=10^18. So, i think its a O (1) operation . Can anyone help me to find any formula or algorithm to find the answer as fast as possible?
First assume n is an odd number. Obviously every even number less than n also has a greater exponent of 2 in its factorization, so the answer will be equal to (n−1) / 2.
Now suppose n is equal to 2 times some odd number p. There are (p−1) / 2 even numbers that are smaller than p, so it follows that there are also (p−1) / 2 numbers smaller than n that are divisible by at least 22.
In general, given any number n that is equal to 2k times some odd number q, there will be (q−1) / 2 numbers that are smaller than n and have a larger exponent of 2 (> 2k) in their factorization.
So a function like this should work:
def count_smaller_numbers_with_greater_power_of_2_as_a_factor(n):
assert n > 0
while n % 2 == 0:
n >>= 1
return (n-1) // 2
Example 1 (n = 18)
Since n is even, keep dividing it by 2 until you get an odd number. This only takes one step (because n / 2 = 9)
Count the number of even numbers that are less than 9. This is equal to (9−1) / 2 = 4
Example 2 (n = 1018)
In this case, n = 218 × 518. So if we keep halving n until we get an odd number, the result will be 518.
The number of even numbers that are less than 518 is equal to (518−1) / 2 = 1907348632812
Your division is limited by constant number 64 (for 10^18~2^64), and O(64)=O(1) in complexity theory.
Number of two's in value factorization is equal to the number of trailing zero bits in binary representation of this value, so you can use bit operations (like & 1 and right shift shr, >>) to accelerate code a bit or apply some bit tricks
First, suppose n = 2^k * something. Find out k:
long k = 0;
while(n % 2 == 0) { n >>= 1; k++; }
n <<= k;
Now that you know who is k, multiply 2^k by 2 to get the first power of 2 greater than 2^k:
long next_power = 1 << (k + 1); // same as 2^(k + 1)
And lastly, check if n is odd. If it isn't, print all the multiples of next_power:
if(k == 0){ //equivalent to testing n % 2 == 0
for(long i = next_power; i < n; i += next_power) cout<<i<<endl;
}
EXAMPLE: n = 18
k will be 1, because 18 = 2^1 * 9 and the while will finish there.
next_power will be 4 (= 1 << (k + 1) = 2 ^ (k + 1)).
for(long i = next_power; i < n; i += next_power) cout<<i<<endl; will print 4, 8, 12 and 16.
This is very easy to do with a gcd trick i found:
You can find the count by //4. So 10^18 has
In [298]: pow(10,18)//4
Out[298]: 250000000000000000
You can find the count of 18 by //4 which is 4
Fan any numbers that meet your criteria. You can check by using my
algorithm here, and taking the len of the array and conpare with the
number div//4 to see that that is the answer your looking for: an exact
match. You'll notice that it's every four numbers that don't have an
exponent of 2. So the count of numbers can be found with //4.
import math
def lars_last_modulus_powers_of_two(hm):
return math.gcd(hm, 1<<hm.bit_length())
def findevennumberswithexponentgreaterthan2lessthannum(hm):
if hm %2 != 0:
return "only for use of even numbers"
vv = []
for x in range(hm,1,-2):
if lars_last_modulus_powers_of_two(x) != 2:
vv.append(x)
return vv
Result:
In [3132]: findevennumberswithexponentgreaterthan2lessthannum(18)
Out[3132]: [16, 12, 8, 4]
This is the fastest way to do it as you skip the mod down the path to get the answer. Instantly get the number you need with lars_last_modulus_powers_of_two(num) which is one operation per number.
Here is some example to show the answer is right:
In [302]: len(findevennumberswithexponentgreaterthan2lessthannum(100))
Out[302]: 25
In [303]: 100//4
Out[303]: 25
In [304]: len(findevennumberswithexponentgreaterthan2lessthannum(1000))
Out[304]: 250
In [305]: 1000//4
Out[305]: 250
In [306]: len(findevennumberswithexponentgreaterthan2lessthannum(23424))
Out[306]: 5856
In [307]: 23424//4
Out[307]: 5856
The question is, given a number D and a sequence of numbers with amount N, find the amount of the combinations of three numbers that have a highest difference value within it that does not exceed the value D. For example:
D = 3, N = 4
Sequence of numbers: 1 2 3 4
Possible combinations: 1 2 3 (3-1 = 2 <= D), 1 2 4 (4 - 1 = 3 <= D), 1 3 4, 2 3 4.
