Idea: BledDest
Tutorial
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Solution (BledDest)
#include<bits/stdc++.h>
using namespace std;
int main()
{
int t;
cin >> t;
for(int i = 0; i < t; i++)
{
int x, y;
cin >> x >> y;
int ans = max(x, y) * 2 - 1;
if(x == y) ans++;
cout << ans << endl;
}
}
Idea: adedalic
Tutorial
Tutorial is loading...
Solution (adedalic)
fun main() {
repeat(readLine()!!.toInt()) {
val n = readLine()!!.toInt()
val a = readLine()!!.split(' ').map { it.toLong() }
val k = maxOf(a.max()!!, (a.sum() + n - 2) / (n - 1))
println(k * (n - 1) - a.sum())
}
}
Idea: BledDest
Tutorial
Tutorial is loading...
Solution (pikmike)
def calc(s, x, y):
bal, cnt = 0, 0
for c in s:
if c == y:
if bal > 0:
bal -= 1
cnt += 1
elif c == x:
bal += 1
return cnt
for _ in range(int(input())):
s = input()
print(calc(s, '(', ')') + calc(s, '[', ']'))
Idea: BledDest
Tutorial
Tutorial is loading...
Solution (BledDest)
#include<bits/stdc++.h>
using namespace std;
const int MOD = 998244353;
int add(int x, int y)
{
x += y;
while(x >= MOD) x -= MOD;
while(x < 0) x += MOD;
return x;
}
int mul(int x, int y)
{
return (x * 1ll * y) % MOD;
}
int binpow(int x, int y)
{
int ans = 1;
while(y > 0)
{
if(y % 2 == 1)
ans = mul(ans, x);
x = mul(x, x);
y /= 2;
}
return ans;
}
int divide(int x, int y)
{
return mul(x, binpow(y, MOD - 2));
}
int main()
{
int n;
cin >> n;
vector<int> fib(n + 1);
fib[0] = 0;
fib[1] = 1;
for(int i = 2; i <= n; i++)
fib[i] = add(fib[i - 1], fib[i - 2]);
cout << divide(fib[n], binpow(2, n)) << endl;
}
Idea: BledDest
Tutorial
Tutorial is loading...
Solution (pikmike)
#include <bits/stdc++.h>
#define forn(i, n) for (int i = 0; i < int(n); i++)
using namespace std;
struct seg{
int l, r;
};
int main() {
int n, m, k;
cin >> n >> m >> k;
vector<seg> a(m);
forn(i, m){
cin >> a[i].l >> a[i].r;
--a[i].l;
}
sort(a.begin(), a.end(), [](const seg &a, const seg &b){
return a.l + a.r < b.l + b.r;
});
vector<int> su(m + 1);
forn(i, n - k + 1){
int cur = 0;
for (int j = m - 1; j >= 0; --j){
cur += max(0, min(i + k, a[j].r) - max(i, a[j].l));
su[j] = max(su[j], cur);
}
}
int ans = su[0];
forn(i, n - k + 1){
int cur = 0;
forn(j, m){
cur += max(0, min(i + k, a[j].r) - max(i, a[j].l));
ans = max(ans, cur + su[j + 1]);
}
}
cout << ans << endl;
return 0;
}
Idea: adedalic
Tutorial
Tutorial is loading...