Output: 4
What I've done: link
Well my concept is: iterate through the whole sequence of numbers and find the smallest number that exceeds the D value when subtracted to the current compared number. Then, find the combinations between those two numbers with the currently compared number being a fixed value (which means combination of n [numbers between the two numbers] taken 2). If even the biggest number in the sequence subtracted with the currently compared number does not exceed D, then use a combination of the whole elements taken 3.
N can be as big as 10^5 with the smallest being 1 and D can be as big as 10^9 with the smallest being 1 too.
Problem with my algorithm: overflow occurs when I do a combination of the 1st element and 10^5th element. How can I fix this? Is there a way to calculate that large amount of combination without actually doing the factorials?
EDIT:
Overflow occurs when worst case happens: currently compared number is still in index 0 while all other numbers, when subtracted with the currently compared number, is still smaller than D. For example, the value of number at index 0 is 1, the value of number at index 10^5 is 10^5 + 1 and D is 10^9. Then, my algorithm will attempt to calculate the factorial of 10^5 - 0 which then overflows. The factorial will be used to calculate the combination of 10^5 taken 3.
When you seek for items in value range D in sorted list, and get index difference M, then you should calculate C(M,3).
But for such combination number you don't need to use huge factorials:
C(M,3) = M! / (6 * (M-3)!) = M * (M-1) * (M-2) / 6
To diminish intermediate results even more:
A = (M - 1) * (M - 2) / 2
A = (A * M) / 3
You didn't add the C++ tag to your question, so let me write the answer in Python 3 (it should be easy to translate it to C++):
N = int(input("N = "))
D = int(input("D = "))
v = [int(input("v[{}] = ".format(i))) for i in range (0, N)]
count = 0
i, j = 0, 1
while j + 1 < N:
j += 1
while v[j] - v[i] > D:
i += 1
d = j - i
if d >= 2:
count += (d - 1) * d // 2 # // is the integer division
print(count)
The idea is to move up the upper index of the triples j, while dragging the lower index i at the greatest distance j-i=d where v[j]-v[i]<=D. For each i-j pair, there are 1+2+3+...+d-1 possible triples keeping j fixed, i.e., (d-1)*d/2.
I'm given the array with n elements and I need to find k-th sum from sums of every pair n^2 in time complexity O(n*logn), sums are in ascending order.
Example input
In the first line are given number of elements and number of sum to find. In the second line list of number which sums of pair we need to generate.
3 6
1 4 6
The answer is 8 for given list, below is array of every pair of sums, where 8, sum of 4+4 is on the 6-th position.
2 5 5 7 7 8 10 10 12
where first three elements are genereted as follow
1+1 = 2
1+4 = 5
4+1 = 5
Edit:
I came up to this that the main problem is to find place for sum of elements with themselves. I will give example to make it more clear.
For sequence [1, 4, 10], we have
2 5 5 8 11 11 14 14 20
The problem is where to place sum of 4+4, that depends if 1+10 > 4+4, others sums have fixed place because second element + last will be always bigger than last + first (if we have elements in ascending order).
This can be solved in O(n log maxSum).
Pseudocode:
sort(array)
low = array[1] * 2
high = array[n] * 2
while (low <= high): (binarySearch between low and high)
mid = floor((high + low) / 2)
qty = checkHowManySumsAreEqualOrLessThan(mid)
if qty >= k:
high = mid - 1
else:
low = mid + 1
answer = low // low will be the first value of mid where qty was >= k. This means that on low - 1, qty was < k. This means the solution must be low
Sorting is O(n log n). Binary search costs log(array[n] * 2 - array[0] * 2).
checkHowManySumsAreEqualOrLessThan(mid) can be done in O(n) using 2 pointers, let me know if you can't figure out how.
This works because even though we are not doing the binary search over k, it is true that if there were x sums <= mid, if k < x then the kth sum would be lower than mid. Same for when k > x.
Thanks to juvian solving the hard parts, I was able to write this solution, the comments should explain it:
def count_sums_of_at_most(amount, nums1, nums2):
p1 = 0 # Pointer into the first array, start at the beginning
p2 = len(nums2) - 1 # Pointer into the second array, start at the end
# Move p1 up and p2 down, walking through the "diagonal" in O(n)
sum_count = 0
while p1 < len(nums1):
while amount < nums1[p1] + nums2[p2]:
p2 -= 1
if p2 < 0:
# p1 became too large, we are done
break
else:
# Found a valid p2 for the given p1
sum_count += p2 + 1
p1 += 1
continue
break
return sum_count
def find_sum(k, nums1, nums2):
# Sort both arrays, this runs in O(n * log(n))
nums1.sort()
nums2.sort()
# Binary search through all sums, runs in O(n * log(max_sum))
low = nums1[0] + nums2[0]
high = nums1[-1] + nums2[-1]
while low <= high:
mid = (high + low) // 2
sum_count = count_sums_of_at_most(mid, nums1, nums2)
if sum_count >= k:
high = mid - 1
else:
low = mid + 1
return low
arr = [1, 4, 5, 6]
for k in range(1, 1 + len(arr) ** 2):
print('sum', k, 'is', find_sum(k, arr, arr))
This prints:
sum 1 is 2
sum 2 is 5
sum 3 is 5
sum 4 is 6
sum 5 is 6
sum 6 is 7
sum 7 is 7
sum 8 is 8
sum 9 is 9
sum 10 is 9
sum 11 is 10
sum 12 is 10
sum 13 is 10
sum 14 is 11
sum 15 is 11
sum 16 is 12
Edit: this is O(n^2)
The way I understood the problem, the first number on the first row is the number of numbers, and the second number is k.
You can do this problem by using a PriorityQueue, which orders everything for you as you input numbers. Use 2 nested for loops such that they visit each pair once.
for(int k = 0; k < n; k++){
for(int j = 0; j <= k; j++){
If j==k, enter k+j into the PriorityQueue once, if not, enter the sum twice. Then, loop through the PriorityQueue to get he 6th value.
Will edit with full code if you'd like.
If a number is given as an input find sum of all the digits of number till that number
For example 11 is input then answer is 1+2....+9+(1+0)+(1+1)
The Brute-force method would be to calculate sum of digits of all the numbers that are less than a number.I have implemented that method iam wondering if there is any other way to do it without actually calculating sum of digits of every number
You can do that faster (in O(log n) operations). Let S(n) be the sum of the digits of all numbers 0 <= k < n. Then
S(10*n) = 10*S(n) + 45*n
because among the numbers less than 10*n, each k < n appears as the initial part of a number 10 times, with last digits 0, 1, ..., 9. So that contributes 45 for the sum of the last digits, and 10 times the sum of the digits of k.
Reversing that, we find
S(n) = 10*S(n/10) + 45*(n/10) + (n%10)*DS(n/10) + (n%10)*((n%10)-1)/2
where DS(k) is the plain digit sum of k. The first two terms come from the above, the remaining two come from the sum of the digits of n - n%10, ..., n - n%10 + (n%10 + 1).
Start is S(n) = 0 for n <= 1.
To include the upper bound, call it as S(n+1).
Let us take few examples.
sum(9) = 1 + 2 + 3 + 4 ........... + 9
= 9*10/2
= 45
sum(99) = 45 + (10 + 45) + (20 + 45) + ..... (90 + 45)
= 45*10 + (10 + 20 + 30 ... 90)
= 45*10 + 10(1 + 2 + ... 9)
= 45*10 + 45*10
= sum(9)*10 + 45*10
sum(999) = sum(99)*10 + 45*100
In general, we can compute sum(10d – 1) using below formula
sum(10d - 1) = sum(10d-1 - 1) * 10 + 45*(10d-1)
In below implementation, the above formula is implemented using dynamic programming as there are overlapping subproblems.
The above formula is one core step of the idea. Below is complete algorithm
Algorithm: sum(n)
1) Find number of digits minus one in n. Let this value be 'd'.
For 328, d is 2.
2) Compute some of digits in numbers from 1 to 10d - 1. Let this
sum be w. For 328, we compute sum of digits from 1 to 99 using
above formula.
3) Find Most significant digit (msd) in n. For 328, msd is 3.
4) Overall sum is sum of following terms
a) Sum of digits in 1 to "msd * 10d - 1". For 328, sum of
digits in numbers from 1 to 299.
For 328, we compute 3*sum(99) + (1 + 2)*100. Note that sum of
sum(299) is sum(99) + sum of digits from 100 to 199 + sum of digits
from 200 to 299.
Sum of 100 to 199 is sum(99) + 1*100 and sum of 299 is sum(99) + 2*100.
In general, this sum can be computed as w*msd + (msd*(msd-1)/2)*10d
b) Sum of digits in msd * 10d to n. For 328, sum of digits in
300 to 328.