Solution (adedalic)
#include<bits/stdc++.h>
using namespace std;
#define fore(i, l, r) for(int i = int(l); i < int(r); i++)
#define sz(a) int((a).size())
#define x first
#define y second
typedef long long li;
typedef long double ld;
typedef pair<int, int> pt;
template<class A, class B> ostream& operator <<(ostream& out, const pair<A, B> &p) {
return out << "(" << p.x << ", " << p.y << ")";
}
template<class A> ostream& operator <<(ostream& out, const vector<A> &v) {
out << "[";
fore(i, 0, sz(v)) {
if(i) out << ", ";
out << v[i];
}
return out << "]";
}
const int INF = int(1e9);
const li INF64 = li(1e18);
const ld EPS = 1e-9;
int n, q;
vector<li> cnt;
inline bool read() {
if(!(cin >> n >> q))
return false;
cnt.assign(n, 0);
fore (i, 0, n)
cin >> cnt[i];
return true;
}
inline void solve() {
fore (qs, 0, q) {
int tp, pos;
li val;
cin >> tp >> pos >> val;
if (tp == 1) {
cnt[pos] = val;
} else {
li small = 0, cur = 0;
fore (i, 0, pos + 1) {
small += cnt[i] * ((1ll << i) - 1);
val -= cnt[i];
}
if (val <= 0) {
cout << 0 << '\n';
continue;
}
int id = pos + 1;
while (id < n) {
li add = 1ll << (id - pos);
li need = min(val / add, cnt[id]);
cur += need * (add - 1);
val -= need * add;
small += need * add * ((1ll << pos) - 1);
if (need == cnt[id])
id++;
else
break;
}
if (val <= 0) {
cout << cur << '\n';
continue;
}
if (id >= n) {
cout << (val > small ? -1 : cur + val) << '\n';
continue;
}
li ans = INF64;
while (id > pos) {
if (small >= val)
ans = min(ans, cur + val);
cur++;
id--;
li add = 1ll << (id - pos);
if (val >= add) {
cur += add - 1;
val -= add;
small += add * ((1ll << pos) - 1);
}
}
assert(val <= 0);
cout << min(ans, cur) << endl;
}
}
}
int main() {
#ifdef _DEBUG
freopen("input.txt", "r", stdin);
int tt = clock();
#endif
ios_base::sync_with_stdio(false);
cin.tie(0), cout.tie(0);
cout << fixed << setprecision(15);
if(read()) {
solve();
#ifdef _DEBUG
cerr << "TIME = " << clock() - tt << endl;
tt = clock();
#endif
}
return 0;
}
Idea: adedalic
Tutorial
Tutorial is loading...
Solution 1 (pikmike)
#include <bits/stdc++.h>
#define forn(i, n) for (int i = 0; i < int(n); i++)
using namespace std;
int n;
vector<vector<int>> g;
vector<int> h, pcd, d;
vector<vector<int>> st, vals;
vector<int> a;
int dfs(int v, int s, int &cd, int p = -1){
int sum = 1;
for (int u : g[v]) if (h[u] == -1 && u != p)
sum += dfs(u, s, cd, v);
if (cd == -1 && (2 * sum >= s || p == -1))
cd = v;
return sum;
}
void build(int v, int s, int d, int p = -1){
int cd = -1;
dfs(v, s, cd);
h[cd] = d;
pcd[cd] = p;
for (int u : g[cd]) if (h[u] == -1)
build(u, s / 2, d + 1, cd);
}
vector<char> cur;
void calcd(int v, int p = -1){
for (int u : g[v]) if (u != p && cur[u]){
d[u] = d[v] + 1;
calcd(u, v);
}
}
vector<vector<int>> dist;
void init(){
a.resize(n, -1);
int k;
scanf("%d", &k);
queue<int> q;
forn(i, k){
int v;
scanf("%d", &v);
--v;
q.push(v);
a[v] = 0;
}
while (!q.empty()){
int v = q.front();
q.pop();
for (int u : g[v]) if (a[u] == -1){
a[u] = a[v] + 1;
q.push(u);
}
}
h.resize(n, -1);
pcd.resize(n);
build(0, n, 0);
st.resize(n);
vector<int> nd(n);
forn(v, n){
int u = v;
while (u != -1){
st[u].push_back(v);
if (pcd[u] != -1)
nd[pcd[u]] = max(nd[pcd[u]], nd[u] + 1);
u = pcd[u];
}
}
cur.resize(n);
vals.resize(n);
dist.resize(n);
vector<int> ord(n);