For 328, this sum is computed as 3*29 + recursive call "sum(28)"
In general, this sum can be computed as msd * (n % (msd*10d) + 1)
+ sum(n % (10d))
Below is C++ implementation of above aglorithm.
// C++ program to compute sum of digits in numbers from 1 to n
#include<bits/stdc++.h>
using namespace std;
// Function to computer sum of digits in numbers from 1 to n
// Comments use example of 328 to explain the code
int sumOfDigitsFrom1ToN(int n)
{
// base case: if n<10 return sum of
// first n natural numbers
if (n<10)
return n*(n+1)/2;
// d = number of digits minus one in n. For 328, d is 2
int d = log10(n);
// computing sum of digits from 1 to 10^d-1,
// d=1 a[0]=0;
// d=2 a[1]=sum of digit from 1 to 9 = 45
// d=3 a[2]=sum of digit from 1 to 99 = a[1]*10 + 45*10^1 = 900
// d=4 a[3]=sum of digit from 1 to 999 = a[2]*10 + 45*10^2 = 13500
int *a = new int[d+1];
a[0] = 0, a[1] = 45;
for (int i=2; i<=d; i++)
a[i] = a[i-1]*10 + 45*ceil(pow(10,i-1));
// computing 10^d
int p = ceil(pow(10, d));
// Most significant digit (msd) of n,
// For 328, msd is 3 which can be obtained using 328/100
int msd = n/p;
// EXPLANATION FOR FIRST and SECOND TERMS IN BELOW LINE OF CODE
// First two terms compute sum of digits from 1 to 299
// (sum of digits in range 1-99 stored in a[d]) +
// (sum of digits in range 100-199, can be calculated as 1*100 + a[d]
// (sum of digits in range 200-299, can be calculated as 2*100 + a[d]
// The above sum can be written as 3*a[d] + (1+2)*100
// EXPLANATION FOR THIRD AND FOURTH TERMS IN BELOW LINE OF CODE
// The last two terms compute sum of digits in number from 300 to 328
// The third term adds 3*29 to sum as digit 3 occurs in all numbers
// from 300 to 328
// The fourth term recursively calls for 28
return msd*a[d] + (msd*(msd-1)/2)*p +
msd*(1+n%p) + sumOfDigitsFrom1ToN(n%p);
}
// Driver Program
int main()
{
int n = 328;
cout << "Sum of digits in numbers from 1 to " << n << " is "
<< sumOfDigitsFrom1ToN(n);
return 0;
}
Output
Sum of digits in numbers from 1 to 328 is 3241
We know that, each non negative decimal number can be represented uniquely by sum of Fibonacci numbers(here we are concerned about minimal representation i.e- no consecutive Fibonacci numbers are taken in the representation of a number and also each Fibonacci number is taken at most one in the representation).
For example:
1-> 1
2-> 10
3->100
4->101, here f1=1 , f2=2 and f(n)=f(n-1)+f(n-2);
so each decimal number can be represented in the Fibonacci system as a binary sequence. If we write all natural numbers successively in Fibonacci system, we will obtain a sequence like this: 110100101… This is called “Fibonacci bit sequence of natural numbers”.
My task is is counting the numbers of times that bit 1 appears in first N bits of this sequence.Since N can take value from 1 to 10^15,Can i do this without storing the Fibonacci sequence ?
for example: if N is 5,the answer is 3.
So this is just a preliminary sketch of an algorithm. It works when the upper bound is itself a Fibonacci number, but I'm not sure how to adapt it for general upper bounds. Hopefully someone can improve upon this.
The general idea is to look at the structure of the Fibonacci encodings. Here are the first few numbers:
0
1
10
100
101
1000
1001
1010
10000
10001
10010
10100
10101
100000
The invariant in each of these numbers is that there's never a pair of consecutive 1s. Given this invariant, we can increment from one number to the next using the following pattern:
If the last digit is 0, set it to 1.
If the last digit is 1, then since there aren't any consecutive 1s, set the last digit to 0 and the next digit to 1.
Eliminate any doubled 1s by setting them both to 0 and setting the next digit to a 1, repeating until all doubled 1s are eliminated.
The reason that this is important is that property (3) tells us something about the structure of these numbers. Let's revisit the first few Fibonacci-encoded numbers once more. Look, for example, at the first three numbers:
00
01
10
Now, look at all four-bit numbers:
1000
1001
1010
The next number will have five digits, as shown here:
1011 → 1100 → 10000
The interesting detail to notice is that the number of numbers with four digits is equal to the number of values with up to two digits. In fact, we get the four-digit numbers by just prefixing the at-most-two-digit-numbers with 10.