iota(ord.begin(), ord.end(), 0);
sort(ord.begin(), ord.end(), [&nd](int x, int y){
return nd[x] < nd[y];
});
d.resize(n);
for (int v : ord){
for (int u : st[v]) cur[u] = true;
d[v] = 0;
calcd(v);
int mx = 0;
for (int u : st[v]) mx = max(mx, d[u]);
vals[v].resize(mx + 1, 0);
for (int u : st[v]) vals[v][d[u]] = max(vals[v][d[u]], a[u]);
forn(j, mx) vals[v][j + 1] = max(vals[v][j + 1], vals[v][j]);
for (int u : st[v]) cur[u] = false;
for (int u : st[v]) dist[u].push_back(d[u]);
}
}
bool check(int v, int x){
for (int i = 0, u = v; u != -1; u = pcd[u], ++i)
if (x - dist[v][i] >= 0 && vals[u][min(int(vals[u].size()) - 1, x - dist[v][i])] > x)
return true;
return false;
}
int main() {
scanf("%d", &n);
g.resize(n);
forn(i, n - 1){
int v, u;
scanf("%d%d", &v, &u);
--v, --u;
g[v].push_back(u);
g[u].push_back(v);
}
init();
forn(v, n){
int res = 0;
int l = 0, r = n;
while (l <= r){
int m = (l + r) / 2;
if (check(v, m)){
res = m + 1;
l = m + 1;
}
else{
r = m - 1;
}
}
printf("%d ", res);
}
puts("");
}
Solution 2 (BledDest)
#include<bits/stdc++.h>
using namespace std;
const int N = 200043;
const int LN = 18;
vector<int> g[N];
vector<int> dist[N];
int sz[N];
int par[N];
bool used[N];
int max_dist[N];
vector<int> val[N];
int calc_size(int x, int p = -1)
{
sz[x] = 1;
for(auto y : g[x])
if(y != p && !used[y])
sz[x] += calc_size(y, x);
return sz[x];
}
int find_centroid(int x, int p, int s)
{
int ans = -1;
bool good = true;
for(auto y : g[x])
if(y != p && !used[y])
good &= sz[y] * 2 <= s;
else if(y == p && !used[y])
good &= (s - sz[x]) * 2 <= s;
if(good)
ans = x;
for(auto y : g[x])
if(y != p && !used[y])
ans = max(ans, find_centroid(y, x, s));
return ans;
}
void calc_dist(int x, int p, int d, int s)
{
dist[x].push_back(d);
for(auto y : g[x])
if(y != p && !used[y])
calc_dist(y, x, d + 1, s);
max_dist[s] = max(max_dist[s], d);
}
int decomposition(int v)
{
calc_size(v);
int c = find_centroid(v, v, sz[v]);
used[c] = true;
for(auto y : g[c])
if(!used[y])
{
par[decomposition(y)] = c;
}
used[c] = false;
calc_dist(c, c, 0, c);
return c;
}
int main()
{
int n;
scanf("%d", &n);
for(int i = 0; i < n - 1; i++)
{
int x, y;
scanf("%d %d", &x, &y);
--x;
--y;
g[x].push_back(y);
g[y].push_back(x);
}
decomposition(0);
for(int i = 0; i < n; i++)
val[i].resize(max_dist[i] + 1);
int k;
scanf("%d", &k);
vector<int> d(n, int(1e9));
queue<int> q;
for(int i = 0; i < k; i++)
{
int x;
scanf("%d", &x);
--x;
q.push(x);
d[x] = 0;
}
while(!q.empty())
{
int x = q.front();
q.pop();
for(auto y : g[x])
if(d[y] > d[x] + 1)
{
q.push(y);
d[y] = d[x] + 1;
}
}
for(int i = 0; i < n; i++)
{
if(d[i] == 0) continue;
int curc = i;
for(int j = 0; j < dist[i].size(); j++)
{
int dd = dist[i][j];
if(dd > d[i] - 1)
{
curc = par[curc];
continue;
}
dd = d[i] - 1 - dd;
if(dd >= val[curc].size())
dd = val[curc].size() - 1;
val[curc][dd] = max(val[curc][dd], d[i]);
curc = par[curc];
}
}
for(int i = 0; i < n; i++)
for(int j = max_dist[i]; j >= 1; j--)
val[i][j - 1] = max(val[i][j], val[i][j - 1]);
for(int i = 0; i < n; i++)
{
int ans = 0;
int curc = i;
for(int j = 0; j < dist[i].size(); j++)
{
int dd = dist[i][j];
ans = max(ans, val[curc][dd]);
curc = par[curc];
}
if(d[i] == 0)
ans = 0;
printf("%d%c", ans, " \n"[i == n - 1]);
}
}
What about rating updates?
I think, in tutorial G, Alice and Bob had been swapped. It's Alice who has one starting vertex, and it's Bob who chases her, not vice versa.
Oh, indeed. I've been told the problem with them reversed and I haven't read the actual statement haha. Will fix in a sec, thanks.
why i get tle in test case 20 of problem E
my submission : 99017296
logic
Comparator for sorting should follow strict weak ordering. If $$$a=b$$$ then it should always return false, otherwise it's undefined behavior.
thanks it work now .
If anyone didn't understand B. Here is an easy solution-
For solution to exist let us consider an element any index i.Then, for solution to exist we should be able to increment all values at all indexes to the max value in the array because we can't decrement the max value anyway.So solution boils down to two cases-
1. When
S<a[max]*n-1then the answer is just the difference of these two.2. If
S>a[max]*n-1 then (S-a[max]*n-1) should be equally divisible by (n-1), so just increment S until divisible by (n-1) and the answer is difference of the two.You can look at my submission here
I had exactly same thought process, https://codeforces.com/contest/1452/submission/98940264.
Yes, exactly we both used the same logic and so I thought it may help some people if they were thinking this logic but couldn't get it properly. Did I explain it clearly?
Nicely explain . Thanks
My code gives me wrong answer in test case 3 any one help Question no B
void solve() { ll n; cin>>n;
ll a[n]; ll mx = 0 ; for (ll i= 0;i<n;i++) { cin>>a[i] ; mx = max(mx, a[i]); } if (n==2) { cout<<0<<endl; return ; } ll sum = accumulate(a , a+n , 0) ; ll temp = mx*(n-1)*(1ll) ; if (sum == temp) cout<<0<<endl; else if(sum <temp) cout<<abs(sum-temp)<<endl; else { for (ll i=1;i<=100000;i++) { if (((n-1)*i*(1ll)) == sum) { cout<<0<<endl; return ; } else if (((n-1)*i*(1ll)) > sum) { cout<<(abs(n-1)*i*(1ll) - sum)<<endl; return; } } }}
use spoiler please
Try using 0ll, in std:: accumulate, otherwise it gives integer overflow.
Proof by Induction for problem D is great but can someone tell me if there is a mathematical proof for that?
If we have a tower with power p, it will cover 2p-1 spots, thus the length of the subsegment covered by a tower is always odd.Now we need to find a way to divide a length of n into a number of odd length subsegments. This can be done via dynammic programming, which reduces to finding the nth Fibonacci number. In the end , just divide this by 2^n.
I'm sorry but I didn't need the proof for the solution to this problem. I was wondering how did that function get reduced to just finding the Fibonacci number for a particular input.(which was proved by Induction by the Editorialist)
f(n) = f(n-1) + f(n-3) + f(n-5) + .... f(n-2) = f(n-3) + f(n-5) + .... thus f(n) = f(n-1) + f(n-2) Is this what you were looking for?
Yeah exactly, thanks for putting it that way. Made it so easy to understand.
i didnt get it, can you explain how that comment helped you? i m still confused
Just look at what he wrote:
f(n)= f(n-1) + f(n-3) + f(n-5) + .... The above equation should be sufficient to tell you why is this the answer to the problem. You can occupy 1,3,5 ... positions at a time let us call it k and question is reframed as finding the solution to the remaining f(n-k) values which is what the equation above tells.
Now, Just replace n by n-2 in the above equation and we get,
f(n-2) = f(n-3) + f(n-5) + .... This is just the same as f(n) without the f(n-1) part.
thus f(n) = f(n-1) + f(n-2)
Here's the intuitive proof I came up with while upsolving.
First let's solve it like a normal dp problem (forgetting about the fibonacci numbers). We sweep from left to right. Let $$$dp[i]$$$ mean the number of ways to cover only the first $$$i$$$ positions.
How do our transitions work? First, $$$dp[0] = 1$$$ because there is one way to cover the first $$$0$$$ positions (don't have any towers at all). Now loop over all i's (from left to right).