Now, look at three-digit numbers:
000
001
010
100
101
And look at five-digit numbers:
10000
10001
10010
10100
10101
Notice that the five-digit numbers are just the three-digit numbers with 10 prefixed.
This gives us a very interesting way for counting up how many 1s there are. Specifically, if you look at (k+2)-digit numbers, each of them is just a k-digit number with a 10 prefixed to it. This means that if there are B 1s total in all of the k-digit numbers, the number of Bs total in numbers that are just k+2 digits is equal to B plus the number of k-digit numbers, since we're just replaying the sequence with an extra 1 prepended to each number.
We can exploit this to compute the number of 1s in the Fibonacci codings that have at most k digits in them. The trick is as follows - if for each number of digits we keep track of
How many numbers have at most that many digits (call this N(d)), and
How many 1s are represented numbers with at most d digits (call this B(d)).
We can use this information to compute these two pieces of information for one more digit. It's a beautiful DP recurrence. Initially, we seed it as follows. For one digit, N(d) = 2 and B(d) is 1, since for one digit the numbers are 0 and 1. For two digits, N(d) = 3 (there's just one two-digit number, 10, and the two one-digit numbers 0 and 1) and B(d) is 2 (one from 1, one from 10). From there, we have that
N(d + 2) = N(d) + N(d + 1). This is because the number of numbers with up to d + 2 digits is the number of numbers with up to d + 1 digits (N(d + 1)), plus the numbers formed by prefixing 10 to numbers with d digits (N(d))
B(d + 2) = B(d + 1) + B(d) + N(d) (The number of total 1 bits in numbers of length at most d + 2 is the total number of 1 bits in numbers of length at most d + 1, plus the extra we get from numbers of just d + 2 digits)
For example, we get the following:
d N(d) B(d)
---------------------
1 2 1
2 3 2
3 5 5
4 8 10
5 13 20
We can actually check this. For 1-digit numbers, there are a total of 1 one bit used. For 2-digit numbers, there are two ones (1 and 10). For 3-digit numbers, there are five 1s (1, 10, 100, 101). For four-digit numbers, there are 10 ones (the five previous, plus 1000, 1001, 1010). Extending this outward gives us the sequence that we'd like.
This is extremely easy to compute - we can compute the value for k digits in time O(k) with just O(1) memory usage if we reuse space from before. Since the Fibonacci numbers grow exponentially quickly, this means that if we have some number N and want to find the sum of all 1s bits to the largest Fibonacci number smaller than N, we can do so in time O(log N) and space O(1).
That said, I'm not sure how to adapt this to work with general upper bounds. However, I'm optimistic that there is some way to do it. This is a beautiful recurrence and there just has to be a nice way to generalize it.
Hope this helps! Thanks for an awesome problem!
Lest solve 3 problems. Each next is harder then previous, each one uses result of previous.
1. How many ones are set if you write down every number from 0 to fib[i]-1.
Call this dp[i]. Lets look at the numbers
0
1
10
100
101
1000
1001
1010 <-- we want to count ones up to here
10000
If you write all numbers up to fib[i]-1, first you write all numbers up to fib[i-1]-1 (dp[i-1]), then you write the last block of numbers. There are exactly fib[i-2] of those numbers, each has a one on the first position, so we add fib[i-2], and if you erase those ones
000
001
010
then remove leading zeros, you can see that each number from 0 to fib[i-2]-1 is written down. Numbers of one there is equal to dp[i-2], which gives us:
dp[i] = fib[i-2] + dp[i-2] + dp[i-1];
2. How many ones are set if you write down every number from 0 to n.
0
1
10
100
101
1000
1001 <-- we want to count ones up to here
1010
Lets call this solNumber(n)
Suppose, that your number is f[i] + x, where f[i] is a maximum possible fibonacci number. Then anser if dp[i] + solNumber(x). This can be proved in the same way as in point 1.
3. How many ones are set in first n digits.
3a. How many numbers have representation length exactly l
if l = 1 the answer is 1, else its fib[l-2] + 1.
You can note, that if you erase leading ones and then all leading zeros you'll have each number from 0 to fib[l-1]-1. Exactly fib[l] numbers.
//End of 3a
Now you can find such number m than, if you write all numbers from 1 to m, their total length will be <=n. But if you write all from 1 to m+1, total length will be > n. Solve the problem manually for m+1 and add solNumber(m).