Consider the current $$$dp[i]$$$. We can cover some range with exactly one tower if and only if the length of the segment is odd (so we can put the tower in the midpoint). So $$$dp[i]$$$ is equal to the sum of all dp values where the index has a different parity than i (so $$$dp[i] = dp[i-1]+dp[i-3]+dp[i-5]...$$$). Though this would work, it runs in $$$O(n^2)$$$, so it needs to be optimized.
The optimization is pretty simple. Because you don't care about the actual values of all previous dp's but just the parity. So instead of storing the whole dp array, just have it store 2 values, $$$dp[0]$$$ and $$$dp[1]$$$. $$$dp[0]$$$ stores the numbers of ways to cover an even prefix, and $$$dp[1]$$$ stores the number of ways to cover an odd prefix.
You still loop from 1 to n but the transitions are now $$$dp[i \mod 2] = dp[i \mod 2] + dp[1-(i \mod 2)]$$$. This is exactly the Fibonacci recurrence.
Hope this was helpful! Thanks!
That's a really nice way to think about it. Thanks.
hey thanks for sharing your idea . I have implemented the same idea with bottom up DP. but i am not able to do the same with top down DP. Can you please help me with that ?
"We can cover some range with exactly one tower if and only if the length of the segment is odd (so we can put the tower in the midpoint). So dp[i] is equal to the sum of all dp values where the index has a different parity than i." I understood the first statement that we can cover some range with exactly one tower if and only if the length of the segment is odd but i am not able to understand from this how you drew the second statement as conclusion. Can you please explain?
consider a random state dp[9],now we can put one tower in 9th city and care about dp[8]. ( [1,2...8][9] ).then we can also cover 9th city if we put a tower in 8th city of power 2.then 8th city also covers 7 and 9 city( [1,2...6][7,8,9] )..so now we have to care about number of arrangement for the first 6 city.thus dp[9]=dp[8]+dp[6]+.....and so one..(i am 5months late posting this comment...dont if it does help anyone !)
my question might sound dumb but what about the configurations like [1,2...][5,6,7,8,9] where we can set a tower at 7 so as to power towers upto 9 just like you are talking about 8 to power 9.why are we neglecting that even part then...
I had a different approach to this problem which is quite intuitive imo. We are effectively choosing a subset out of $$$n$$$ towers such that the sum of powers of those towers cover the entire range $$$1-n$$$.This is equivalent to number of odd integral solutions of the equation $$$ p_1 + p_2 + ... + p_r = n $$$.This can be found out easily by converting it to the form $$$ (2*x_1 + 1) + (2*x_2 + 1) + .. + (2*x_r + 1) = n $$$ and finding non negative integral solution for $$$x_1 , x_2 ,... x_r$$$. Multiply this with the probability of choosing $$$r$$$ towers = $$$1/{2^{n}}$$$ to get the required answer solution
Thank you very much! It's a great solution.
i am sorry, this might sound dumb but in you solution , ncr(d+x-1,x-1) here what are you actually choosing and from what
number of non negative integral solutions of the equation $$$x_1 + x_2 + ... +x_r=d$$$ is $$$d+r-1\choose r-1$$$
great solution
Why this Solution do not get TLE in problem G? I solved only with bfs/dfs. There is some property?
As in Tutorial, this solution is at most $$$O(nlog^2n)$$$
In Problem D Editorial
How this statement is true?
Covering all towns can be expressed as splitting n into the sum of several positive odd integers
Anyone, Please Explain.
Each town that has power must power itself, and an equal number of towns either side of it.
Suppose it powers K towns to its left, then it must also power K towns to its right. So in total it powers 2*K+1 towns.
All the towers together power N towns, and the set is partitioned such that no town is powered twice. As such,
N = sum (i = 1 to j) (2*Ki + 1), where there are j towns receiving power directly, and the ith town powers Ki either side of it.
The numerator of the answer is the number of unique sets of j and K1,...,Kj such that the equality holds.
Thanks a lot. I got it now.
What is the logic of taking max of the array in calculation of k for B?
We need an end state where each of the n-1 boxes has exactly (TOTAL)/(n-1). Suppose we choose one of the non-max boxes to redistribute: then all the boxes must have at least the max starting value, since we cannot take any away. Therefore max*(n-1) is a lower bound for the total number.
yeah but why would there be atleast max in each box?