All 3 problems are solved in O(log n)
#include <iostream>
using namespace std;
#define FOR(i, a, b) for(int i = a; i < b; ++i)
#define RFOR(i, b, a) for(int i = b - 1; i >= a; --i)
#define REP(i, N) FOR(i, 0, N)
#define RREP(i, N) RFOR(i, N, 0)
typedef long long Long;
const int MAXL = 30;
long long fib[MAXL];
//How much ones are if you write down the representation of first fib[i]-1 natural numbers
long long dp[MAXL];
void buildDP()
{
fib[0] = 1;
fib[1] = 1;
FOR(i,2,MAXL)
fib[i] = fib[i-1] + fib[i-2];
dp[0] = 0;
dp[1] = 0;
dp[2] = 1;
FOR(i,3,MAXL)
dp[i] = fib[i-2] + dp[i-2] + dp[i-1];
}
//How much ones are if you write down the representation of first n natural numbers
Long solNumber(Long n)
{
if(n == 0)
return n;
Long res = 0;
RREP(i,MAXL)
if(n>=fib[i])
{
n -= fib[i];
res += dp[i];
res += (n+1);
}
return res;
}
int solManual(Long num, Long n)
{
int cr = 0;
RREP(i,MAXL)
{
if(n == 0)
break;
if(num>=fib[i])
{
num -= fib[i];
++cr;
}
if(cr != 0)
--n;
}
return cr;
}
Long num(int l)
{
if(l<=2)
return 1;
return fib[l-1];
}
Long sol(Long n)
{
//length of fibonacci representation
int l = 1;
//totatl acumulated length
int cl = 0;
while(num(l)*l + cl <= n)
{
cl += num(l)*l;
++l;
}
//Number of digits, that represent numbers with maxlength
Long nn = n - cl;
//Number of full numbers;
Long t = nn/l;
//The last full number
n = fib[l] + t-1;
return solNumber(n) + solManual(n+1, nn%l);
}
int main(int argc, char** argv)
{
ios_base::sync_with_stdio(false);
buildDP();
Long n;
while(cin>>n)
cout<<"ANS: "<<sol(n)<<endl;
return 0;
}
Compute m, the number responsible for the (N+1)th bit of the sequence. Compute the contribution of m to the count.
We have reduced the problem to counting the number of one bits in the range [1, m). In the style of interval trees, partition this range into O(log N) subranges, each having an associated glob like 10100???? that matches the representations of exactly the numbers belonging to that range. It is easy to compute the contribution of the prefixes.
We have reduced the problem to counting the total number T(k) of one bits in all Fibonacci words of length k (i.e., the ???? part of the globs). T(k) is given by the following recurrence.
T(0) = 0
T(1) = 1
T(k) = T(k - 1) + T(k - 2) + F(k - 2)
Mathematica says there's a closed form solution, but it looks awful and isn't needed for this polylog(N)-time algorithm.
This is not a full answer but it does outline how you can do this calculation without using brute force.
The Fibonacci representation of Fn is a 1 followed by n-1 zeros.
For the numbers from Fn up to but not including F(n+1), the number of 1's consists of two parts:
There are F(n-1) such numbers, so there are F(n-1) leading 1's.
The binary digits after the leading numbers are just the binary representations of all numbers up to but not including F(n-1).
So, if we call the total number of bits in the sequence up to but not including the nth Fibonacci number an, then we have the following recursion:
a(n+1) = an + F(n-1) + a(n-1)
You can also easily get the number of bits in the sequence up to Fn.
If it takes k Fibonacci numbers to get to (but not pass) N, then you can count those bits with the above formula, and after some further manipulation reduce the problem to counting the number of bits in the remaining sequence.
[Edit] : Basically I have followed the property that for any number n which is to be represented in fibonacci base, we can break it as n = n - x where x is the largest fibonacci just less than n. Using this property, any number can be broken in bit form.
First step is finding the decimal number such that Nth bit ends in it.
We can see that all numbers between fibonacci number F(n) and F(n+1) will have same number of bits. Using this, we can pre-calculate a table and find the appropriate number.
Lets say that you have the decimal number D at which there is the Nth bit.
Now, let X be the largest fibonacci number lesser than or equal to D.
To find set bits for all numbers from 1 to D we represnt it as ...
X+0, X+1, X+2, .... X + D-X. So, all the X will be repsented by 1 at the end and we have broken the problem into a much smaller sub-problem. That is, we need to find all set bits till D-X. We keep doing this recusively. Using the same logic, we can build a table which has appropriate number of set bits count for all fibonacci numbers (till limit). We would use this table for finding number of set bits from 1 to X.
So,
Findsetbits(D) { // finds number of set bits from 1 to D.
find X; // largest fibonacci number just less than D
ans = tablesetbits[X];
ans += 1 * (D-x+1); // All 1s at the end due to X+0,X+1,...
ans += Findsetbits(D-x);
return ans;
}
I tried some examples by hand and saw the pattern.
I have coded a rough solution which I have checked by hand for N <= 35. It works pretty fast for large numbers, though I can't be sure that it is correct. If it is an online judge problem, please give the link to it.
#include<iostream>
#include<vector>
#include<map>
#include<algorithm>
using namespace std;
#define pb push_back
typedef long long LL;
vector<LL>numbits;
vector<LL>fib;
vector<LL>numones;
vector<LL>cfones;
void init() {
fib.pb(1);
fib.pb(2);
int i = 2;
LL c = 1;
while ( c < 100000000000000LL ) {
c = fib[i-1] + fib[i-2];
i++;
fib.pb(c);
}
}
LL answer(LL n) {
if (n <= 3) return n;
int a = (lower_bound(fib.begin(),fib.end(),n))-fib.begin();
int c = 1;
if (fib[a] == n) {
c = 0;
}
LL ans = cfones[a-1-c] ;
return ans + answer(n - fib[a-c]) + 1 * (n - fib[a-c] + 1);
}
int fillarr(vector<int>& a, LL n) {
if (n == 0)return -1;
if (n == 1) {
a[0] = 1;
return 0;
}
int in = lower_bound(fib.begin(),fib.end(),n) - fib.begin(),v=0;
if (fib[in] != n) v = 1;
LL c = n - fib[in-v];
a[in-v] = 1;
fillarr(a, c);
return in-v;
}
int main() {
init();
numbits.pb(1);
int b = 2;
LL c;
for (int i = 1; i < fib.size()-2; i++) {
c = fib[i+1] - fib[i] ;
c = c*(LL)b;
b++;
numbits.pb(c);
}
for (int i = 1; i < numbits.size(); i++) {
numbits[i] += numbits[i-1];
}
numones.pb(1);
cfones.pb(1);
numones.pb(1);
cfones.pb(2);
numones.pb(1);
cfones.pb(5);
for (int i = 3; i < fib.size(); i++ ) {
LL c = 0;
c += cfones[i-2]+ 1 * fib[i-1];
numones.pb(c);
cfones.pb(c + cfones[i-1]);
}
for (int i = 1; i < numones.size(); i++) {
numones[i] += numones[i-1];
}
LL N;
cin>>N;
if (N == 1) {
cout<<1<<"\n";
return 0;
}
// find the integer just before Nth bit
int pos;
for (int i = 0;; i++) {
if (numbits[i] >= N) {
pos = i;
break;
}
}
LL temp = (N-numbits[pos-1])/(pos+1);
LL temp1 = (N-numbits[pos-1]);
LL num = fib[pos]-1 + (temp1>0?temp+(temp1%(pos+1)?1:0):0);
temp1 -= temp*(pos+1);
if(!temp1) temp1 = pos+1;
vector<int>arr(70,0);
int in = fillarr(arr, num);
int sub = 0;
for (int i = in-(temp1); i >= 0; i--) {
if (arr[i] == 1)
sub += 1;
}
cout<<"\nNumber answer "<<num<<" "<<answer(num) - sub<<"\n";
return 0;
}
Here is O((log n)^3).
Lets compute how many numbers fits in first N bits
Imagine that we have function:
long long number_of_all_bits_in_sequence(long long M);
It computes length of "Fibonacci bit sequence of natural numbers" created by all numbers that aren't greater than M.
With this function we could use binary search to find how many numbers fits in the first N bits.
How many bits are 1's in representation of first M numbers
Lets create function which calculates how many numbers <= M have 1 at k-th bit.
long long kth_bit_equal_1(long long M, int k);
First lets preprocess results of this function for all small values, lets say M <= 1000000.