Because if there is one box with max, we can't take any out of this box (if redistributing from any of the others). So that box must finish with at least max, and we require all the boxes to finish with the same number, so they must also have at least max.
IN PROBLEM B Why (a.sum() + n — 2) / (n — 1) and not (a.sum()) / (n — 1) i didn't get it
the formula to get ceil of(x/y) is (x+(y-1))/y
Okk. But when I write ceil function, ceil(x/y), it throws an error, but writing (x+y-1)/y goes successful.
Maybe you forgot to cast long double/float/double type to this fraction. For example: ceil(5 / 2) = ceil(2) = 2, but ceil(5.0 / 2) = ceil(2.5) = 3.
But actually you should never try to use floating point numbers then use ceil, always opt to integer operations if possible.
Why does this give same results, in modular exponentiation?
than this
The only difference is we do
y=y%(mod-1)in the first function.Edit: figured it out its fermat's theorem, thanks everyone
Why don't people use spoiler while commenting there code?
Isn't your question obvious, let say we want to compute 2^123097521478997542 mod m, then what do you think will be faster computing 2^123097521478997542 mod m or first compute y mod m-1 which will be smaller than equal to y, then compute power?
The answer is obvious, but I remember there was a problem in which the input size it self exceeds mod-1 and everyone who did pow=pow%(mod-1) in advance got WA, be careful.
Why solutions with complexity O(nmk) can get AC for problem E? The example are below: submission 1 and submission 2
upd: submission 2 has been hacked with the result of WA. But no one could made it TLE during the hacking phase.
Can someone explain problem E's solution a bit more.Thanks in advance! xD!!
Problem E,why the solution is right?I spend a long time understanding the code,but can't prove it's correctness.The tutorial seems to ignore this.
you may think that algorithm is incorrect because of prefix and suffix and that one of them may contain some element which should have been in the other one but it doesn't matter because answer for cases like this will not be the final answer anyway because we are considering all possibilities and final answer will be the case where the conditions are satisfied.
oh!miaoa~zhenbuchuo!thank you for your reply!
Why i get tle for B?
submission : 99050069
whatever error you meet,you can see the data,the data you tle has sum=5e9,and n-1=4,and ma=1e9,your ma should add many times before you can break,so you tle
There is another nice approach to Problem D using combinatorics.
cin >> a >> b; cout << a + b + abs(a — b) — (a ^ b ? 1 : 0) << endl;
Please don't add codes like this
Why the divide function in problem D is mul(x, binpow(y, MOD — 2)) ? I understand the idea behind mul() and binpow(), but why they can perform the divide operation?
It uses Fermat's little theorem to calculate Modular multiplicative inverse.
Can anyone please tell me what's wrong in my solution for problem C. Submission : 99756850
Consider this case: )()( your solution will return 0 although the answer is 1; and cuz find() is O(n), it also will get TLE in huge cases.
nothing!
I have a $$$O(nm)$$$ solution for problem E. Basically, we do scanline. For each participant, we brute force over the left author, and see when can we have the left author as a winner for that participant, and then we do the same for right author. It's really cool IMO. 100792298
More expalnation for problem D :
Let's say S(n) is the set of ways to write n as a sum of odd numbers.
We can partition this set into two subsets: A(n) and B(n), where A(n) is the set of sums where the last summand is a 1, and B(n) is the set of all other sums.
you see that A(n) (last number always equal 1) has the same size as S(n−1). you see that B(n) (last two cities are joined to a previouse one) has the same size as S(n−2).
So, you find that |S(n)|=|A(n)|+|B(n)|=|S(n−1)|+|S(n−2)|, which is the Fibonacci recurrence relation. You can then prove by induction that your sequence is equal to the Fibonacci sequence.
Example: S(5)={1+1+1+1+1,1+1+3,1+3+1,3+1+1,5}, A(5)={1+1+1+1+1,1+3+1,3+1+1}, B(5)={1+1+3,5}. You can see that A(5) has the same size as S(4) and B(5) has the same size as S(3).