Implementation for M > PREPROCESS_LIMIT:
long long kth_bit_equal_1(long long M, int k) {
if (M <= PREPROCESS_LIMIT) return preprocess_result[M][k];
long long fib_number = greatest_fib_which_isnt_greater_than(M);
int fib_index = index_of_fib_in_fibonnaci_sequence(fib);
if (fib_index < k) {
// all numbers are smaller than k-th fibbonacci number
return 0;
}
if (fib_index == k) {
// only numbers between [fib_number, M] have k-th bit set to 1
return M - fib_number + 1;
}
if (fib_index > k) {
long long result = 0;
// all numbers between [fib_number, M] have bit at fib_index set to 1
// so lets subtrack fib_number from all numbers in this interval
// now this interval is [0, M - fib_number]
// lets calculate how many numbers in this inteval have k-th bit set.
result += kth_bit_equal_1(M - fib_number, k);
// don't forget about remaining numbers (interval [1, fib_number - 1])
result += kth_bit_equal_1(fib_number - 1, k);
return result;
}
}
Complexity of this function is O(M / PREPROCESS_LIMIT).
Notice that in reccurence one of the addends is always one of fibbonaci numbers.
kth_bit_equal_1(fib_number - 1, k);
So if we memorize all computed results than complexity will improve to T(N) = T(N/2) + O(1) . T(n) = O(log N).
Lets get back to number_of_all_bits_in_sequence
We can slighly modify kth_bit_equal_1 so it would also count bits equal to 0.
Here's a way to count all the one digits in the set of numbers up to a given digit length bound. This seems to me to be a reasonable starting point for a solution
Consider 10 digits. Start by writing;
0000000000
Now we can turn some number of these zeros into ones, keeping the last digit always as a 0. Consider the possibilities case by case.
0 There's just one way to chose 0 of these to be ones. Summing the 1-bits in this one case gives 0.
1 There are {9 choose 1} ways to turn one of the zeros into a one. Each of these contributes 1.
2 There are {8 choose 2} ways to turn two of the zeros into ones. Each of these contributes 2.
...
5 There are {5 choose 5} ways to turn five of the zeros into ones. Each of these contributes 5 to the bit count.
It's easy to think of this as a tiling problem. The string of 10 zeros is a 10x1 board, which we want to tile with 1x1 squares and 2x1 dominoes. Choosing some number of the zeros to be ones is then the same as choosing some of the tiles to be dominoes. My solution is closely related to Identity 4 in "Proofs that really count" by Benjamin and Quinn.
Second step Now try to use the above construction to solve the original problem
Suppose we want to the one bits in the first 100100010 bits (the number is in Fibonacci representation of course). Start by overcounting the sum for all ways to replace the x's with zeros and ones in 10xxxxx0. To overcompensate for overcounting, subract the count for 10xxx0. Continue the procedure of overcounting and overcompensation.
This problem has a dynamic solution, as illustrated by the tested algorithm below.
Some points to keep in mind, which are evident in the code:
The best solution for each number i will be obtained by using the fibonacci number f where f == i
OR where f is less than i then it must be f and the greatest number n <= f: i = f+n.
Note that the fib sequence is memoized over the entire algorithm.
public static int[] fibonacciBitSequenceOfNaturalNumbers(int num) {
int[] setBits = new int[num + 1];
setBits[0] = 0;//anchor case of fib seq
setBits[1] = 1;//anchor case of fib seq
int a = 1, b = 1;//anchor case of fib seq
for (int i = 2; i <= num; i++) {
int c = b;
while (c < i) {
c = a + b;
a = b;
b = c;
}//fib
if (c == i) {
setBits[i] = 1;
continue;
}
c = a;
int tmp = c;//to optimize further, make tmp the fib before a
while (c + tmp != i) {
tmp--;
}
setBits[i] = 1 + setBits[tmp];
}//done
return setBits;
}
Test with:
public static void main(String... args) {
int[] arr = fibonacciBitSequenceOfNaturalNumbers(23);
//print result
for(int i=1; i<arr.length; i++)
System.out.format("%d has %d%n", i, arr[i]);
}
RESULT OF TEST: i has x set bits
1 has 1
2 has 1
3 has 1
4 has 2
5 has 1
6 has 2
7 has 2
8 has 1
9 has 2
10 has 2
11 has 2
12 has 3
13 has 1
14 has 2
15 has 2
16 has 2
17 has 3
18 has 2
19 has 3
20 has 3
21 has 1
22 has 2
23 has 2
EDIT BASED ON COMMENT:
//to return total number of set between 1 and n inclusive
//instead of returning as in original post, replace with this code
int total = 0;
for(int i: setBits)
total+=i;
return total;